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Eric W. Biederman
- Pass the user namespace the uid and gid values in the xattr are stored in into posix_acl_from_xattr. - Pass the user namespace kuid and kgid values should be converted into when storing uid and gid values in an xattr in posix_acl_to_xattr. - Modify all callers of posix_acl_from_xattr and posix_acl_to_xattr to pass in &init_user_ns. In the short term this change is not strictly needed but it makes the code clearer. In the longer term this change is necessary to be able to mount filesystems outside of the initial user namespace that natively store posix acls in the linux xattr format. Cc: Theodore Tso <firstname.lastname@example.org> Cc: Andrew Morton <email@example.com> Cc: Andreas Dilger <firstname.lastname@example.org> Cc: Jan Kara <email@example.com> Cc: Al Viro <firstname.lastname@example.org> Signed-off-by: "Eric W. Biederman" <email@example.com>
|9 years ago|
|Kconfig||13 years ago|
|LICENCE||15 years ago|
|Makefile||14 years ago|
|README.Locking||14 years ago|
|TODO||11 years ago|
|acl.c||9 years ago|
|acl.h||10 years ago|
|background.c||10 years ago|
|build.c||10 years ago|
|compr.c||10 years ago|
|compr.h||10 years ago|
|compr_lzo.c||10 years ago|
|compr_rtime.c||11 years ago|
|compr_rubin.c||10 years ago|
|compr_zlib.c||10 years ago|
|debug.c||10 years ago|
|debug.h||10 years ago|
|dir.c||9 years ago|
|erase.c||10 years ago|
|file.c||10 years ago|
|fs.c||10 years ago|
|gc.c||10 years ago|
|ioctl.c||11 years ago|
|jffs2_fs_i.h||11 years ago|
|jffs2_fs_sb.h||10 years ago|
|malloc.c||10 years ago|
|nodelist.c||10 years ago|
|nodelist.h||11 years ago|
|nodemgmt.c||10 years ago|
|os-linux.h||10 years ago|
|read.c||10 years ago|
|readinode.c||10 years ago|
|scan.c||10 years ago|
|security.c||10 years ago|
|summary.c||10 years ago|
|summary.h||13 years ago|
|super.c||10 years ago|
|symlink.c||10 years ago|
|wbuf.c||10 years ago|
|write.c||10 years ago|
|writev.c||10 years ago|
|xattr.c||10 years ago|
|xattr.h||10 years ago|
|xattr_trusted.c||12 years ago|
|xattr_user.c||12 years ago|
JFFS2 LOCKING DOCUMENTATION
At least theoretically, JFFS2 does not require the Big Kernel Lock
(BKL), which was always helpfully obtained for it by Linux 2.4 VFS
code. It has its own locking, as described below.
This document attempts to describe the existing locking rules for
JFFS2. It is not expected to remain perfectly up to date, but ought to
be fairly close.
The alloc_sem is a per-filesystem mutex, used primarily to ensure
contiguous allocation of space on the medium. It is automatically
obtained during space allocations (jffs2_reserve_space()) and freed
upon write completion (jffs2_complete_reservation()). Note that
the garbage collector will obtain this right at the beginning of
jffs2_garbage_collect_pass() and release it at the end, thereby
preventing any other write activity on the file system during a
garbage collect pass.
When writing new nodes, the alloc_sem must be held until the new nodes
have been properly linked into the data structures for the inode to
which they belong. This is for the benefit of NAND flash - adding new
nodes to an inode may obsolete old ones, and by holding the alloc_sem
until this happens we ensure that any data in the write-buffer at the
time this happens are part of the new node, not just something that
was written afterwards. Hence, we can ensure the newly-obsoleted nodes
don't actually get erased until the write-buffer has been flushed to
With the introduction of NAND flash support and the write-buffer,
the alloc_sem is also used to protect the wbuf-related members of the
jffs2_sb_info structure. Atomically reading the wbuf_len member to see
if the wbuf is currently holding any data is permitted, though.
Ordering constraints: See f->sem.
File Mutex f->sem
This is the JFFS2-internal equivalent of the inode mutex i->i_sem.
