diff options
39 files changed, 1658 insertions, 133 deletions
diff --git a/Documentation/ABI/stable/sysfs-class-tpm b/Documentation/ABI/stable/sysfs-class-tpm
index 9f790eebb5d2..c0e23830f56a 100644
--- a/Documentation/ABI/stable/sysfs-class-tpm
+++ b/Documentation/ABI/stable/sysfs-class-tpm
@@ -116,7 +116,7 @@ Description: The "pubek" property will return the TPM's public endorsement
owner's authorization. Since the TPM driver doesn't store any
secrets, it can't authorize its own request for the pubek,
making it unaccessible. The public endorsement key is gener-
- ated at TPM menufacture time and exists for the life of the
+ ated at TPM manufacture time and exists for the life of the
Example output:
@@ -163,7 +163,7 @@ Date: April 2006
KernelVersion: 2.6.17
Description: The "temp_deactivated" property returns a '1' if the chip has
- been temporarily dectivated, usually until the next power
+ been temporarily deactivated, usually until the next power
cycle. Whether a warm boot (reboot) will clear a TPM chip
from a temp_deactivated state is platform specific.
diff --git a/Documentation/ABI/stable/sysfs-firmware-opal-elog b/Documentation/ABI/stable/sysfs-firmware-opal-elog
index e1f3058f5954..2536434d49d0 100644
--- a/Documentation/ABI/stable/sysfs-firmware-opal-elog
+++ b/Documentation/ABI/stable/sysfs-firmware-opal-elog
@@ -57,4 +57,4 @@ Description:
Shortly after acknowledging it, the log
entry will be removed from sysfs.
Reading this file will list the supported
- operations (curently just acknowledge). \ No newline at end of file
+ operations (currently just acknowledge).
diff --git a/Documentation/Changes b/Documentation/Changes
index f447f0516f07..ec97b77c8b00 100644
--- a/Documentation/Changes
+++ b/Documentation/Changes
@@ -44,6 +44,7 @@ o grub 0.93 # grub --version || grub-insta
o mcelog 0.6 # mcelog --version
o iptables 1.4.2 # iptables -V
o openssl & libcrypto 1.0.0 # openssl version
+o bc 1.06.95 # bc --version
Kernel compilation
diff --git a/Documentation/DMA-API-HOWTO.txt b/Documentation/DMA-API-HOWTO.txt
index 55b70b903ead..d69b3fc64e14 100644
--- a/Documentation/DMA-API-HOWTO.txt
+++ b/Documentation/DMA-API-HOWTO.txt
@@ -681,6 +681,11 @@ or:
as appropriate.
+PLEASE NOTE: The 'nents' argument to dma_sync_sg_for_cpu() and
+ dma_sync_sg_for_device() must be the same passed to
+ dma_map_sg(). It is _NOT_ the count returned by
+ dma_map_sg().
After the last DMA transfer call one of the DMA unmap routines
dma_unmap_{single,sg}(). If you don't touch the data from the first
dma_map_*() call till dma_unmap_*(), then you don't have to call the
diff --git a/Documentation/DMA-API.txt b/Documentation/DMA-API.txt
index edccacd4f048..8d065d6ec956 100644
--- a/Documentation/DMA-API.txt
+++ b/Documentation/DMA-API.txt
@@ -340,7 +340,7 @@ accessed sg->address and sg->length as shown above.
dma_unmap_sg(struct device *dev, struct scatterlist *sg,
- int nhwentries, enum dma_data_direction direction)
+ int nents, enum dma_data_direction direction)
Unmap the previously mapped scatter/gather list. All the parameters
must be the same as those and passed in to the scatter/gather mapping
@@ -356,10 +356,10 @@ void
dma_sync_single_for_device(struct device *dev, dma_addr_t dma_handle, size_t size,
enum dma_data_direction direction)
-dma_sync_sg_for_cpu(struct device *dev, struct scatterlist *sg, int nelems,
+dma_sync_sg_for_cpu(struct device *dev, struct scatterlist *sg, int nents,
enum dma_data_direction direction)
-dma_sync_sg_for_device(struct device *dev, struct scatterlist *sg, int nelems,
+dma_sync_sg_for_device(struct device *dev, struct scatterlist *sg, int nents,
enum dma_data_direction direction)
Synchronise a single contiguous or scatter/gather mapping for the CPU
diff --git a/Documentation/DocBook/.gitignore b/Documentation/DocBook/.gitignore
index 7ebd5465d927..e05da3f7aa21 100644
--- a/Documentation/DocBook/.gitignore
+++ b/Documentation/DocBook/.gitignore
@@ -11,5 +11,7 @@
diff --git a/Documentation/DocBook/Makefile b/Documentation/DocBook/Makefile
index 93eff64387cd..d2544961b67a 100644
--- a/Documentation/DocBook/Makefile
+++ b/Documentation/DocBook/Makefile
@@ -69,6 +69,12 @@ installmandocs: mandocs
KERNELDOCXMLREF = $(srctree)/scripts/kernel-doc-xml-ref
KERNELDOC = $(srctree)/scripts/kernel-doc
DOCPROC = $(objtree)/scripts/docproc
+CHECK_LC_CTYPE = $(objtree)/scripts/check-lc_ctype
+# Use a fixed encoding - UTF-8 if the C library has support built-in
+# or ASCII if not
+LC_CTYPE := $(call try-run, LC_CTYPE=C.UTF-8 $(CHECK_LC_CTYPE),C.UTF-8,C)
+export LC_CTYPE
XMLTOFLAGS = -m $(srctree)/$(src)/stylesheet.xsl
XMLTOFLAGS += --skip-validation
diff --git a/Documentation/SubmittingPatches b/Documentation/SubmittingPatches
index fd89b04d34f0..4710e4afef19 100644
--- a/Documentation/SubmittingPatches
+++ b/Documentation/SubmittingPatches
@@ -659,8 +659,8 @@ succinct and descriptive, but that is what a well-written summary
should do.
The "summary phrase" may be prefixed by tags enclosed in square
-brackets: "Subject: [PATCH tag] <summary phrase>". The tags are not
-considered part of the summary phrase, but describe how the patch
+brackets: "Subject: [PATCH <tag>...] <summary phrase>". The tags are
+not considered part of the summary phrase, but describe how the patch
should be treated. Common tags might include a version descriptor if
the multiple versions of the patch have been sent out in response to
comments (i.e., "v1, v2, v3"), or "RFC" to indicate a request for
@@ -672,8 +672,8 @@ the patch series.
A couple of example Subjects:
- Subject: [patch 2/5] ext2: improve scalability of bitmap searching
- Subject: [PATCHv2 001/207] x86: fix eflags tracking
+ Subject: [PATCH 2/5] ext2: improve scalability of bitmap searching
+ Subject: [PATCH v2 01/27] x86: fix eflags tracking
The "from" line must be the very first line in the message body,
and has the form:
diff --git a/Documentation/blockdev/zram.txt b/Documentation/blockdev/zram.txt
index 62435bb25266..5bda5031c83d 100644
--- a/Documentation/blockdev/zram.txt
+++ b/Documentation/blockdev/zram.txt
@@ -14,8 +14,43 @@ Statistics for individual zram devices are exported through sysfs nodes at
* Usage
+There are several ways to configure and manage zram device(-s):
+a) using zram and zram_control sysfs attributes
+b) using zramctl utility, provided by util-linux (
+In this document we will describe only 'manual' zram configuration steps,
+IOW, zram and zram_control sysfs attributes.
+In order to get a better idea about zramctl please consult util-linux
+documentation, zramctl man-page or `zramctl --help'. Please be informed
+that zram maintainers do not develop/maintain util-linux or zramctl, should
+you have any questions please contact
Following shows a typical sequence of steps for using zram.
+For the sake of simplicity we skip error checking parts in most of the
+examples below. However, it is your sole responsibility to handle errors.
+zram sysfs attributes always return negative values in case of errors.
+The list of possible return codes:
+-EBUSY -- an attempt to modify an attribute that cannot be changed once
+the device has been initialised. Please reset device first;
+-ENOMEM -- zram was not able to allocate enough memory to fulfil your
+-EINVAL -- invalid input has been provided.
+If you use 'echo', the returned value that is changed by 'echo' utility,
+and, in general case, something like:
+ echo 3 > /sys/block/zram0/max_comp_streams
+ if [ $? -ne 0 ];
+ handle_error
+ fi
+should suffice.
1) Load Module:
modprobe zram num_devices=4
This creates 4 devices: /dev/zram{0,1,2,3}
@@ -47,7 +82,7 @@ max_comp_streams adjustment.
3) Select compression algorithm
Using comp_algorithm device attribute one can see available and
- currently selected (shown in square brackets) compression algortithms,
+ currently selected (shown in square brackets) compression algorithms,
change selected compression algorithm (once the device is initialised
there is no way to change compression algorithm).
@@ -119,7 +154,7 @@ execute
8) Stats:
Per-device statistics are exported as various nodes under /sys/block/zram<id>/
-A brief description of exported device attritbutes. For more details please
+A brief description of exported device attributes. For more details please
read Documentation/ABI/testing/sysfs-block-zram.
Name access description
@@ -140,8 +175,9 @@ zero_pages RO the number of zero filled pages written to this disk
orig_data_size RO uncompressed size of data stored in this disk
compr_data_size RO compressed size of data stored in this disk
mem_used_total RO the amount of memory allocated for this disk
-mem_used_max RW the maximum amount memory zram have consumed to
- store compressed data
+mem_used_max RW the maximum amount of memory zram have consumed to
+ store the data (to reset this counter to the actual
+ current value, write 1 to this attribute)
mem_limit RW the maximum amount of memory ZRAM can use to store
the compressed data
pages_compacted RO the number of pages freed during compaction
diff --git a/Documentation/cgroups/blkio-controller.txt b/Documentation/cgroups/blkio-controller.txt
index 12686bec37b9..52fa9f353342 100644
--- a/Documentation/cgroups/blkio-controller.txt
+++ b/Documentation/cgroups/blkio-controller.txt
@@ -59,7 +59,7 @@ cgroups. Here is what you can do.
- At macro level, first dd should finish first. To get more precise data, keep
on looking at (with the help of script), at blkio.disk_time and
blkio.disk_sectors files of both test1 and test2 groups. This will tell how
- much disk time (in milli seconds), each group got and how many secotors each
+ much disk time (in milliseconds), each group got and how many sectors each
group dispatched to the disk. We provide fairness in terms of disk time, so
ideally io.disk_time of cgroups should be in proportion to the weight.
diff --git a/Documentation/cgroups/freezer-subsystem.txt b/Documentation/cgroups/freezer-subsystem.txt
index c96a72cbb30a..e831cb2b8394 100644
--- a/Documentation/cgroups/freezer-subsystem.txt
+++ b/Documentation/cgroups/freezer-subsystem.txt
@@ -50,7 +50,7 @@ being frozen. This allows the bash example above and gdb to run as
The cgroup freezer is hierarchical. Freezing a cgroup freezes all
-tasks beloning to the cgroup and all its descendant cgroups. Each
+tasks belonging to the cgroup and all its descendant cgroups. Each
cgroup has its own state (self-state) and the state inherited from the
parent (parent-state). Iff both states are THAWED, the cgroup is
diff --git a/Documentation/cgroups/unified-hierarchy.txt b/Documentation/cgroups/unified-hierarchy.txt
index 0cd27a4e0055..781b1d475bcf 100644
--- a/Documentation/cgroups/unified-hierarchy.txt
+++ b/Documentation/cgroups/unified-hierarchy.txt
@@ -494,7 +494,7 @@ may be specified in any order and not all pairs have to be specified.
${R|W}BPS are read/write bytes per second and ${R|W}IOPS are
read/write IOs per second. "max" indicates no limit. Writing
to the file follows the same format but the individual
- settings may be ommitted or specified in any order.
+ settings may be omitted or specified in any order.
This file is available only on non-root cgroups.
diff --git a/Documentation/email-clients.txt b/Documentation/email-clients.txt
index 3fa450881ecb..aba85b39a400 100644
--- a/Documentation/email-clients.txt
+++ b/Documentation/email-clients.txt
@@ -220,7 +220,7 @@ to coerce it into behaving.
Compose dialog.
Please note that "external editor" requires that your editor must not
- fork, or in other words, the editor must not return before closing.
+ fork, or in other words, the editor must not return before closing.
You may have to pass additional flags or change the settings of your
editor. Most notably if you are using gvim then you must pass the -f
option to gvim by putting "/usr/bin/gvim -f" (if the binary is in
diff --git a/Documentation/filesystems/ b/Documentation/filesystems/
new file mode 100644
index 000000000000..1b39e084a2b2
--- /dev/null
+++ b/Documentation/filesystems/
@@ -0,0 +1,1297 @@
+<style> p { max-width:50em} ol, ul {max-width: 40em}</style>
+Pathname lookup in Linux.
+This write-up is based on three articles published at
+- <> Pathname lookup in Linux
+- <> RCU-walk: faster pathname lookup in Linux
+- <> A walk among the symlinks
+Written by Neil Brown with help from Al Viro and Jon Corbet.
