Switch it to ->lru

Switch them over to page.lru

Switch the page allocator over to using page.lru for the buddy lists.

slab.c is using page->list.  Switch it over to using page->lru so we can
remove page.list.

This code is playing with page->lru from pages which came from slab.  But to
remove page->list we need to convert slab over to using page->lru.  So we
cannot allow the i386 pagetable code to go scribbling on the ->lru field of
active slab pages.

This optimisation was pretty thin, and it is more important to shrink the
pageframe (on all architectures).

Remove remaining references to address_space.clean_pages.

Instead, use a radix-tree walk of the pages which are tagged as being under
writeback.

The new function wait_on_page_writeback_range() was generalised out of
filemap_fdatawait().  We can later use this to provide concurrent fsync of
just a section of a file.

Now remove address_space.io_pages.

Juggle dirty pages and dirty inodes and dirty superblocks and various
different writeback modes and livelock avoidance and fairness to recover from
the loss of mapping->io_pages.

Move everything over to walking the radix tree via the PAGECACHE_TAG_DIRTY
tag.  Remove address_space.dirty_pages.

Arrange for under-writeback pages to be marked thus in their pagecache radix
tree.

Arrange for all dirty pagecache pages to be tagged as dirty within their
radix tree.

Intro to these patches:

- Major surgery against the pagecache, radix-tree and writeback code.  This
  work is to address the O_DIRECT-vs-buffered data exposure horrors which
  we've been struggling with for months.

  As a side-effect, 32 bytes are saved from struct inode and eight bytes
  are removed from struct page.  At a cost of approximately 2.5 bits per page
  in the radix tree nodes on 4k pagesize, assuming the pagecache is densely
  populated.  Not all pages are pagecache; other pages gain the full 8 byte
  saving.

  This change will break any arch code which is using page->list and will
  also break any arch code which is using page->lru of memory which was
  obtained from slab.

  The basic problem which we (mainly Daniel McNeil) have been struggling
  with is in getting a really reliable fsync() across the page lists while
  other processes are performing writeback against the same file.  It's like
  juggling four bars of wet soap with your eyes shut while someone is
  whacking you with a baseball bat.  Daniel pretty much has the problem
  plugged but I suspect that's just because we don't have testcases to
  trigger the remaining problems.  The complexity and additional locking
  which those patches add is worrisome.

  So the approach taken here is to remove the page lists altogether and
  replace the list-based writeback and wait operations with in-order
  radix-tree walks.

  The radix-tree code has been enhanced to support "tagging" of pages, for
  later searches for pages which have a particular tag set.  This means that
  we can ask the radix tree code "find me the next 16 dirty pages starting at
  pagecache index N" and it will do that in O(log64(N)) time.

  This affects I/O scheduling potentially quite significantly.  It is no
  longer the case that the kernel will submit pages for I/O in the order in
  which the application dirtied them.  We instead submit them in file-offset
  order all the time.

  This is likely to be advantageous when applications are seeking all over
  a large file randomly writing small amounts of data.  I haven't performed
  much benchmarking, but tiobench random write throughput seems to be
  increased by 30%.  Other tests appear to be unaltered.  dbench may have got
  10-20% quicker, but it's variable.

  There is one large file which everyone seeks all over randomly writing
  small amounts of data: the blockdev mapping which caches filesystem
  metadata.  The kernel's IO submission patterns for this are now ideal.


  Because writeback and wait-for-writeback use a tree walk instead of a
  list walk they are no longer livelockable.  This probably means that we no
  longer need to hold i_sem across O_SYNC writes and perhaps fsync() and
  fdatasync().  This may be beneficial for databases: multiple processes
  writing and syncing different parts of the same file at the same time can
  now all submit and wait upon writes to just their own little bit of the
  file, so we can get a lot more data into the queues.

  It is trivial to implement a part-file-fdatasync() as well, so
  applications can say "sync the file from byte N to byte M", and multiple
  applications can do this concurrently.  This is easy for ext2 filesystems,
  but probably needs lots of work for data-journalled filesystems and XFS and
  it probably doesn't offer much benefit over an i_semless O_SYNC write.


  These patches can end up making ext3 (even) slower:

	for i in 1 2 3 4
	do
		dd if=/dev/zero of=$i bs=1M count=2000 &
	done          

  runs awfully slow on SMP.  This is, yet again, because all the file
  blocks are jumbled up and the per-file linear writeout causes tons of
  seeking.  The above test runs sweetly on UP because the on UP we don't
  allocate blocks to different files in parallel.

  Mingming and Badari are working on getting block reservation working for
  ext3 (preallocation on steroids).  That should fix ext3 up.


This patch:

- Later, we'll need to access the radix trees from inside disk I/O
  completion handlers.  So make mapping->page_lock irq-safe.  And rename it
  to tree_lock to reliably break any missed conversions.

Add radix-tree tagging so we can look up dirty or writeback pages in
O(log64(n)) time.