It protects the contents of the jffs2_inode_info private inode data,
including the linked list of node fragments (but see the notes below on
The reason that the i_sem itself isn't used for this purpose is to
avoid deadlocks with garbage collection -- the VFS will lock the i_sem
before calling a function which may need to allocate space. The
allocation may trigger garbage-collection, which may need to move a
node belonging to the inode which was locked in the first place by the
VFS. If the garbage collection code were to attempt to lock the i_sem
of the inode from which it's garbage-collecting a physical node, this
lead to deadlock, unless we played games with unlocking the i_sem
before calling the space allocation functions.
Instead of playing such games, we just have an extra internal
mutex, which is obtained by the garbage collection code and also
by the normal file system code _after_ allocation of space.
1. Never attempt to allocate space or lock alloc_sem with
any f->sem held.
2. Never attempt to lock two file mutexes in one thread.
No ordering rules have been made for doing so.
This is used to serialise access to the eraseblock lists, to the
per-eraseblock lists of physical jffs2_raw_node_ref structures, and
(NB) the per-inode list of physical nodes. The latter is a special
case - see below.
As the MTD API no longer permits erase-completion callback functions
to be called from bottom-half (timer) context (on the basis that nobody
ever actually implemented such a thing), it's now sufficient to use
a simple spin_lock() rather than spin_lock_bh().
Note that the per-inode list of physical nodes (f->nodes) is a special
case. Any changes to _valid_ nodes (i.e. ->flash_offset & 1 == 0) in
the list are protected by the file mutex f->sem. But the erase code
may remove _obsolete_ nodes from the list while holding only the
erase_completion_lock. So you can walk the list only while holding the
erase_completion_lock, and can drop the lock temporarily mid-walk as
long as the pointer you're holding is to a _valid_ node, not an
The erase_completion_lock is also used to protect the c->gc_task
pointer when the garbage collection thread exits. The code to kill the
GC thread locks it, sends the signal, then unlocks it - while the GC
thread itself locks it, zeroes c->gc_task, then unlocks on the exit path.
This spinlock protects the hashed list (c->inocache_list) of the
in-core jffs2_inode_cache objects (each inode in JFFS2 has the
correspondent jffs2_inode_cache object). So, the inocache_lock
has to be locked while walking the c->inocache_list hash buckets.
This spinlock also covers allocation of new inode numbers, which is
currently just '++->highest_ino++', but might one day get more complicated
if we need to deal with wrapping after 4 milliard inode numbers are used.
Note, the f->sem guarantees that the correspondent jffs2_inode_cache
will not be removed. So, it is allowed to access it without locking
the inocache_lock spinlock.
If both erase_completion_lock and inocache_lock are needed, the
c->erase_completion has to be acquired first.
This mutex is only used by the erase code which frees obsolete node
references and the jffs2_garbage_collect_deletion_dirent() function.
The latter function on NAND flash must read _obsolete_ nodes to
determine whether the 'deletion dirent' under consideration can be
discarded or whether it is still required to show that an inode has
been unlinked. Because reading from the flash may sleep, the
erase_completion_lock cannot be held, so an alternative, more
heavyweight lock was required to prevent the erase code from freeing
the jffs2_raw_node_ref structures in question while the garbage
collection code is looking at them.
Suggestions for alternative solutions to this problem would be welcomed.
This read/write semaphore protects against concurrent access to the
write-behind buffer ('wbuf') used for flash chips where we must write
in blocks. It protects both the contents of the wbuf and the metadata
which indicates which flash region (if any) is currently covered by
Lock wbuf_sem last, after the alloc_sem or and f->sem.
This read/write semaphore protects against concurrent access to the
xattr related objects which include stuff in superblock and ic->xref.
In read-only path, write-semaphore is too much exclusion. It's enough
by read-semaphore. But you must hold write-semaphore when updating,
creating or deleting any xattr related object.
Once xattr_sem released, there would be no assurance for the existence
of those objects. Thus, a series of processes is often required to retry,
when updating such a object is necessary under holding read semaphore.
For example, do_jffs2_getxattr() holds read-semaphore to scan xref and
xdatum at first. But it retries this process with holding write-semaphore
after release read-semaphore, if it's necessary to load name/value pair
Lock xattr_sem last, after the alloc_sem.