+The most obvious aspect of pathname lookup, which very little
+exploration is needed to discover, is that it is complex. There are
+many rules, special cases, and implementation alternatives that all
+combine to confuse the unwary reader. Computer science has long been
+acquainted with such complexity and has tools to help manage it. One
+tool that we will make extensive use of is "divide and conquer". For
+the early parts of the analysis we will divide off symlinks - leaving
+them until the final part. Well before we get to symlinks we have
+another major division based on the VFS's approach to locking which
+will allow us to review "REF-walk" and "RCU-walk" separately. But we
+are getting ahead of ourselves. There are some important low level
+distinctions we need to clarify first.
+There are two sorts of ...
+Pathnames (sometimes "file names"), used to identify objects in the
+filesystem, will be familiar to most readers. They contain two sorts
+of elements: "slashes" that are sequences of one or more "`/`"
+characters, and "components" that are sequences of one or more
+non-"`/`" characters. These form two kinds of paths. Those that
+start with slashes are "absolute" and start from the filesystem root.
+The others are "relative" and start from the current directory, or
+from some other location specified by a file descriptor given to a
+"xxx`at`" system call such as "[`openat()`]".
+It is tempting to describe the second kind as starting with a
+component, but that isn't always accurate: a pathname can lack both
+slashes and components, it can be empty, in other words. This is
+generally forbidden in POSIX, but some of those "xxx`at`" system calls
+in Linux permit it when the `AT_EMPTY_PATH` flag is given. For
+example, if you have an open file descriptor on an executable file you
+can execute it by calling [`execveat()`] passing the file descriptor,
+an empty path, and the `AT_EMPTY_PATH` flag.
+These paths can be divided into two sections: the final component and
+everything else. The "everything else" is the easy bit. In all cases
+it must identify a directory that already exists, otherwise an error
+such as `ENOENT` or `ENOTDIR` will be reported.
+The final component is not so simple. Not only do different system
+calls interpret it quite differently (e.g. some create it, some do
+not), but it might not even exist: neither the empty pathname nor the
+pathname that is just slashes have a final component. If it does
+exist, it could be "`.`" or "`..`" which are handled quite differently
+from other components.
+If a pathname ends with a slash, such as "`/tmp/foo/`" it might be
+tempting to consider that to have an empty final component. In many
+ways that would lead to correct results, but not always. In
+particular, `mkdir()` and `rmdir()` each create or remove a directory named
+by the final component, and they are required to work with pathnames
+ending in "`/`". According to [POSIX]
+> A pathname that contains at least one non- &lt;slash> character and
+> that ends with one or more trailing &lt;slash> characters shall not
+> be resolved successfully unless the last pathname component before
+> the trailing <slash> characters names an existing directory or a
+> directory entry that is to be created for a directory immediately
+> after the pathname is resolved.
+The Linux pathname walking code (mostly in `fs/namei.c`) deals with
+all of these issues: breaking the path into components, handling the
+"everything else" quite separately from the final component, and
+checking that the trailing slash is not used where it isn't
+permitted. It also addresses the important issue of concurrent
+While one process is looking up a pathname, another might be making
+changes that affect that lookup. One fairly extreme case is that if
+"a/b" were renamed to "a/c/b" while another process were looking up
+"a/b/..", that process might successfully resolve on "a/c".
+Most races are much more subtle, and a big part of the task of
+pathname lookup is to prevent them from having damaging effects. Many
+of the possible races are seen most clearly in the context of the
+"dcache" and an understanding of that is central to understanding
+pathname lookup.
+More than just a cache.
+The "dcache" caches information about names in each filesystem to
+make them quickly available for lookup. Each entry (known as a
+"dentry") contains three significant fields: a component name, a
+pointer to a parent dentry, and a pointer to the "inode" which
+contains further information about the object in that parent with
+the given name. The inode pointer can be `NULL` indicating that the
+name doesn't exist in the parent. While there can be linkage in the
+dentry of a directory to the dentries of the children, that linkage is
+not used for pathname lookup, and so will not be considered here.
+The dcache has a number of uses apart from accelerating lookup. One
+that will be particularly relevant is that it is closely integrated
+with the mount table that records which filesystem is mounted where.
+What the mount table actually stores is which dentry is mounted on top
+of which other dentry.
+When considering the dcache, we have another of our "two types"
+distinctions: there are two types of filesystems.
+Some filesystems ensure that the information in the dcache is always
+completely accurate (though not necessarily complete). This can allow
+the VFS to determine if a particular file does or doesn't exist
+without checking with the filesystem, and means that the VFS can
+protect the filesystem against certain races and other problems.
+These are typically "local" filesystems such as ext3, XFS, and Btrfs.
+Other filesystems don't provide that guarantee because they cannot.
+These are typically filesystems that are shared across a network,
+whether remote filesystems like NFS and 9P, or cluster filesystems
+like ocfs2 or cephfs. These filesystems allow the VFS to revalidate
+cached information, and must provide their own protection against
+awkward races. The VFS can detect these filesystems by the
+`DCACHE_OP_REVALIDATE` flag being set in the dentry.
+REF-walk: simple concurrency management with refcounts and spinlocks
+With all of those divisions carefully classified, we can now start
+looking at the actual process of walking along a path. In particular
+we will start with the handling of the "everything else" part of a
+pathname, and focus on the "REF-walk" approach to concurrency
+management. This code is found in the `link_path_walk()` function, if
+you ignore all the places that only run when "`LOOKUP_RCU`"
+(indicating the use of RCU-walk) is set.
+[Meet the Lockers]:
+REF-walk is fairly heavy-handed with locks and reference counts. Not
+as heavy-handed as in the old "big kernel lock" days, but certainly not
+afraid of taking a lock when one is needed. It uses a variety of
+different concurrency controls. A background understanding of the
+various primitives is assumed, or can be gleaned from elsewhere such
+as in [Meet the Lockers].
+The locking mechanisms used by REF-walk include:
+### dentry->d_lockref ###
+This uses the lockref primitive to provide both a spinlock and a
+reference count. The special-sauce of this primitive is that the
+conceptual sequence "lock; inc_ref; unlock;" can often be performed
+with a single atomic memory operation.
+Holding a reference on a dentry ensures that the dentry won't suddenly
+be freed and used for something else, so the values in various fields
+will behave as expected. It also protects the `->d_inode` reference
+to the inode to some extent.
+The association between a dentry and its inode is fairly permanent.
+For example, when a file is renamed, the dentry and inode move
+together to the new location. When a file is created the dentry will
+initially be negative (i.e. `d_inode` is `NULL`), and will be assigned
+to the new inode as part of the act of creation.
+When a file is deleted, this can be reflected in the cache either by
+setting `d_inode` to `NULL`, or by removing it from the hash table
+(described shortly) used to look up the name in the parent directory.
+If the dentry is still in use the second option is used as it is
+perfectly legal to keep using an open file after it has been deleted
+and having the dentry around helps. If the dentry is not otherwise in
+use (i.e. if the refcount in `d_lockref` is one), only then will
+`d_inode` be set to `NULL`. Doing it this way is more efficient for a
+very common case.
+So as long as a counted reference is held to a dentry, a non-`NULL` `->d_inode`
+value will never be changed.
+### dentry->d_lock ###
+`d_lock` is a synonym for the spinlock that is part of `d_lockref` above.
+For our purposes, holding this lock protects against the dentry being
+renamed or unlinked. In particular, its parent (`d_parent`), and its
+name (`d_name`) cannot be changed, and it cannot be removed from the
+dentry hash table.
+When looking for a name in a directory, REF-walk takes `d_lock` on
+each candidate dentry that it finds in the hash table and then checks
+that the parent and name are correct. So it doesn't lock the parent
+while searching in the cache; it only locks children.
+When looking for the parent for a given name (to handle "`..`"),
+REF-walk can take `d_lock` to get a stable reference to `d_parent`,
+but it first tries a more lightweight approach. As seen in
+`dget_parent()`, if a reference can be claimed on the parent, and if
+subsequently `d_parent` can be seen to have not changed, then there is
+no need to actually take the lock on the child.
+### rename_lock ###
+Looking up a given name in a given directory involves computing a hash
+from the two values (the name and the dentry of the directory),
+accessing that slot in a hash table, and searching the linked list
+that is found there.
+When a dentry is renamed, the name and the parent dentry can both
+change so the hash will almost certainly change too. This would move the
+dentry to a different chain in the hash table. If a filename search
+happened to be looking at a dentry that was moved in this way,
+it might end up continuing the search down the wrong chain,
+and so miss out on part of the correct chain.
+The name-lookup process (`d_lookup()`) does _not_ try to prevent this
+from happening, but only to detect when it happens.
+`rename_lock` is a seqlock that is updated whenever any dentry is
+renamed. If `d_lookup` finds that a rename happened while it
+unsuccessfully scanned a chain in the hash table, it simply tries
+### inode->i_mutex ###
+`i_mutex` is a mutex that serializes all changes to a particular
+directory. This ensures that, for example, an `unlink()` and a `rename()`
+cannot both happen at the same time. It also keeps the directory
+stable while the filesystem is asked to look up a name that is not
+currently in the dcache.
+This has a complementary role to that of `d_lock`: `i_mutex` on a
+directory protects all of the names in that directory, while `d_lock`
+on a name protects just one name in a directory. Most changes to the
+dcache hold `i_mutex` on the relevant directory inode and briefly take
+`d_lock` on one or more the dentries while the change happens. One
+exception is when idle dentries are removed from the dcache due to
+memory pressure. This uses `d_lock`, but `i_mutex` plays no role.
+The mutex affects pathname lookup in two distinct ways. Firstly it
+serializes lookup of a name in a directory. `walk_component()` uses
+`lookup_fast()` first which, in turn, checks to see if the name is in the cache,
+using only `d_lock` locking. If the name isn't found, then `walk_component()`
+falls back to `lookup_slow()` which takes `i_mutex`, checks again that
+the name isn't in the cache, and then calls in to the filesystem to get a
+definitive answer. A new dentry will be added to the cache regardless of
+the result.
+Secondly, when pathname lookup reaches the final component, it will
+sometimes need to take `i_mutex` before performing the last lookup so
+that the required exclusion can be achieved. How path lookup chooses
+to take, or not take, `i_mutex` is one of the
+issues addressed in a subsequent section.
+### mnt->mnt_count ###
+`mnt_count` is a per-CPU reference counter on "`mount`" structures.
+Per-CPU here means that incrementing the count is cheap as it only
+uses CPU-local memory, but checking if the count is zero is expensive as
+it needs to check with every CPU. Taking a `mnt_count` reference
+prevents the mount structure from disappearing as the result of regular
+unmount operations, but does not prevent a "lazy" unmount. So holding
+`mnt_count` doesn't ensure that the mount remains in the namespace and,
+in particular, doesn't stabilize the link to the mounted-on dentry. It
+does, however, ensure that the `mount` data structure remains coherent,
+and it provides a reference to the root dentry of the mounted
+filesystem. So a reference through `->mnt_count` provides a stable
+reference to the mounted dentry, but not the mounted-on dentry.
+### mount_lock ###
+`mount_lock` is a global seqlock, a bit like `rename_lock`. It can be used to
+check if any change has been made to any mount points.
+While walking down the tree (away from the root) this lock is used when
+crossing a mount point to check that the crossing was safe. That is,
+the value in the seqlock is read, then the code finds the mount that
+is mounted on the current directory, if there is one, and increments
+the `mnt_count`. Finally the value in `mount_lock` is checked against
+the old value. If there is no change, then the crossing was safe. If there
+was a change, the `mnt_count` is decremented and the whole process is
+When walking up the tree (towards the root) by following a ".." link,
+a little more care is needed. In this case the seqlock (which
+contains both a counter and a spinlock) is fully locked to prevent
+any changes to any mount points while stepping up. This locking is
+needed to stabilize the link to the mounted-on dentry, which the
+refcount on the mount itself doesn't ensure.
+### RCU ###
+Finally the global (but extremely lightweight) RCU read lock is held
+from time to time to ensure certain data structures don't get freed
+In particular it is held while scanning chains in the dcache hash
+table, and the mount point hash table.
+Bringing it together with `struct nameidata`
+[First edition Unix]:
+Throughout the process of walking a path, the current status is stored
+in a `struct nameidata`, "namei" being the traditional name - dating
+all the way back to [First Edition Unix] - of the function that
+converts a "name" to an "inode". `struct nameidata` contains (among
+other fields):
+### `struct path path` ###
+A `path` contains a `struct vfsmount` (which is
+embedded in a `struct mount`) and a `struct dentry`. Together these
+record the current status of the walk. They start out referring to the
+starting point (the current working directory, the root directory, or some other
+directory identified by a file descriptor), and are updated on each
+step. A reference through `d_lockref` and `mnt_count` is always
+### `struct qstr last` ###
+This is a string together with a length (i.e. _not_ `nul` terminated)
+that is the "next" component in the pathname.
+### `int last_type` ###
+This is one of `LAST_NORM`, `LAST_ROOT`, `LAST_DOT`, `LAST_DOTDOT`, or
+`LAST_BIND`. The `last` field is only valid if the type is
+`LAST_NORM`. `LAST_BIND` is used when following a symlink and no
+components of the symlink have been processed yet. Others should be
+fairly self-explanatory.