Each radix-tree node gains two bits for each slot: one for page dirtiness and
one for page writebackness.

If a tag bit is set on a leaf node, it indicates that item at the
corresponding slot is tagged (say, a dirty page).

If a tag bit is set in a non-leaf node it indicates that the same tag bit is
set in the subtree which lies under the corresponding slot.  ie: "there is a
dirty page under here somewhere, but you need to search down further to find
it".

A gang lookup function is provided which can walk the radix tree in
logarithmic time looking for items which are tagged, starting from a
specified offset.  We use this for in-order searches for dirty or writeback
pages.

There is a userspace test harness for this code at

http://www.zip.com.au/~akpm/linux/patches/stuff/rtth.tar.gz

This function is setting page->mapping = swapper_space, but isn't actually
adding the page to swapcache.  This triggers soon-to-be-added BUGs in the
radix tree code.

So temporarily add these pages to swapcache for real.

Also, make rw_swap_page_sync() go away if it has no callers.

From: Suparna Bhattacharya <suparna@in.ibm.com>,
      Daniel McNeil <daniel@osdl.org>

This patch ensures that when the DIO code falls back to buffered i/o after
having submitted part of the i/o, then buffered i/o is issued only for the
remaining part of the request (i.e.  the part not already covered by DIO),
rather than redo the entire i/o.  Now, instead of returning written ==
-ENOTBLK, generic_file_direct_IO returns the number of bytes already handled
by DIO, so that the caller knows how much of the I/O is left to be handled
via fallback to buffered write.

We need to careful not to access dio fields if its possible that the dio
could already have been freed asynchronously during i/o completion.  A tricky
part of this involves plugging the window between the decrement of bio_count
and accessing dio->waiter during i/o completion where the dio could get freed
by the submission path.  This potential "bio_count race" was tackled (by
Daniel) by changing bio_list_lock into bio_lock and using that for all the
bio fields.  Now bio_count and bios_in_flight have been converted from
atomics into int and are both protected by the bio_lock.  The race in
finished_one_bio() could thus be fixed by leaving the bio_count at 1 until
after the dio_complete() and then doing the bio_count decrement and wakeup
holding the bio_lock.  It appears that shifting to the spin_lock instead of
atomic_inc/decs is ok performance wise as well.

Update:

An AIO O_DIRECT request was extending the file so it was done
synchronously.  However, the request got an EFAULT and direct_io_worker()
was calling aio_complete() on the iocb and returning the EFAULT.  When
io_submit_one() got the EFAULT return, it assume it had to call
aio_complete() since the i/o never got queued.

The fix is for direct_io_worker() to only call aio_complete() when the
upper layer is going to return -EIOCBQUEUED and not when getting errors
that are being return to the submit path.

From: Suparna Bhattacharya <suparna@in.ibm.com>

Fixes the following remaining issues with the DIO code:

1. During DIO file extends, intermediate writes could extend i_size
   exposing unwritten blocks to intermediate reads (Soln: Don't drop i_sem
   for file extends)

2. AIO-DIO file extends may update i_size before I/O completes,
   exposing unwritten blocks to intermediate reads.  (Soln: Force AIO-DIO
   file extends to be synchronous)

3. AIO-DIO writes to holes call aio_complete() before falling back to
   buffered I/O !  (Soln: Avoid calling aio_complete() if -ENOTBLK)

4. AIO-DIO writes to an allocated region followed by a hole, falls back
   to buffered i/o without waiting for already submitted i/o to complete;
   might return to user-space, which could overwrite the buffer contents
   while they are still being written out by the kernel (Soln: Always wait
   for submitted i/o to complete before falling back to buffered i/o)

From: Badari Pulavarty <pbadari@us.ibm.com>

1) blkdev_direct_IO() calls blockdev_direct_IO() instead of
   blockdev_direct_IO_no_locking().

2) writev entry point is generic_file_writev() which grabs i_sem.  It
   should use generic_file_write_nolock() instead.

Fix a race which was identified by Daniel McNeil <daniel@osdl.org>

If a buffer_head is under I/O due to JBD's ordered data writeout (which uses
ll_rw_block()) then either filemap_fdatawrite() or filemap_fdatawait() need
to wait on the buffer's existing I/O.

Presently neither will do so, because __block_write_full_page() will not
actually submit any I/O and will hence not mark the page as being under
writeback.

The best-performing fix would be to somehow mark the page as being under
writeback and defer waiting for the ll_rw_block-initiated I/O until
filemap_fdatawait()-time.  But this is hard, because in
__block_write_full_page() we do not have control of the buffer_head's end_io
handler.  Possibly we could make JBD call into end_buffer_async_write(), but
that gets nasty.

This patch makes __block_write_full_page() wait for any buffer_head I/O to
complete before inspecting the buffer_head state.  It only does this in the
case where __block_write_full_page() was called for a "data-integrity" write:
(wbc->sync_mode != WB_SYNC_NONE).

Probably it doesn't matter, because kjournald is currently submitting (or has
already submitted) all dirty buffers anyway.