+### `struct path root` ###
+This is used to hold a reference to the effective root of the
+filesystem. Often that reference won't be needed, so this field is
+only assigned the first time it is used, or when a non-standard root
+is requested. Keeping a reference in the `nameidata` ensures that
+only one root is in effect for the entire path walk, even if it races
+with a `chroot()` system call.
+The root is needed when either of two conditions holds: (1) either the
+pathname or a symbolic link starts with a "'/'", or (2) a "`..`"
+component is being handled, since "`..`" from the root must always stay
+at the root. The value used is usually the current root directory of
+the calling process. An alternate root can be provided as when
+`sysctl()` calls `file_open_root()`, and when NFSv4 or Btrfs call
+`mount_subtree()`. In each case a pathname is being looked up in a very
+specific part of the filesystem, and the lookup must not be allowed to
+escape that subtree. It works a bit like a local `chroot()`.
+Ignoring the handling of symbolic links, we can now describe the
+"`link_path_walk()`" function, which handles the lookup of everything
+except the final component as:
+> Given a path (`name`) and a nameidata structure (`nd`), check that the
+> current directory has execute permission and then advance `name`
+> over one component while updating `last_type` and `last`. If that
+> was the final component, then return, otherwise call
+> `walk_component()` and repeat from the top.
+`walk_component()` is even easier. If the component is `LAST_DOTS`,
+it calls `handle_dots()` which does the necessary locking as already
+described. If it finds a `LAST_NORM` component it first calls
+"`lookup_fast()`" which only looks in the dcache, but will ask the
+filesystem to revalidate the result if it is that sort of filesystem.
+If that doesn't get a good result, it calls "`lookup_slow()`" which
+takes the `i_mutex`, rechecks the cache, and then asks the filesystem
+to find a definitive answer. Each of these will call
+`follow_managed()` (as described below) to handle any mount points.
+In the absence of symbolic links, `walk_component()` creates a new
+`struct path` containing a counted reference to the new dentry and a
+reference to the new `vfsmount` which is only counted if it is
+different from the previous `vfsmount`. It then calls
+`path_to_nameidata()` to install the new `struct path` in the
+`struct nameidata` and drop the unneeded references.
+This "hand-over-hand" sequencing of getting a reference to the new
+dentry before dropping the reference to the previous dentry may
+seem obvious, but is worth pointing out so that we will recognize its
+analogue in the "RCU-walk" version.
+Handling the final component.
+`link_path_walk()` only walks as far as setting `nd->last` and
+`nd->last_type` to refer to the final component of the path. It does
+not call `walk_component()` that last time. Handling that final
+component remains for the caller to sort out. Those callers are
+`path_lookupat()`, `path_parentat()`, `path_mountpoint()` and
+`path_openat()` each of which handles the differing requirements of
+different system calls.
+`path_parentat()` is clearly the simplest - it just wraps a little bit
+of housekeeping around `link_path_walk()` and returns the parent
+directory and final component to the caller. The caller will be either
+aiming to create a name (via `filename_create()`) or remove or rename
+a name (in which case `user_path_parent()` is used). They will use
+`i_mutex` to exclude other changes while they validate and then
+perform their operation.
+`path_lookupat()` is nearly as simple - it is used when an existing
+object is wanted such as by `stat()` or `chmod()`. It essentially just
+calls `walk_component()` on the final component through a call to
+`lookup_last()`. `path_lookupat()` returns just the final dentry.
+`path_mountpoint()` handles the special case of unmounting which must
+not try to revalidate the mounted filesystem. It effectively
+contains, through a call to `mountpoint_last()`, an alternate
+implementation of `lookup_slow()` which skips that step. This is
+important when unmounting a filesystem that is inaccessible, such as
+one provided by a dead NFS server.
+Finally `path_openat()` is used for the `open()` system call; it
+contains, in support functions starting with "`do_last()`", all the
+complexity needed to handle the different subtleties of O_CREAT (with
+or without O_EXCL), final "`/`" characters, and trailing symbolic
+links. We will revisit this in the final part of this series, which
+focuses on those symbolic links. "`do_last()`" will sometimes, but
+not always, take `i_mutex`, depending on what it finds.
+Each of these, or the functions which call them, need to be alert to
+the possibility that the final component is not `LAST_NORM`. If the
+goal of the lookup is to create something, then any value for
+`last_type` other than `LAST_NORM` will result in an error. For
+example if `path_parentat()` reports `LAST_DOTDOT`, then the caller
+won't try to create that name. They also check for trailing slashes
+by testing `[last.len]`. If there is any character beyond
+the final component, it must be a trailing slash.
+Revalidation and automounts
+Apart from symbolic links, there are only two parts of the "REF-walk"
+process not yet covered. One is the handling of stale cache entries
+and the other is automounts.
+On filesystems that require it, the lookup routines will call the
+`->d_revalidate()` dentry method to ensure that the cached information
+is current. This will often confirm validity or update a few details
+from a server. In some cases it may find that there has been change
+further up the path and that something that was thought to be valid
+previously isn't really. When this happens the lookup of the whole
+path is aborted and retried with the "`LOOKUP_REVAL`" flag set. This
+forces revalidation to be more thorough. We will see more details of
+this retry process in the next article.
+Automount points are locations in the filesystem where an attempt to
+lookup a name can trigger changes to how that lookup should be
+handled, in particular by mounting a filesystem there. These are
+covered in greater detail in autofs4.txt in the Linux documentation
+tree, but a few notes specifically related to path lookup are in order
+The Linux VFS has a concept of "managed" dentries which is reflected
+in function names such as "`follow_managed()`". There are three
+potentially interesting things about these dentries corresponding
+to three different flags that might be set in `dentry->d_flags`:
+If this flag has been set, then the filesystem has requested that the
+`d_manage()` dentry operation be called before handling any possible
+mount point. This can perform two particular services:
+It can block to avoid races. If an automount point is being
+unmounted, the `d_manage()` function will usually wait for that
+process to complete before letting the new lookup proceed and possibly
+trigger a new automount.
+It can selectively allow only some processes to transit through a
+mount point. When a server process is managing automounts, it may
+need to access a directory without triggering normal automount
+processing. That server process can identify itself to the `autofs`
+filesystem, which will then give it a special pass through
+`d_manage()` by returning `-EISDIR`.
+This flag is set on every dentry that is mounted on. As Linux
+supports multiple filesystem namespaces, it is possible that the
+dentry may not be mounted on in *this* namespace, just in some
+other. So this flag is seen as a hint, not a promise.
+If this flag is set, and `d_manage()` didn't return `-EISDIR`,
+`lookup_mnt()` is called to examine the mount hash table (honoring the
+`mount_lock` described earlier) and possibly return a new `vfsmount`
+and a new `dentry` (both with counted references).
+If `d_manage()` allowed us to get this far, and `lookup_mnt()` didn't
+find a mount point, then this flag causes the `d_automount()` dentry
+operation to be called.
+The `d_automount()` operation can be arbitrarily complex and may
+communicate with server processes etc. but it should ultimately either
+report that there was an error, that there was nothing to mount, or
+should provide an updated `struct path` with new `dentry` and `vfsmount`.
+In the latter case, `finish_automount()` will be called to safely
+install the new mount point into the mount table.
+There is no new locking of import here and it is important that no
+locks (only counted references) are held over this processing due to
+the very real possibility of extended delays.
+This will become more important next time when we examine RCU-walk
+which is particularly sensitive to delays.
+RCU-walk - faster pathname lookup in Linux
+RCU-walk is another algorithm for performing pathname lookup in Linux.
+It is in many ways similar to REF-walk and the two share quite a bit
+of code. The significant difference in RCU-walk is how it allows for
+the possibility of concurrent access.
+We noted that REF-walk is complex because there are numerous details
+and special cases. RCU-walk reduces this complexity by simply
+refusing to handle a number of cases -- it instead falls back to
+REF-walk. The difficulty with RCU-walk comes from a different
+direction: unfamiliarity. The locking rules when depending on RCU are
+quite different from traditional locking, so we will spend a little extra
+time when we come to those.
+Clear demarcation of roles
+The easiest way to manage concurrency is to forcibly stop any other
+thread from changing the data structures that a given thread is
+looking at. In cases where no other thread would even think of
+changing the data and lots of different threads want to read at the
+same time, this can be very costly. Even when using locks that permit
+multiple concurrent readers, the simple act of updating the count of
+the number of current readers can impose an unwanted cost. So the
+goal when reading a shared data structure that no other process is
+changing is to avoid writing anything to memory at all. Take no
+locks, increment no counts, leave no footprints.
+The REF-walk mechanism already described certainly doesn't follow this
+principle, but then it is really designed to work when there may well
+be other threads modifying the data. RCU-walk, in contrast, is
+designed for the common situation where there are lots of frequent
+readers and only occasional writers. This may not be common in all
+parts of the filesystem tree, but in many parts it will be. For the
+other parts it is important that RCU-walk can quickly fall back to
+using REF-walk.
+Pathname lookup always starts in RCU-walk mode but only remains there
+as long as what it is looking for is in the cache and is stable. It
+dances lightly down the cached filesystem image, leaving no footprints
+and carefully watching where it is, to be sure it doesn't trip. If it
+notices that something has changed or is changing, or if something
+isn't in the cache, then it tries to stop gracefully and switch to
+This stopping requires getting a counted reference on the current
+`vfsmount` and `dentry`, and ensuring that these are still valid -
+that a path walk with REF-walk would have found the same entries.
+This is an invariant that RCU-walk must guarantee. It can only make
+decisions, such as selecting the next step, that are decisions which
+REF-walk could also have made if it were walking down the tree at the
+same time. If the graceful stop succeeds, the rest of the path is
+processed with the reliable, if slightly sluggish, REF-walk. If
+RCU-walk finds it cannot stop gracefully, it simply gives up and
+restarts from the top with REF-walk.
+This pattern of "try RCU-walk, if that fails try REF-walk" can be
+clearly seen in functions like `filename_lookup()`,
+`filename_parentat()`, `filename_mountpoint()`,
+`do_filp_open()`, and `do_file_open_root()`. These five
+correspond roughly to the four `path_`* functions we met earlier,
+each of which calls `link_path_walk()`. The `path_*` functions are
+called using different mode flags until a mode is found which works.
+They are first called with `LOOKUP_RCU` set to request "RCU-walk". If
+that fails with the error `ECHILD` they are called again with no
+special flag to request "REF-walk". If either of those report the
+error `ESTALE` a final attempt is made with `LOOKUP_REVAL` set (and no
+`LOOKUP_RCU`) to ensure that entries found in the cache are forcibly
+revalidated - normally entries are only revalidated if the filesystem
+determines that they are too old to trust.
+The `LOOKUP_RCU` attempt may drop that flag internally and switch to
+REF-walk, but will never then try to switch back to RCU-walk. Places
+that trip up RCU-walk are much more likely to be near the leaves and
+so it is very unlikely that there will be much, if any, benefit from
+switching back.
+RCU and seqlocks: fast and light
+RCU is, unsurprisingly, critical to RCU-walk mode. The
+`rcu_read_lock()` is held for the entire time that RCU-walk is walking
+down a path. The particular guarantee it provides is that the key
+data structures - dentries, inodes, super_blocks, and mounts - will
+not be freed while the lock is held. They might be unlinked or
+invalidated in one way or another, but the memory will not be
+repurposed so values in various fields will still be meaningful. This
+is the only guarantee that RCU provides; everything else is done using
+As we saw above, REF-walk holds a counted reference to the current
+dentry and the current vfsmount, and does not release those references
+before taking references to the "next" dentry or vfsmount. It also
+sometimes takes the `d_lock` spinlock. These references and locks are
+taken to prevent certain changes from happening. RCU-walk must not
+take those references or locks and so cannot prevent such changes.
+Instead, it checks to see if a change has been made, and aborts or
+retries if it has.
+To preserve the invariant mentioned above (that RCU-walk may only make
+decisions that REF-walk could have made), it must make the checks at
+or near the same places that REF-walk holds the references. So, when
+REF-walk increments a reference count or takes a spinlock, RCU-walk
+samples the status of a seqlock using `read_seqcount_begin()` or a
+similar function. When REF-walk decrements the count or drops the
+lock, RCU-walk checks if the sampled status is still valid using
+`read_seqcount_retry()` or similar.
+However, there is a little bit more to seqlocks than that. If
+RCU-walk accesses two different fields in a seqlock-protected
+structure, or accesses the same field twice, there is no a priori
+guarantee of any consistency between those accesses. When consistency
+is needed - which it usually is - RCU-walk must take a copy and then
+use `read_seqcount_retry()` to validate that copy.
+`read_seqcount_retry()` not only checks the sequence number, but also
+imposes a memory barrier so that no memory-read instruction from
+*before* the call can be delayed until *after* the call, either by the
+CPU or by the compiler. A simple example of this can be seen in
+`slow_dentry_cmp()` which, for filesystems which do not use simple
+byte-wise name equality, calls into the filesystem to compare a name
+against a dentry. The length and name pointer are copied into local
+variables, then `read_seqcount_retry()` is called to confirm the two
+are consistent, and only then is `->d_compare()` called. When
+standard filename comparison is used, `dentry_cmp()` is called
+instead. Notably it does _not_ use `read_seqcount_retry()`, but
+instead has a large comment explaining why the consistency guarantee
+isn't necessary. A subsequent `read_seqcount_retry()` will be
+sufficient to catch any problem that could occur at this point.
+With that little refresher on seqlocks out of the way we can look at
+the bigger picture of how RCU-walk uses seqlocks.
+### `mount_lock` and `nd->m_seq` ###
+We already met the `mount_lock` seqlock when REF-walk used it to
+ensure that crossing a mount point is performed safely. RCU-walk uses
+it for that too, but for quite a bit more.
+Instead of taking a counted reference to each `vfsmount` as it
+descends the tree, RCU-walk samples the state of `mount_lock` at the
+start of the walk and stores this initial sequence number in the
+`struct nameidata` in the `m_seq` field. This one lock and one
+sequence number are used to validate all accesses to all `vfsmounts`,
+and all mount point crossings. As changes to the mount table are
+relatively rare, it is reasonable to fall back on REF-walk any time
+that any "mount" or "unmount" happens.
+`m_seq` is checked (using `read_seqretry()`) at the end of an RCU-walk
+sequence, whether switching to REF-walk for the rest of the path or
+when the end of the path is reached. It is also checked when stepping
+down over a mount point (in `__follow_mount_rcu()`) or up (in
+`follow_dotdot_rcu()`). If it is ever found to have changed, the
+whole RCU-walk sequence is aborted and the path is processed again by
+If RCU-walk finds that `mount_lock` hasn't changed then it can be sure
+that, had REF-walk taken counted references on each vfsmount, the
+results would have been the same. This ensures the invariant holds,
+at least for vfsmount structures.
+### `dentry->d_seq` and `nd->seq`. ###
+In place of taking a count or lock on `d_reflock`, RCU-walk samples
+the per-dentry `d_seq` seqlock, and stores the sequence number in the
+`seq` field of the nameidata structure, so `nd->seq` should always be
+the current sequence number of `nd->dentry`. This number needs to be
+revalidated after copying, and before using, the name, parent, or
+inode of the dentry.
+The handling of the name we have already looked at, and the parent is
+only accessed in `follow_dotdot_rcu()` which fairly trivially follows
+the required pattern, though it does so for three different cases.
+When not at a mount point, `d_parent` is followed and its `d_seq` is
+collected. When we are at a mount point, we instead follow the
+`mnt->mnt_mountpoint` link to get a new dentry and collect its
+`d_seq`. Then, after finally finding a `d_parent` to follow, we must
+check if we have landed on a mount point and, if so, must find that
+mount point and follow the `mnt->mnt_root` link. This would imply a
+somewhat unusual, but certainly possible, circumstance where the
+starting point of the path lookup was in part of the filesystem that
+was mounted on, and so not visible from the root.
+The inode pointer, stored in `->d_inode`, is a little more
+interesting. The inode will always need to be accessed at least
+twice, once to determine if it is NULL and once to verify access
+permissions. Symlink handling requires a validated inode pointer too.
+Rather than revalidating on each access, a copy is made on the first
+access and it is stored in the `inode` field of `nameidata` from where
+it can be safely accessed without further validation.
+`lookup_fast()` is the only lookup routine that is used in RCU-mode,
+`lookup_slow()` being too slow and requiring locks. It is in
+`lookup_fast()` that we find the important "hand over hand" tracking
+of the current dentry.
+The current `dentry` and current `seq` number are passed to
+`__d_lookup_rcu()` which, on success, returns a new `dentry` and a
+new `seq` number. `lookup_fast()` then copies the inode pointer and
+revalidates the new `seq` number. It then validates the old `dentry`
+with the old `seq` number one last time and only then continues. This
+process of getting the `seq` number of the new dentry and then
+checking the `seq` number of the old exactly mirrors the process of
+getting a counted reference to the new dentry before dropping that for
+the old dentry which we saw in REF-walk.
+### No `inode->i_mutex` or even `rename_lock` ###
+A mutex is a fairly heavyweight lock that can only be taken when it is
+permissible to sleep. As `rcu_read_lock()` forbids sleeping,
+`inode->i_mutex` plays no role in RCU-walk. If some other thread does
+take `i_mutex` and modifies the directory in a way that RCU-walk needs
+to notice, the result will be either that RCU-walk fails to find the
+dentry that it is looking for, or it will find a dentry which
+`read_seqretry()` won't validate. In either case it will drop down to
+REF-walk mode which can take whatever locks are needed.
+Though `rename_lock` could be used by RCU-walk as it doesn't require
+any sleeping, RCU-walk doesn't bother. REF-walk uses `rename_lock` to
+protect against the possibility of hash chains in the dcache changing
+while they are being searched. This can result in failing to find
+something that actually is there. When RCU-walk fails to find
+something in the dentry cache, whether it is really there or not, it
+already drops down to REF-walk and tries again with appropriate
+locking. This neatly handles all cases, so adding extra checks on
+rename_lock would bring no significant value.
+`unlazy walk()` and `complete_walk()`
+That "dropping down to REF-walk" typically involves a call to
+`unlazy_walk()`, so named because "RCU-walk" is also sometimes
+referred to as "lazy walk". `unlazy_walk()` is called when
+following the path down to the current vfsmount/dentry pair seems to
+have proceeded successfully, but the next step is problematic. This
+can happen if the next name cannot be found in the dcache, if
+permission checking or name revalidation couldn't be achieved while
+the `rcu_read_lock()` is held (which forbids sleeping), if an
+automount point is found, or in a couple of cases involving symlinks.
+It is also called from `complete_walk()` when the lookup has reached
+the final component, or the very end of the path, depending on which
+particular flavor of lookup is used.
+Other reasons for dropping out of RCU-walk that do not trigger a call
+to `unlazy_walk()` are when some inconsistency is found that cannot be
+handled immediately, such as `mount_lock` or one of the `d_seq`
+seqlocks reporting a change. In these cases the relevant function
+will return `-ECHILD` which will percolate up until it triggers a new
+attempt from the top using REF-walk.
+For those cases where `unlazy_walk()` is an option, it essentially
+takes a reference on each of the pointers that it holds (vfsmount,
+dentry, and possibly some symbolic links) and then verifies that the
+relevant seqlocks have not been changed. If there have been changes,
+it, too, aborts with `-ECHILD`, otherwise the transition to REF-walk
+has been a success and the lookup process continues.
+Taking a reference on those pointers is not quite as simple as just
+incrementing a counter. That works to take a second reference if you
+already have one (often indirectly through another object), but it
+isn't sufficient if you don't actually have a counted reference at
+all. For `dentry->d_lockref`, it is safe to increment the reference
+counter to get a reference unless it has been explicitly marked as
+"dead" which involves setting the counter to `-128`.
+`lockref_get_not_dead()` achieves this.
+For `mnt->mnt_count` it is safe to take a reference as long as
+`mount_lock` is then used to validate the reference. If that
+validation fails, it may *not* be safe to just drop that reference in
+the standard way of calling `mnt_put()` - an unmount may have
+progressed too far. So the code in `legitimize_mnt()`, when it
+finds that the reference it got might not be safe, checks the
+`MNT_SYNC_UMOUNT` flag to determine if a simple `mnt_put()` is
+correct, or if it should just decrement the count and pretend none of
+this ever happened.
+Taking care in filesystems
+RCU-walk depends almost entirely on cached information and often will
+not call into the filesystem at all. However there are two places,
+besides the already-mentioned component-name comparison, where the
+file system might be included in RCU-walk, and it must know to be
+If the filesystem has non-standard permission-checking requirements -
+such as a networked filesystem which may need to check with the server
+- the `i_op->permission` interface might be called during RCU-walk.
+In this case an extra "`MAY_NOT_BLOCK`" flag is passed so that it
+knows not to sleep, but to return `-ECHILD` if it cannot complete
+promptly. `i_op->permission` is given the inode pointer, not the
+dentry, so it doesn't need to worry about further consistency checks.
+However if it accesses any other filesystem data structures, it must
+ensure they are safe to be accessed with only the `rcu_read_lock()`
+held. This typically means they must be freed using `kfree_rcu()` or
+If the filesystem may need to revalidate dcache entries, then
+`d_op->d_revalidate` may be called in RCU-walk too. This interface
+*is* passed the dentry but does not have access to the `inode` or the
+`seq` number from the `nameidata`, so it needs to be extra careful
+when accessing fields in the dentry. This "extra care" typically
+involves using `ACCESS_ONCE()` or the newer [`READ_ONCE()`] to access
+fields, and verifying the result is not NULL before using it. This
+pattern can be see in `nfs_lookup_revalidate()`.
+A pair of patterns
+In various places in the details of REF-walk and RCU-walk, and also in
+the big picture, there are a couple of related patterns that are worth
+being aware of.
+The first is "try quickly and check, if that fails try slowly". We
+can see that in the high-level approach of first trying RCU-walk and
+then trying REF-walk, and in places where `unlazy_walk()` is used to
+switch to REF-walk for the rest of the path. We also saw it earlier
+in `dget_parent()` when following a "`..`" link. It tries a quick way
+to get a reference, then falls back to taking locks if needed.
+The second pattern is "try quickly and check, if that fails try
+again - repeatedly". This is seen with the use of `rename_lock` and
+`mount_lock` in REF-walk. RCU-walk doesn't make use of this pattern -
+if anything goes wrong it is much safer to just abort and try a more
+sedate approach.
+The emphasis here is "try quickly and check". It should probably be
+"try quickly _and carefully,_ then check". The fact that checking is
+needed is a reminder that the system is dynamic and only a limited
+number of things are safe at all. The most likely cause of errors in
+this whole process is assuming something is safe when in reality it
+isn't. Careful consideration of what exactly guarantees the safety of
+each access is sometimes necessary.
+A walk among the symlinks
+There are several basic issues that we will examine to understand the
+handling of symbolic links: the symlink stack, together with cache
+lifetimes, will help us understand the overall recursive handling of
+symlinks and lead to the special care needed for the final component.
+Then a consideration of access-time updates and summary of the various
+flags controlling lookup will finish the story.
+The symlink stack
+There are only two sorts of filesystem objects that can usefully
+appear in a path prior to the final component: directories and symlinks.
+Handling directories is quite straightforward: the new directory
+simply becomes the starting point at which to interpret the next
+component on the path. Handling symbolic links requires a bit more
+Conceptually, symbolic links could be handled by editing the path. If
+a component name refers to a symbolic link, then that component is
+replaced by the body of the link and, if that body starts with a '/',
+then all preceding parts of the path are discarded. This is what the
+"`readlink -f`" command does, though it also edits out "`.`" and
+"`..`" components.
+Directly editing the path string is not really necessary when looking
+up a path, and discarding early components is pointless as they aren't
+looked at anyway. Keeping track of all remaining components is
+important, but they can of course be kept separately; there is no need
+to concatenate them. As one symlink may easily refer to another,
+which in turn can refer to a third, we may need to keep the remaining
+components of several paths, each to be processed when the preceding
+ones are completed. These path remnants are kept on a stack of
+limited size.
+There are two reasons for placing limits on how many symlinks can
+occur in a single path lookup. The most obvious is to avoid loops.
+If a symlink referred to itself either directly or through
+intermediaries, then following the symlink can never complete
+successfully - the error `ELOOP` must be returned. Loops can be
+detected without imposing limits, but limits are the simplest solution
+and, given the second reason for restriction, quite sufficient.
+[outlined recently]:
+The second reason was [outlined recently] by Linus:
+> Because it's a latency and DoS issue too. We need to react well to
+> true loops, but also to "very deep" non-loops. It's not about memory
+> use, it's about users triggering unreasonable CPU resources.
+Linux imposes a limit on the length of any pathname: `PATH_MAX`, which
+is 4096. There are a number of reasons for this limit; not letting the
+kernel spend too much time on just one path is one of them. With
+symbolic links you can effectively generate much longer paths so some
+sort of limit is needed for the same reason. Linux imposes a limit of
+at most 40 symlinks in any one path lookup. It previously imposed a
+further limit of eight on the maximum depth of recursion, but that was
+raised to 40 when a separate stack was implemented, so there is now
+just the one limit.
+The `nameidata` structure that we met in an earlier article contains a
+small stack that can be used to store the remaining part of up to two
+symlinks. In many cases this will be sufficient. If it isn't, a
+separate stack is allocated with room for 40 symlinks. Pathname
+lookup will never exceed that stack as, once the 40th symlink is
+detected, an error is returned.
+It might seem that the name remnants are all that needs to be stored on
+this stack, but we need a bit more. To see that, we need to move on to
+cache lifetimes.
+Storage and lifetime of cached symlinks
+Like other filesystem resources, such as inodes and directory
+entries, symlinks are cached by Linux to avoid repeated costly access
+to external storage. It is particularly important for RCU-walk to be
+able to find and temporarily hold onto these cached entries, so that
+it doesn't need to drop down into REF-walk.
+[object-oriented design pattern]:
+While each filesystem is free to make its own choice, symlinks are
+typically stored in one of two places. Short symlinks are often
+stored directly in the inode. When a filesystem allocates a `struct
+inode` it typically allocates extra space to store private data (a
+common [object-oriented design pattern] in the kernel). This will
+sometimes include space for a symlink. The other common location is
+in the page cache, which normally stores the content of files. The
+pathname in a symlink can be seen as the content of that symlink and
+can easily be stored in the page cache just like file content.
+When neither of these is suitable, the next most likely scenario is
+that the filesystem will allocate some temporary memory and copy or
+construct the symlink content into that memory whenever it is needed.
+When the symlink is stored in the inode, it has the same lifetime as
+the inode which, itself, is protected by RCU or by a counted reference
+on the dentry. This means that the mechanisms that pathname lookup
+uses to access the dcache and icache (inode cache) safely are quite
+sufficient for accessing some cached symlinks safely. In these cases,
+the `i_link` pointer in the inode is set to point to wherever the
+symlink is stored and it can be accessed directly whenever needed.
+When the symlink is stored in the page cache or elsewhere, the
+situation is not so straightforward. A reference on a dentry or even
+on an inode does not imply any reference on cached pages of that
+inode, and even an `rcu_read_lock()` is not sufficient to ensure that
+a page will not disappear. So for these symlinks the pathname lookup
+code needs to ask the filesystem to provide a stable reference and,
+significantly, needs to release that reference when it is finished
+with it.
+Taking a reference to a cache page is often possible even in RCU-walk
+mode. It does require making changes to memory, which is best avoided,
+but that isn't necessarily a big cost and it is better than dropping
+out of RCU-walk mode completely. Even filesystems that allocate
+space to copy the symlink into can use `GFP_ATOMIC` to often successfully
+allocate memory without the need to drop out of RCU-walk. If a
+filesystem cannot successfully get a reference in RCU-walk mode, it
+must return `-ECHILD` and `unlazy_walk()` will be called to return to
+REF-walk mode in which the filesystem is allowed to sleep.
+The place for all this to happen is the `i_op->follow_link()` inode
+method. In the present mainline code this is never actually called in
+RCU-walk mode as the rewrite is not quite complete. It is likely that
+in a future release this method will be passed an `inode` pointer when
+called in RCU-walk mode so it both (1) knows to be careful, and (2) has the
+validated pointer. Much like the `i_op->permission()` method we
+looked at previously, `->follow_link()` would need to be careful that
+all the data structures it references are safe to be accessed while
+holding no counted reference, only the RCU lock. Though getting a
+reference with `->follow_link()` is not yet done in RCU-walk mode, the
+code is ready to release the reference when that does happen.
+This need to drop the reference to a symlink adds significant
+complexity. It requires a reference to the inode so that the
+`i_op->put_link()` inode operation can be called. In REF-walk, that
+reference is kept implicitly through a reference to the dentry, so
+keeping the `struct path` of the symlink is easiest. For RCU-walk,
+the pointer to the inode is kept separately. To allow switching from
+RCU-walk back to REF-walk in the middle of processing nested symlinks
+we also need the seq number for the dentry so we can confirm that
+switching back was safe.
+Finally, when providing a reference to a symlink, the filesystem also
+provides an opaque "cookie" that must be passed to `->put_link()` so that it
+knows what to free. This might be the allocated memory area, or a
+pointer to the `struct page` in the page cache, or something else
+completely. Only the filesystem knows what it is.
+In order for the reference to each symlink to be dropped when the walk completes,
+whether in RCU-walk or REF-walk, the symlink stack needs to contain,
+along with the path remnants:
+- the `struct path` to provide a reference to the inode in REF-walk
+- the `struct inode *` to provide a reference to the inode in RCU-walk
+- the `seq` to allow the path to be safely switched from RCU-walk to REF-walk
+- the `cookie` that tells `->put_path()` what to put.
+This means that each entry in the symlink stack needs to hold five
+pointers and an integer instead of just one pointer (the path
+remnant). On a 64-bit system, this is about 40 bytes per entry;
+with 40 entries it adds up to 1600 bytes total, which is less than
+half a page. So it might seem like a lot, but is by no means
+Note that, in a given stack frame, the path remnant (`name`) is not
+part of the symlink that the other fields refer to. It is the remnant
+to be followed once that symlink has been fully parsed.
+Following the symlink
+The main loop in `link_path_walk()` iterates seamlessly over all
+components in the path and all of the non-final symlinks. As symlinks
+are processed, the `name` pointer is adjusted to point to a new
+symlink, or is restored from the stack, so that much of the loop
+doesn't need to notice. Getting this `name` variable on and off the
+stack is very straightforward; pushing and popping the references is
+a little more complex.
+When a symlink is found, `walk_component()` returns the value `1`
+(`0` is returned for any other sort of success, and a negative number
+is, as usual, an error indicator). This causes `get_link()` to be
+called; it then gets the link from the filesystem. Providing that
+operation is successful, the old path `name` is placed on the stack,
+and the new value is used as the `name` for a while. When the end of
+the path is found (i.e. `*name` is `'\0'`) the old `name` is restored
+off the stack and path walking continues.
+Pushing and popping the reference pointers (inode, cookie, etc.) is more
+complex in part because of the desire to handle tail recursion. When
+the last component of a symlink itself points to a symlink, we
+want to pop the symlink-just-completed off the stack before pushing
+the symlink-just-found to avoid leaving empty path remnants that would
+just get in the way.
+It is most convenient to push the new symlink references onto the
+stack in `walk_component()` immediately when the symlink is found;
+`walk_component()` is also the last piece of code that needs to look at the
+old symlink as it walks that last component. So it is quite
+convenient for `walk_component()` to release the old symlink and pop
+the references just before pushing the reference information for the
+new symlink. It is guided in this by two flags; `WALK_GET`, which
+gives it permission to follow a symlink if it finds one, and
+`WALK_PUT`, which tells it to release the current symlink after it has been
+followed. `WALK_PUT` is tested first, leading to a call to
+`put_link()`. `WALK_GET` is tested subsequently (by
+`should_follow_link()`) leading to a call to `pick_link()` which sets
+up the stack frame.
+### Symlinks with no final component ###
+A pair of special-case symlinks deserve a little further explanation.
+Both result in a new `struct path` (with mount and dentry) being set
+up in the `nameidata`, and result in `get_link()` returning `NULL`.
+The more obvious case is a symlink to "`/`". All symlinks starting
+with "`/`" are detected in `get_link()` which resets the `nameidata`
+to point to the effective filesystem root. If the symlink only
+contains "`/`" then there is nothing more to do, no components at all,
+so `NULL` is returned to indicate that the symlink can be released and
+the stack frame discarded.
+The other case involves things in `/proc` that look like symlinks but
+aren't really.
+> $ ls -l /proc/self/fd/1
+> lrwx------ 1 neilb neilb 64 Jun 13 10:19 /proc/self/fd/1 -> /dev/pts/4
+Every open file descriptor in any process is represented in `/proc` by
+something that looks like a symlink. It is really a reference to the
+target file, not just the name of it. When you `readlink` these
+objects you get a name that might refer to the same file - unless it
+has been unlinked or mounted over. When `walk_component()` follows
+one of these, the `->follow_link()` method in "procfs" doesn't return
+a string name, but instead calls `nd_jump_link()` which updates the
+`nameidata` in place to point to that target. `->follow_link()` then
+returns `NULL`. Again there is no final component and `get_link()`
+reports this by leaving the `last_type` field of `nameidata` as
+Following the symlink in the final component
+All this leads to `link_path_walk()` walking down every component, and
+following all symbolic links it finds, until it reaches the final
+component. This is just returned in the `last` field of `nameidata`.
+For some callers, this is all they need; they want to create that
+`last` name if it doesn't exist or give an error if it does. Other
+callers will want to follow a symlink if one is found, and possibly
+apply special handling to the last component of that symlink, rather
+than just the last component of the original file name. These callers
+potentially need to call `link_path_walk()` again and again on
+successive symlinks until one is found that doesn't point to another
+This case is handled by the relevant caller of `link_path_walk()`, such as
+`path_lookupat()` using a loop that calls `link_path_walk()`, and then
+handles the final component. If the final component is a symlink
+that needs to be followed, then `trailing_symlink()` is called to set
+things up properly and the loop repeats, calling `link_path_walk()`
+again. This could loop as many as 40 times if the last component of
+each symlink is another symlink.
+The various functions that examine the final component and possibly
+report that it is a symlink are `lookup_last()`, `mountpoint_last()`
+and `do_last()`, each of which use the same convention as
+`walk_component()` of returning `1` if a symlink was found that needs
+to be followed.
+Of these, `do_last()` is the most interesting as it is used for
+opening a file. Part of `do_last()` runs with `i_mutex` held and this
+part is in a separate function: `lookup_open()`.
+Explaining `do_last()` completely is beyond the scope of this article,
+but a few highlights should help those interested in exploring the
+1. Rather than just finding the target file, `do_last()` needs to open
+ it. If the file was found in the dcache, then `vfs_open()` is used for
+ this. If not, then `lookup_open()` will either call `atomic_open()` (if
+ the filesystem provides it) to combine the final lookup with the open, or
+ will perform the separate `lookup_real()` and `vfs_create()` steps
+ directly. In the later case the actual "open" of this newly found or
+ created file will be performed by `vfs_open()`, just as if the name
+ were found in the dcache.
+2. `vfs_open()` can fail with `-EOPENSTALE` if the cached information
+ wasn't quite current enough. Rather than restarting the lookup from
+ the top with `LOOKUP_REVAL` set, `lookup_open()` is called instead,
+ giving the filesystem a chance to resolve small inconsistencies.
+ If that doesn't work, only then is the lookup restarted from the top.
+3. An open with O_CREAT **does** follow a symlink in the final component,
+ unlike other creation system calls (like `mkdir`). So the sequence:
+ > ln -s bar /tmp/foo
+ > echo hello > /tmp/foo
+ will create a file called `/tmp/bar`. This is not permitted if
+ `O_EXCL` is set but otherwise is handled for an O_CREAT open much
+ like for a non-creating open: `should_follow_link()` returns `1`, and
+ so does `do_last()` so that `trailing_symlink()` gets called and the
+ open process continues on the symlink that was found.
+Updating the access time
+We previously said of RCU-walk that it would "take no locks, increment
+no counts, leave no footprints." We have since seen that some
+"footprints" can be needed when handling symlinks as a counted
+reference (or even a memory allocation) may be needed. But these
+footprints are best kept to a minimum.
+One other place where walking down a symlink can involve leaving
+footprints in a way that doesn't affect directories is in updating access times.
+In Unix (and Linux) every filesystem object has a "last accessed
+time", or "`atime`". Passing through a directory to access a file
+within is not considered to be an access for the purposes of
+`atime`; only listing the contents of a directory can update its `atime`.
+Symlinks are different it seems. Both reading a symlink (with `readlink()`)
+and looking up a symlink on the way to some other destination can
+update the atime on that symlink.
+[clearest statement]:
+It is not clear why this is the case; POSIX has little to say on the
+subject. The [clearest statement] is that, if a particular implementation
+updates a timestamp in a place not specified by POSIX, this must be
+documented "except that any changes caused by pathname resolution need
+not be documented". This seems to imply that POSIX doesn't really
+care about access-time updates during pathname lookup.
+[Linux 1.3.87]:
+An examination of history shows that prior to [Linux 1.3.87], the ext2
+filesystem, at least, didn't update atime when following a link.
+Unfortunately we have no record of why that behavior was changed.
+In any case, access time must now be updated and that operation can be
+quite complex. Trying to stay in RCU-walk while doing it is best
+avoided. Fortunately it is often permitted to skip the `atime`
+update. Because `atime` updates cause performance problems in various
+areas, Linux supports the `relatime` mount option, which generally
+limits the updates of `atime` to once per day on files that aren't
+being changed (and symlinks never change once created). Even without
+`relatime`, many filesystems record `atime` with a one-second
+granularity, so only one update per second is required.
+It is easy to test if an `atime` update is needed while in RCU-walk
+mode and, if it isn't, the update can be skipped and RCU-walk mode
+continues. Only when an `atime` update is actually required does the
+path walk drop down to REF-walk. All of this is handled in the
+`get_link()` function.
+A few flags
+A suitable way to wrap up this tour of pathname walking is to list
+the various flags that can be stored in the `nameidata` to guide the
+lookup process. Many of these are only meaningful on the final
+component, others reflect the current state of the pathname lookup.
+And then there is `LOOKUP_EMPTY`, which doesn't fit conceptually with
+the others. If this is not set, an empty pathname causes an error
+very early on. If it is set, empty pathnames are not considered to be
+an error.
+### Global state flags ###
+We have already met two global state flags: `LOOKUP_RCU` and
+`LOOKUP_REVAL`. These select between one of three overall approaches
+to lookup: RCU-walk, REF-walk, and REF-walk with forced revalidation.
+`LOOKUP_PARENT` indicates that the final component hasn't been reached
+yet. This is primarily used to tell the audit subsystem the full
+context of a particular access being audited.
+`LOOKUP_ROOT` indicates that the `root` field in the `nameidata` was
+provided by the caller, so it shouldn't be released when it is no
+longer needed.
+`LOOKUP_JUMPED` means that the current dentry was chosen not because
+it had the right name but for some other reason. This happens when
+following "`..`", following a symlink to `/`, crossing a mount point
+or accessing a "`/proc/$PID/fd/$FD`" symlink. In this case the
+filesystem has not been asked to revalidate the name (with
+`d_revalidate()`). In such cases the inode may still need to be
+revalidated, so `d_op->d_weak_revalidate()` is called if
+`LOOKUP_JUMPED` is set when the look completes - which may be at the
+final component or, when creating, unlinking, or renaming, at the penultimate component.
+### Final-component flags ###
+Some of these flags are only set when the final component is being
+considered. Others are only checked for when considering that final
+`LOOKUP_AUTOMOUNT` ensures that, if the final component is an automount
+point, then the mount is triggered. Some operations would trigger it
+anyway, but operations like `stat()` deliberately don't. `statfs()`
+needs to trigger the mount but otherwise behaves a lot like `stat()`, so
+it sets `LOOKUP_AUTOMOUNT`, as does "`quotactl()`" and the handling of
+"`mount --bind`".
+`LOOKUP_FOLLOW` has a similar function to `LOOKUP_AUTOMOUNT` but for
+symlinks. Some system calls set or clear it implicitly, while
+others have API flags such as `AT_SYMLINK_FOLLOW` and
+`UMOUNT_NOFOLLOW` to control it. Its effect is similar to
+`WALK_GET` that we already met, but it is used in a different way.
+`LOOKUP_DIRECTORY` insists that the final component is a directory.
+Various callers set this and it is also set when the final component
+is found to be followed by a slash.
+`LOOKUP_RENAME_TARGET` are not used directly by the VFS but are made
+available to the filesystem and particularly the `->d_revalidate()`
+method. A filesystem can choose not to bother revalidating too hard
+if it knows that it will be asked to open or create the file soon.
+These flags were previously useful for `->lookup()` too but with the
+introduction of `->atomic_open()` they are less relevant there.
+End of the road
+Despite its complexity, all this pathname lookup code appears to be
+in good shape - various parts are certainly easier to understand now
+than even a couple of releases ago. But that doesn't mean it is
+"finished". As already mentioned, RCU-walk currently only follows
+symlinks that are stored in the inode so, while it handles many ext4
+symlinks, it doesn't help with NFS, XFS, or Btrfs. That support
+is not likely to be long delayed.
diff --git a/Documentation/filesystems/path-lookup.txt b/Documentation/filesystems/path-lookup.txt
index 3571667c7105..9b8930f589d9 100644
--- a/Documentation/filesystems/path-lookup.txt
+++ b/Documentation/filesystems/path-lookup.txt
@@ -379,4 +379,4 @@ Papers and other documentation on dcache locking
+3. in this directory.
diff --git a/Documentation/filesystems/sysfs-tagging.txt b/Documentation/filesystems/sysfs-tagging.txt
index eb843e49c5a3..c7c8e6438958 100644
--- a/Documentation/filesystems/sysfs-tagging.txt
+++ b/Documentation/filesystems/sysfs-tagging.txt
@@ -17,13 +17,13 @@ the sysfs directory entries we ensure that we don't have conflicts
in the directories and applications only see a limited set of
the network devices.
-Each sysfs directory entry may be tagged with zero or one
-namespaces. A sysfs_dirent is augmented with a void *s_ns. If a
-directory entry is tagged, then sysfs_dirent->s_flags will have a
-flag between KOBJ_NS_TYPE_NONE and KOBJ_NS_TYPES, and s_ns will
-point to the namespace to which it belongs.
+Each sysfs directory entry may be tagged with a namespace via the
+void *ns member of its kernfs_node. If a directory entry is tagged,
+then kernfs_node->flags will have a flag between KOBJ_NS_TYPE_NONE
+and KOBJ_NS_TYPES, and ns will point to the namespace to which it
-Each sysfs superblock's sysfs_super_info contains an array void
+Each sysfs superblock's kernfs_super_info contains an array void
*ns[KOBJ_NS_TYPES]. When a task in a tagging namespace
kobj_nstype first mounts sysfs, a new superblock is created. It
will be differentiated from other sysfs mounts by having its
@@ -31,7 +31,7 @@ s_fs_info->ns[kobj_nstype] set to the new namespace. Note that
through bind mounting and mounts propagation, a task can easily view
the contents of other namespaces' sysfs mounts. Therefore, when a
namespace exits, it will call kobj_ns_exit() to invalidate any
-sysfs_dirent->s_ns pointers pointing to it.
+kernfs_node->ns pointers pointing to it.
Users of this interface:
- define a type in the kobj_ns_type enumeration.
diff --git a/Documentation/filesystems/sysfs.txt b/Documentation/filesystems/sysfs.txt
index 9494afb9476a..24da7b32c489 100644
--- a/Documentation/filesystems/sysfs.txt
+++ b/Documentation/filesystems/sysfs.txt
@@ -40,7 +40,7 @@ ancestors of object hierarchies; i.e. the subsystems the objects
belong to.
Sysfs internally stores a pointer to the kobject that implements a
-directory in the sysfs_dirent object associated with the directory. In
+directory in the kernfs_node object associated with the directory. In
the past this kobject pointer has been used by sysfs to do reference
counting directly on the kobject whenever the file is opened or closed.
With the current sysfs implementation the kobject reference count is
@@ -191,9 +191,10 @@ implementations:
be called again, rearmed, to fill the buffer.
- On write(2), sysfs expects the entire buffer to be passed during the
- first write. Sysfs then passes the entire buffer to the store()
- method.
+ first write. Sysfs then passes the entire buffer to the store() method.
+ A terminating null is added after the data on stores. This makes
+ functions like sysfs_streq() safe to use.
When writing sysfs files, userspace processes should first read the
entire file, modify the values it wishes to change, then write the
entire buffer back.
diff --git a/Documentation/gpio/board.txt b/Documentation/gpio/board.txt
index f59c43b6411b..3092178628c4 100644
--- a/Documentation/gpio/board.txt
+++ b/Documentation/gpio/board.txt
@@ -21,8 +21,8 @@ exact way to do it depends on the GPIO controller providing the GPIOs, see the
device tree bindings for your controller.
GPIOs mappings are defined in the consumer device's node, in a property named
-either <function>-gpios or <function>-gpio, where <function> is the function
-the driver will request through gpiod_get(). For example:
+<function>-gpios, where <function> is the function the driver will request
+through gpiod_get(). For example:
foo_device {
compatible = "acme,foo";
@@ -31,9 +31,13 @@ the driver will request through gpiod_get(). For example:
<&gpio 16 GPIO_ACTIVE_HIGH>, /* green */
<&gpio 17 GPIO_ACTIVE_HIGH>; /* blue */
- power-gpio = <&gpio 1 GPIO_ACTIVE_LOW>;
+ power-gpios = <&gpio 1 GPIO_ACTIVE_LOW>;
+Properties named <function>-gpio are also considered valid and old bindings use
+it but are only supported for compatibility reasons and should not be used for
+newer bindings since it has been deprecated.
This property will make GPIOs 15, 16 and 17 available to the driver under the
"led" function, and GPIO 1 as the "power" GPIO:
diff --git a/Documentation/gpio/sysfs.txt b/Documentation/gpio/sysfs.txt
index 0700b55637f5..aeab01aa4d00 100644
--- a/Documentation/gpio/sysfs.txt
+++ b/Documentation/gpio/sysfs.txt
@@ -20,14 +20,14 @@ userspace GPIO can be used to determine system configuration data that
standard kernels won't know about. And for some tasks, simple userspace
GPIO drivers could be all that the system really needs.
Paths in Sysfs
-There are three kinds of entry in /sys/class/gpio:
+There are three kinds of entries in /sys/class/gpio:
- Control interfaces used to get userspace control over GPIOs;
@@ -106,7 +106,7 @@ read-only attributes:
"label" ... provided for diagnostics (not always unique)
- "ngpio" ... how many GPIOs this manges (N to N + ngpio - 1)
+ "ngpio" ... how many GPIOs this manages (N to N + ngpio - 1)
Board documentation should in most cases cover what GPIOs are used for
what purposes. However, those numbers are not always stable; GPIOs on
diff --git a/Documentation/kernel-docs.txt b/Documentation/kernel-docs.txt
index eda1eb1451a0..08913361e054 100644
--- a/Documentation/kernel-docs.txt
+++ b/Documentation/kernel-docs.txt
@@ -696,18 +696,18 @@
Memory related patches, HOWTOs, links, mm developers... Don't miss
it if you are interested in memory management development!
- * Name: "Kernel Newbies IRC Channel"
+ * Name: "Kernel Newbies IRC Channel and Website"
Keywords: IRC, newbies, channel, asking doubts.
- Description: #kernelnewbies on From the web
- page: "#kernelnewbies is an IRC network dedicated to the 'newbie'
+ Description: #kernelnewbies on
+ #kernelnewbies is an IRC network dedicated to the 'newbie'
kernel hacker. The audience mostly consists of people who are
learning about the kernel, working on kernel projects or
professional kernel hackers that want to help less seasoned kernel
- people. [...] #kernelnewbies is on the Open Projects IRC Network,
- try or irc.<country> as your
- server and then /join #kernelnewbies". It also hosts articles,
- documents, FAQs...
+ people.
+ #kernelnewbies is on the OFTC IRC Network.
+ Try as your server and then /join #kernelnewbies.
+ The kernelnewbies website also hosts articles, documents, FAQs...
* Name: "linux-kernel mailing list archives and search engines"
diff --git a/Documentation/kernel-parameters.txt b/Documentation/kernel-parameters.txt
index 6263a2da3e2f..688760f790b1 100644
--- a/Documentation/kernel-parameters.txt
+++ b/Documentation/kernel-parameters.txt
@@ -790,8 +790,10 @@ bytes respectively. Such letter suffixes can also be entirely omitted.
is passed, kernel could allocate physical memory region
above 4G, that cause second kernel crash on system
that require some amount of low memory, e.g. swiotlb
- requires at least 64M+32K low memory. Kernel would
- try to allocate 72M below 4G automatically.
+ requires at least 64M+32K low memory, also enough extra
+ low memory is needed to make sure DMA buffers for 32-bit
+ devices won't run out. Kernel would try to allocate at
+ at least 256M below 4G automatically.
This one let user to specify own low range under 4G
for second kernel instead.
0: to disable low allocation.
@@ -972,6 +974,10 @@ bytes respectively. Such letter suffixes can also be entirely omitted.
earlycon= [KNL] Output early console device and options.
+ When used with no options, the early console is
+ determined by the stdout-path property in device
+ tree's chosen node.
Start an early, polled-mode console on a cadence serial
port at the specified address. The cadence serial port
@@ -2340,11 +2346,12 @@ bytes respectively. Such letter suffixes can also be entirely omitted.
nmi_watchdog= [KNL,BUGS=X86] Debugging features for SMP kernels
Format: [panic,][nopanic,][num]
Valid num: 0 or 1
- 0 - turn nmi_watchdog off
- 1 - turn nmi_watchdog on
+ 0 - turn hardlockup detector in nmi_watchdog off
+ 1 - turn hardlockup detector in nmi_watchdog on
When panic is specified, panic when an NMI watchdog
timeout occurs (or 'nopanic' to override the opposite
- default).
+ default). To disable both hard and soft lockup detectors,
+ please see 'nowatchdog'.
This is useful when you use a panic=... timeout and
need the box quickly up again.
diff --git a/Documentation/kselftest.txt b/Documentation/kselftest.txt
index a87d840bacfe..9bbbcdc598d9 100644
--- a/Documentation/kselftest.txt
+++ b/Documentation/kselftest.txt
@@ -54,6 +54,22 @@ To run the hotplug tests:
- note that some tests will require root privileges.
+Install selftests
+You can use tool installs selftests in default
+location which is tools/testing/selftests/kselftest or an user specified
+To install selftests in default location:
+ $ cd tools/testing/selftests
+ $ ./
+To install selftests in an user specified location:
+ $ cd tools/testing/selftests
+ $ ./ install_dir
Contributing new tests
diff --git a/Documentation/misc-devices/apds990x.txt b/Documentation/misc-devices/apds990x.txt
index d5408cade32f..454d95d623b3 100644
--- a/Documentation/misc-devices/apds990x.txt
+++ b/Documentation/misc-devices/apds990x.txt
@@ -30,7 +30,7 @@ lead to false interrupt, but that doesn't harm.
ALS contains 4 different gain steps. Driver automatically
selects suitable gain step. After each measurement, reliability of the results
-is estimated and new measurement is trigged if necessary.
+is estimated and new measurement is triggered if necessary.
Platform data can provide tuned values to the conversion formulas if
values are known. Otherwise plain sensor default values are used.
diff --git a/Documentation/misc-devices/isl29003 b/Documentation/misc-devices/isl29003
index c4ff5f38e010..80b952fd32ff 100644
--- a/Documentation/misc-devices/isl29003
+++ b/Documentation/misc-devices/isl29003
@@ -29,7 +29,7 @@ Detection
The ISL29003 does not have an ID register which could be used to identify
it, so the detection routine will just try to read from the configured I2C
-addess and consider the device to be present as soon as it ACKs the
+address and consider the device to be present as soon as it ACKs the
diff --git a/Documentation/misc-devices/max6875 b/Documentation/misc-devices/max6875
index 1e89ee3ccc1b..2f2bd0b17b5d 100644
--- a/Documentation/misc-devices/max6875
+++ b/Documentation/misc-devices/max6875
@@ -22,7 +22,7 @@ At reset, the MAX6875 reads the configuration EEPROM into its configuration
registers. The chip then begins to operate according to the values in the
-The Maxim MAX6874 is a similar, mostly compatible device, with more intputs
+The Maxim MAX6874 is a similar, mostly compatible device, with more inputs
and outputs:
vin gpi vout
MAX6874 6 4 8
diff --git a/Documentation/networking/can.txt b/Documentation/networking/can.txt
index fd1a1aad49a9..4636b94518da 100644
--- a/Documentation/networking/can.txt
+++ b/Documentation/networking/can.txt
@@ -1018,25 +1018,34 @@ solution for a couple of reasons:
$ ip link set can0 type can help
Usage: ip link set DEVICE type can
- [ bitrate BITRATE [ sample-point SAMPLE-POINT] ] |
- [ tq TQ prop-seg PROP_SEG phase-seg1 PHASE-SEG1
- phase-seg2 PHASE-SEG2 [ sjw SJW ] ]
- [ loopback { on | off } ]
- [ listen-only { on | off } ]
- [ triple-sampling { on | off } ]
- [ restart-ms TIME-MS ]
- [ restart ]
- Where: BITRATE := { 1..1000000 }
- SAMPLE-POINT := { 0.000..0.999 }
- TQ := { NUMBER }
- PROP-SEG := { 1..8 }
- PHASE-SEG1 := { 1..8 }
- PHASE-SEG2 := { 1..8 }
- SJW := { 1..4 }
- RESTART-MS := { 0 | NUMBER }
+ [ bitrate BITRATE [ sample-point SAMPLE-POINT] ] |
+ [ tq TQ prop-seg PROP_SEG phase-seg1 PHASE-SEG1
+ phase-seg2 PHASE-SEG2 [ sjw SJW ] ]
+ [ dbitrate BITRATE [ dsample-point SAMPLE-POINT] ] |
+ [ dtq TQ dprop-seg PROP_SEG dphase-seg1 PHASE-SEG1
+ dphase-seg2 PHASE-SEG2 [ dsjw SJW ] ]
+ [ loopback { on | off } ]
+ [ listen-only { on | off } ]
+ [ triple-sampling { on | off } ]
+ [ one-shot { on | off } ]
+ [ berr-reporting { on | off } ]
+ [ fd { on | off } ]
+ [ fd-non-iso { on | off } ]
+ [ presume-ack { on | off } ]
+ [ restart-ms TIME-MS ]
+ [ restart ]
+ Where: BITRATE := { 1..1000000 }
+ SAMPLE-POINT := { 0.000..0.999 }
+ TQ := { NUMBER }
+ PROP-SEG := { 1..8 }
+ PHASE-SEG1 := { 1..8 }
+ PHASE-SEG2 := { 1..8 }
+ SJW := { 1..4 }
+ RESTART-MS := { 0 | NUMBER }
- Display CAN device details and statistics:
@@ -1178,7 +1187,55 @@ solution for a couple of reasons:
The CAN device MTU can be retrieved e.g. with a SIOCGIFMTU ioctl() syscall.
N.B. CAN FD capable devices can also handle and send legacy CAN frames.
- FIXME: Add details about the CAN FD controller configuration when available.
+ When configuring CAN FD capable CAN controllers an additional 'data' bitrate
+ has to be set. This bitrate for the data phase of the CAN FD frame has to be
+ at least the bitrate which was configured for the arbitration phase. This
+ second bitrate is specified analogue to the first bitrate but the bitrate
+ setting keywords for the 'data' bitrate start with 'd' e.g. dbitrate,
+ dsample-point, dsjw or dtq and similar settings. When a data bitrate is set
+ within the configuration process the controller option "fd on" can be
+ specified to enable the CAN FD mode in the CAN controller. This controller
+ option also switches the device MTU to 72 (CANFD_MTU).
+ The first CAN FD specification presented as whitepaper at the International
+ CAN Conference 2012 needed to be improved for data integrity reasons.
+ Therefore two CAN FD implementations have to be distinguished today:
+ - ISO compliant: The ISO 11898-1:2015 CAN FD implementation (default)
+ - non-ISO compliant: The CAN FD implementation following the 2012 whitepaper
+ Finally there are three types of CAN FD controllers:
+ 1. ISO compliant (fixed)
+ 2. non-ISO compliant (fixed, like the M_CAN IP core v3.0.1 in m_can.c)
+ 3. ISO/non-ISO CAN FD controllers (switchable, like the PEAK PCAN-USB FD)
+ The current ISO/non-ISO mode is announced by the CAN controller driver via
+ netlink and displayed by the 'ip' tool (controller option FD-NON-ISO).
+ The ISO/non-ISO-mode can be altered by setting 'fd-non-iso {on|off}' for
+ switchable CAN FD controllers only.
+ Example configuring 500 kbit/s arbitration bitrate and 4 Mbit/s data bitrate:
+ $ ip link set can0 up type can bitrate 500000 sample-point 0.75 \
+ dbitrate 4000000 dsample-point 0.8 fd on
+ $ ip -details link show can0
+ 5: can0: <NOARP,UP,LOWER_UP,ECHO> mtu 72 qdisc pfifo_fast state UNKNOWN \
+ mode DEFAULT group default qlen 10
+ link/can promiscuity 0
+ can <FD> state ERROR-ACTIVE (berr-counter tx 0 rx 0) restart-ms 0
+ bitrate 500000 sample-point 0.750
+ tq 50 prop-seg 14 phase-seg1 15 phase-seg2 10 sjw 1
+ pcan_usb_pro_fd: tseg1 1..64 tseg2 1..16 sjw 1..16 brp 1..1024 \
+ brp-inc 1
+ dbitrate 4000000 dsample-point 0.800
+ dtq 12 dprop-seg 7 dphase-seg1 8 dphase-seg2 4 dsjw 1
+ pcan_usb_pro_fd: dtseg1 1..16 dtseg2 1..8 dsjw 1..4 dbrp 1..1024 \
+ dbrp-inc 1
+ clock 80000000
+ Example when 'fd-non-iso on' is added on this switchable CAN FD adapter:
+ can <FD,FD-NON-ISO> state ERROR-ACTIVE (berr-counter tx 0 rx 0) restart-ms 0
6.7 Supported CAN hardware
diff --git a/Documentation/rbtree.txt b/Documentation/rbtree.txt
index 39873ef41bf9..b9d9cc57be18 100644
--- a/Documentation/rbtree.txt
+++ b/Documentation/rbtree.txt
@@ -203,7 +203,7 @@ functions with the user provided augmentation callback when inserting
and erasing nodes.
C files implementing augmented rbtree manipulation must include
-<linux/rbtree_augmented.h> instead of <linus/rbtree.h>. Note that
+<linux/rbtree_augmented.h> instead of <linux/rbtree.h>. Note that
linux/rbtree_augmented.h exposes some rbtree implementations details
you are not expected to rely on; please stick to the documented APIs
there and do not include <linux/rbtree_augmented.h> from header files
diff --git a/Documentation/virtual/kvm/api.txt b/Documentation/virtual/kvm/api.txt
index d9ecceea5a02..29ece601008e 100644
--- a/Documentation/virtual/kvm/api.txt
+++ b/Documentation/virtual/kvm/api.txt
@@ -1774,7 +1774,7 @@ has been called, this interface is completely emulated within the kernel.
To use this to emulate the LINT1 input with KVM_CREATE_IRQCHIP, use the
following algorithm:
- - pause the vpcu
+ - pause the vcpu
- read the local APIC's state (KVM_GET_LAPIC)
- check whether changing LINT1 will queue an NMI (see the LVT entry for LINT1)
- if so, issue KVM_NMI
@@ -2798,7 +2798,7 @@ Returns: = 0 on success,
< 0 on generic error (e.g. -EFAULT or -ENOMEM),
> 0 if an exception occurred while walking the page tables
-Read or write data from/to the logical (virtual) memory of a VPCU.
+Read or write data from/to the logical (virtual) memory of a VCPU.
Parameters are specified via the following structure:
diff --git a/Documentation/virtual/kvm/devices/vm.txt b/Documentation/virtual/kvm/devices/vm.txt
index 5542c4641a3c..2d09d1ed86d0 100644
--- a/Documentation/virtual/kvm/devices/vm.txt
+++ b/Documentation/virtual/kvm/devices/vm.txt
@@ -74,7 +74,7 @@ struct kvm_s390_vm_cpu_processor {
KVM does not enforce or limit the cpu model data in any form. Take the information
retrieved by means of KVM_S390_VM_CPU_MACHINE as hint for reasonable configuration
-setups. Instruction interceptions triggered by additionally set facilitiy bits that
+setups. Instruction interceptions triggered by additionally set facility bits that
are not handled by KVM need to by imlemented in the VM driver code.
Parameters: address of buffer to store/set the processor related cpu
diff --git a/Documentation/virtual/kvm/ppc-pv.txt b/Documentation/virtual/kvm/ppc-pv.txt
index 319560646f32..e26115ce4258 100644
--- a/Documentation/virtual/kvm/ppc-pv.txt
+++ b/Documentation/virtual/kvm/ppc-pv.txt
@@ -110,7 +110,7 @@ Flags are passed to the host in the low 12 bits of the Effective Address.
The following flags are currently available for a guest to expose:
- MAGIC_PAGE_FLAG_NOT_MAPPED_NX Guest handles NX bits correclty wrt magic page
+ MAGIC_PAGE_FLAG_NOT_MAPPED_NX Guest handles NX bits correctly wrt magic page
MSR bits
diff --git a/Documentation/vm/slub.txt b/Documentation/vm/slub.txt
index b0c6d1bbb434..699d8ea5c230 100644
--- a/Documentation/vm/slub.txt
+++ b/Documentation/vm/slub.txt
@@ -280,4 +280,63 @@ of other objects.
+Extended slabinfo mode and plotting
+The slabinfo tool has a special 'extended' ('-X') mode that includes:
+ - Slabcache Totals
+ - Slabs sorted by size (up to -N <num> slabs, default 1)
+ - Slabs sorted by loss (up to -N <num> slabs, default 1)
+Additionally, in this mode slabinfo does not dynamically scale sizes (G/M/K)
+and reports everything in bytes (this functionality is also available to
+other slabinfo modes via '-B' option) which makes reporting more precise and
+accurate. Moreover, in some sense the `-X' mode also simplifies the analysis
+of slabs' behaviour, because its output can be plotted using the script. So it pushes the analysis from looking through
+the numbers (tons of numbers) to something easier -- visual analysis.
+To generate plots:
+a) collect slabinfo extended records, for example:
+ while [ 1 ]; do slabinfo -X >> FOO_STATS; sleep 1; done
+b) pass stats file(-s) to script:
+The script will pre-processes the collected records
+and generates 3 png files (and 3 pre-processing cache files) per STATS
+ - Slabcache Totals: FOO_STATS-totals.png
+ - Slabs sorted by size: FOO_STATS-slabs-by-size.png
+ - Slabs sorted by loss: FOO_STATS-slabs-by-loss.png
+Another use case, when slabinfo-gnuplot can be useful, is when you need
+to compare slabs' behaviour "prior to" and "after" some code modification.
+To help you out there, script can 'merge' the
+`Slabcache Totals` sections from different measurements. To visually
+compare N plots:
+a) Collect as many STATS1, STATS2, .. STATSN files as you need
+ while [ 1 ]; do slabinfo -X >> STATS<X>; sleep 1; done
+b) Pre-process those STATS files
+c) Execute in '-t' mode, passing all of the
+generated pre-processed *-totals
+ -t STATS1-totals STATS2-totals .. STATSN-totals
+This will produce a single plot (png file).
+Plots, expectedly, can be large so some fluctuations or small spikes
+can go unnoticed. To deal with that, `' has two
+options to 'zoom-in'/'zoom-out':
+ a) -s %d,%d overwrites the default image width and heigh
+ b) -r %d,%d specifies a range of samples to use (for example,
+ in `slabinfo -X >> FOO_STATS; sleep 1;' case, using
+ a "-r 40,60" range will plot only samples collected
+ between 40th and 60th seconds).
Christoph Lameter, May 30, 2007
+Sergey Senozhatsky, October 23, 2015
diff --git a/Documentation/zh_CN/filesystems/sysfs.txt b/Documentation/zh_CN/filesystems/sysfs.txt
index e230eaa33122..7d3b05edb8ce 100644
--- a/Documentation/zh_CN/filesystems/sysfs.txt
+++ b/Documentation/zh_CN/filesystems/sysfs.txt
@@ -61,7 +61,7 @@ Documentation/kobject.txt 文档以获得更多关于 kobject 接口的
内核的对象层次到用户空间。sysfs 中的顶层目录代表着内核对象层次的
-Sysfs 在与其目录关联的 sysfs_dirent 对象中内部保存一个指向实现
+Sysfs 在与其目录关联的 kernfs_node 对象中内部保存一个指向实现
目录的 kobject 的指针。以前,这个 kobject 指针被 sysfs 直接用于
kobject 文件打开和关闭的引用计数。而现在的 sysfs 实现中,kobject
引用计数只能通过 sysfs_schedule_callback() 函数直接修改。
index 162972876cd3..ddec2ee05e7b 100644
@@ -3528,13 +3528,15 @@ M: Jonathan Corbet <>
S: Maintained
F: Documentation/
+F: scripts/docproc.c
+F: scripts/kernel-doc*
X: Documentation/ABI/
X: Documentation/devicetree/
X: Documentation/acpi
X: Documentation/power
X: Documentation/spi
X: Documentation/DocBook/media
-T: git git:// docs-next
+T: git git:// docs-next
M: "James R. Van Zandt" <>
diff --git a/Makefile b/Makefile
index d5b37391195f..f71b378005f0 100644
--- a/Makefile
+++ b/Makefile
@@ -1336,7 +1336,7 @@ $(help-board-dirs): help-%:
# Documentation targets
# ---------------------------------------------------------------------------
%docs: scripts_basic FORCE
- $(Q)$(MAKE) $(build)=scripts build_docproc
+ $(Q)$(MAKE) $(build)=scripts build_docproc build_check-lc_ctype
$(Q)$(MAKE) $(build)=Documentation/DocBook $@
diff --git a/README b/README
index a326a6a6a46f..f4756ee1c918 100644
--- a/README
+++ b/README
@@ -24,7 +24,7 @@ ON WHAT HARDWARE DOES IT RUN?
today Linux also runs on (at least) the Compaq Alpha AXP, Sun SPARC and
UltraSPARC, Motorola 68000, PowerPC, PowerPC64, ARM, Hitachi SuperH, Cell,
IBM S/390, MIPS, HP PA-RISC, Intel IA-64, DEC VAX, AMD x86-64, AXIS CRIS,
- Xtensa, Tilera TILE, AVR32 and Renesas M32R architectures.
+ Xtensa, Tilera TILE, AVR32, ARC and Renesas M32R architectures.
Linux is easily portable to most general-purpose 32- or 64-bit architectures
as long as they have a paged memory management unit (PMMU) and a port of the
diff --git a/scripts/.gitignore b/scripts/.gitignore
index 12efbbefd4d7..1f78169d4254 100644
--- a/scripts/.gitignore
+++ b/scripts/.gitignore
@@ -8,6 +8,7 @@ unifdef
diff --git a/scripts/Makefile b/scripts/Makefile
index 1b2661712d44..fd0d53d4a234 100644
--- a/scripts/Makefile
+++ b/scripts/Makefile
@@ -7,6 +7,7 @@
# conmakehash: Create chartable
# conmakehash: Create arrays for initializing the kernel console tables
# docproc: Used in Documentation/DocBook
+# check-lc_ctype: Used in Documentation/DocBook
HOST_EXTRACFLAGS += -I$(srctree)/tools/include
@@ -27,14 +28,16 @@ HOSTLOADLIBES_extract-cert = -lcrypto
always := $(hostprogs-y) $(hostprogs-m)
# The following hostprogs-y programs are only build on demand
-hostprogs-y += unifdef docproc
+hostprogs-y += unifdef docproc check-lc_ctype
# These targets are used internally to avoid "is up to date" messages
-PHONY += build_unifdef build_docproc
+PHONY += build_unifdef build_docproc build_check-lc_ctype
build_unifdef: $(obj)/unifdef
build_docproc: $(obj)/docproc
+build_check-lc_ctype: $(obj)/check-lc_ctype
+ @:
subdir-$(CONFIG_MODVERSIONS) += genksyms
subdir-y += mod
diff --git a/scripts/check-lc_ctype.c b/scripts/check-lc_ctype.c
new file mode 100644
index 000000000000..9097ff5449fb
--- /dev/null
+++ b/scripts/check-lc_ctype.c
@@ -0,0 +1,11 @@
+ * Check that a specified locale works as LC_CTYPE. Used by the
+ * DocBook build system to probe for C.UTF-8 support.
+ */
+#include <locale.h>
+int main(void)
+ return !setlocale(LC_CTYPE, "");
diff --git a/scripts/kernel-doc b/scripts/kernel-doc
index 0276d2b5eefe..125b906cd1d4 100755
--- a/scripts/kernel-doc
+++ b/scripts/kernel-doc
@@ -206,59 +206,73 @@ my $type_env = '(\$\w+)';
# One for each output format
# these work fairly well
-my %highlights_html = ( $type_constant, "<i>\$1</i>",
- $type_func, "<b>\$1</b>",
- $type_struct_xml, "<i>\$1</i>",
- $type_env, "<b><i>\$1</i></b>",
- $type_param, "<tt><b>\$1</b></tt>" );
+my @highlights_html = (
+ [$type_constant, "<i>\$1</i>"],
+ [$type_func, "<b>\$1</b>"],
+ [$type_struct_xml, "<i>\$1</i>"],
+ [$type_env, "<b><i>\$1</i></b>"],
+ [$type_param, "<tt><b>\$1</b></tt>"]
+ );
my $local_lt = "\\\\\\\\lt:";
my $local_gt = "\\\\\\\\gt:";
my $blankline_html = $local_lt . "p" . $local_gt; # was "<p>"
# html version 5
-my %highlights_html5 = ( $type_constant, "<span class=\"const\">\$1</span>",
- $type_func, "<span class=\"func\">\$1</span>",
- $type_struct_xml, "<span class=\"struct\">\$1</span>",
- $type_env, "<span class=\"env\">\$1</span>",
- $type_param, "<span class=\"param\">\$1</span>" );
+my @highlights_html5 = (
+ [$type_constant, "<span class=\"const\">\$1</span>"],
+ [$type_func, "<span class=\"func\">\$1</span>"],
+ [$type_struct_xml, "<span class=\"struct\">\$1</span>"],
+ [$type_env, "<span class=\"env\">\$1</span>"],
+ [$type_param, "<span class=\"param\">\$1</span>]"]
+ );
my $blankline_html5 = $local_lt . "br /" . $local_gt;
# XML, docbook format
-my %highlights_xml = ( "([^=])\\\"([^\\\"<]+)\\\"", "\$1<quote>\$2</quote>",
- $type_constant, "<constant>\$1</constant>",
- $type_func, "<function>\$1</function>",
- $type_struct_xml, "<structname>\$1</structname>",
- $type_env, "<envar>\$1</envar>",
- $type_param, "<parameter>\$1</parameter>" );
+my @highlights_xml = (
+ ["([^=])\\\"([^\\\"<]+)\\\"", "\$1<quote>\$2</quote>"],
+ [$type_constant, "<constant>\$1</constant>"],
+ [$type_struct_xml, "<structname>\$1</structname>"],
+ [$type_param, "<parameter>\$1</parameter>"],
+ [$type_func, "<function>\$1</function>"],
+ [$type_env, "<envar>\$1</envar>"]
+ );
my $blankline_xml = $local_lt . "/para" . $local_gt . $local_lt . "para" . $local_gt . "\n";
# gnome, docbook format
-my %highlights_gnome = ( $type_constant, "<replaceable class=\"option\">\$1</replaceable>",
- $type_func, "<function>\$1</function>",
- $type_struct, "<structname>\$1</structname>",
- $type_env, "<envar>\$1</envar>",
- $type_param, "<parameter>\$1</parameter>" );
+my @highlights_gnome = (
+ [$type_constant, "<replaceable class=\"option\">\$1</replaceable>"],
+ [$type_func, "<function>\$1</function>"],
+ [$type_struct, "<structname>\$1</structname>"],
+ [$type_env, "<envar>\$1</envar>"],
+ [$type_param, "<parameter>\$1</parameter>" ]
+ );
my $blankline_gnome = "</para><para>\n";
# these are pretty rough
-my %highlights_man = ( $type_constant, "\$1",
- $type_func, "\\\\fB\$1\\\\fP",
- $type_struct, "\\\\fI\$1\\\\fP",
- $type_param, "\\\\fI\$1\\\\fP" );
+my @highlights_man = (
+ [$type_constant, "\$1"],
+ [$type_func, "\\\\fB\$1\\\\fP"],
+ [$type_struct, "\\\\fI\$1\\\\fP"],
+ [$type_param, "\\\\fI\$1\\\\fP"]
+ );
my $blankline_man = "";
# text-mode
-my %highlights_text = ( $type_constant, "\$1",
- $type_func, "\$1",
- $type_struct, "\$1",
- $type_param, "\$1" );
+my @highlights_text = (
+ [$type_constant, "\$1"],
+ [$type_func, "\$1"],
+ [$type_struct, "\$1"],
+ [$type_param, "\$1"]
+ );
my $blankline_text = "";
# list mode
-my %highlights_list = ( $type_constant, "\$1",
- $type_func, "\$1",
- $type_struct, "\$1",
- $type_param, "\$1" );
+my @highlights_list = (
+ [$type_constant, "\$1"],
+ [$type_func, "\$1"],
+ [$type_struct, "\$1"],
+ [$type_param, "\$1"]
+ );
my $blankline_list = "";
# read arguments
@@ -273,7 +287,7 @@ my $verbose = 0;
my $output_mode = "man";
my $output_preformatted = 0;
my $no_doc_sections = 0;
-my %highlights = %highlights_man;
+my @highlights = @highlights_man;
my $blankline = $blankline_man;
my $modulename = "Kernel API";
my $function_only = 0;
@@ -374,31 +388,31 @@ while ($ARGV[0] =~ m/^-(.*)/) {
my $cmd = shift @ARGV;
if ($cmd eq "-html") {
$output_mode = "html";
- %highlights = %highlights_html;
+ @highlights = @highlights_html;
$blankline = $blankline_html;
} elsif ($cmd eq "-html5") {
$output_mode = "html5";
- %highlights = %highlights_html5;
+ @highlights = @highlights_html5;
$blankline = $blankline_html5;
} elsif ($cmd eq "-man") {
$output_mode = "man";
- %highlights = %highlights_man;
+ @highlights = @highlights_man;
$blankline = $blankline_man;
} elsif ($cmd eq "-text") {
$output_mode = "text";
- %highlights = %highlights_text;
+ @highlights = @highlights_text;
$blankline = $blankline_text;
} elsif ($cmd eq "-docbook") {
$output_mode = "xml";
- %highlights = %highlights_xml;
+ @highlights = @highlights_xml;
$blankline = $blankline_xml;
} elsif ($cmd eq "-list") {
$output_mode = "list";
- %highlights = %highlights_list;
+ @highlights = @highlights_list;
$blankline = $blankline_list;
} elsif ($cmd eq "-gnome") {
$output_mode = "gnome";
- %highlights = %highlights_gnome;
+ @highlights = @highlights_gnome;
$blankline = $blankline_gnome;
} elsif ($cmd eq "-module") { # not needed for XML, inherits from calling document
$modulename = shift @ARGV;
@@ -1746,7 +1760,7 @@ sub output_declaration {
my $func = "output_${functype}_$output_mode";
if (($function_only==0) ||
( $function_only == 1 && defined($function_table{$name})) ||
- ( $function_only == 2 && !defined($function_table{$name})))
+ ( $function_only == 2 && !($functype eq "function" && defined($function_table{$name}))))
@@ -1791,8 +1805,8 @@ sub dump_struct($$) {
$nested = $1;
# ignore members marked private:
- $members =~ s/\/\*\s*private:.*?\/\*\s*public:.*?\*\///gos;
- $members =~ s/\/\*\s*private:.*//gos;
+ $members =~ s/\/\*\s*private:.*?\/\*\s*public:.*?\*\///gosi;
+ $members =~ s/\/\*\s*private:.*//gosi;
# strip comments:
$members =~ s/\/\*.*?\*\///gos;
$nested =~ s/\/\*.*?\*\///gos;
@@ -2416,12 +2430,13 @@ sub process_file($) {
my $descr;
my $in_purpose = 0;
my $initial_section_counter = $section_counter;
+ my ($orig_file) = @_;
if (defined($ENV{'SRCTREE'})) {
- $file = "$ENV{'SRCTREE'}" . "/" . "@_";
+ $file = "$ENV{'SRCTREE'}" . "/" . $orig_file;
else {
- $file = "@_";
+ $file = $orig_file;
if (defined($source_map{$file})) {
$file = $source_map{$file};
@@ -2665,7 +2680,7 @@ sub process_file($) {
print "<refentry>\n";
print " <refnamediv>\n";
print " <refname>\n";
- print " ${file}\n";
+ print " ${orig_file}\n";
print " </refname>\n";
print " <refpurpose>\n";
print " Document generation inconsistency\n";
@@ -2679,7 +2694,7 @@ sub process_file($) {
print " <para>\n";
print " The template for this document tried to insert\n";
print " the structured comment from the file\n";
- print " <filename>${file}</filename> at this point,\n";
+ print " <filename>${orig_file}</filename> at this point,\n";
print " but none was found.\n";
print " This dummy section is inserted to allow\n";
print " generation to continue.\n";
@@ -2696,9 +2711,11 @@ $kernelversion = get_kernel_version();
# generate a sequence of code that will splice in highlighting information
# using the s// operator.
-foreach my $pattern (sort keys %highlights) {
-# print STDERR "scanning pattern:$pattern, highlight:($highlights{$pattern})\n";
- $dohighlight .= "\$contents =~ s:$pattern:$highlights{$pattern}:gs;\n";
+foreach my $k (keys @highlights) {
+ my $pattern = $highlights[$k][0];
+ my $result = $highlights[$k][1];
+# print STDERR "scanning pattern:$pattern, highlight:($result)\n";
+ $dohighlight .= "\$contents =~ s:$pattern:$result:gs;\n";
# Read the file that maps relative names to absolute names for