From: Badari Pulavarty, Suparna Bhattacharya, Andrew Morton

Forward port of Stephen Tweedie's DIO fixes from 2.4, to fix various DIO vs
buffered IO exposures involving races causing:

(a) stale data from uninstantiated blocks to be read, e.g.

    - O_DIRECT reads against buffered writes to a sparse region

    - O_DIRECT writes to a sparse region against buffered reads

(b) potential data corruption with

    - O_DIRECT IOs against truncate

    due to writes to truncated blocks (which may have been reallocated to
    another file).

Summary of fixes:

1) All the changes affect only regular files.  RAW/O_DIRECT on block are
   unaffected. 

2) The DIO code will not fill in sparse regions on a write.  Instead
   -ENOTBLK is returned and the generic file write code would fallthrough to
   buffered IO in this case followed by writing through the pages to disk
   using filemap_fdatawrite/wait.

3) i_sem is held during both DIO reads and writes.  For reads, and writes
   to already allocated blocks, it is released right after IO is issued,
   while for writes to newly allocated blocks (e.g file extending writes and
   hole overwrites) it is held all the way through until IO completes (and
   data is committed to disk).

4) filemap_fdatawrite/wait are called under i_sem to synchronize buffered
   pages to disk blocks before issuing DIO.

5) A new rwsem (i_alloc_sem) is held in shared mode all the while a DIO
   (read or write) is in progress, and in exclusive mode by truncate to guard
   against deallocation of data blocks during DIO. 

6) All this new locking has been pushed down into blockdev_direct_IO to
   avoid interfering with NFS direct IO.  The locks are taken in the order
   i_sem followed by i_alloc_sem.  While i_sem may be released after IO
   submission in some cases, i_alloc_sem is held through until dio_complete
   (in the case of AIO-DIO this happens through the IO completion callback).

7) i_sem and i_alloc_sem are not held for the _nolock versions of write
   routines, as used by blockdev and XFS.  Filesystems can specify the
   needs_special_locking parameter to __blockdev_direct_IO from their direct
   IO address space op accordingly.

Note from Badari:
Here is the locking (when needs_special_locking is true):

(1) generic_file_*_write() holds i_sem (as before) and calls
    ->direct_IO().  blockdev_direct_IO gets i_alloc_sem and call
    direct_io_worker().

(2) generic_file_*_read() does not hold any locks.  blockdev_direct_IO()
    gets i_sem and then i_alloc_sem and calls direct_io_worker() to do the
    work

(3) direct_io_worker() does the work and drops i_sem after submitting IOs
    if appropriate and drops i_alloc_sem after completing IOs.

From: Matt Mackall <mpm@selenic.com>

From: Zwane Mwaikambo <zwane@arm.linux.org.uk>

This enables deep powersaving mode on Geode boxes.

From: Matt Mackall <mpm@selenic.com>

drop quota array in inode struct if no quota support

From: Matt Mackall <mpm@selenic.com>

The nswap and cnswap variables counters have never been incremented as
Linux doesn't do task swapping.

From: Matt Mackall <mpm@selenic.com>

Make CONFIG_EMBEDDED description more accurate

From: Christoph Hellwig <hch@lst.de>

the maintainer doesn't response unfortauntely, but removing these from
net_devices unconditionally is the 2.6 way to go, there's no more module
refcounting on net devices.

From: "Luiz Fernando N. Capitulino" <lcapitulino@prefeitura.sp.gov.br>

sound/oss/wavfront.c: At top level:
sound/oss/wavfront.c:2498: warning: `errno' defined but not used

From: Christoph Hellwig <hch@lst.de>

Kill magic ide/sound makedev scripts in scripts/.  The userland MAKEDEV is
the proper place and already has support for them.

From: Martin Schwidefsky <schwidefsky@de.ibm.com>

Just found an small bug in pgalloc for s390*.  Comparing notes with other
architectures I found that pte_alloc_one is sick for alpha and sparc64 as
well.

From: Stephen Smalley <sds@epoch.ncsc.mil>

This patch fixes the type of the ssec pointer in the sk_free_security
function.  This has no current impact as the magic element is the top of each
structure.  Thanks to Chad Hanson of TCS for discovering the bug and
submitting the patch.

From: "Luiz Fernando N. Capitulino" <lcapitulino@prefeitura.sp.gov.br>

drivers/media/dvb/frontends/stv0299.c:356: warning: unused variable `i'

From: "Nguyen, Tom L" <tom.l.nguyen@intel.com>

Adds MSI support for ia64.

- Modified existing code in drivers/pci/msi.c and drivers/pci/msi.h to
  include MSI support on IA64 platform.

- Based on the comments received from Zwane Mwaikambo and David Mosberger,
  this patch consolidates the vector allocators as
  assign_irq_vector(AUTO_ASSIGN) has the same semantics as
  ia64_alloc_vector() by converting the existing uses of ia64_alloc_vector()
  to assign_irq_vector(AUTO_ASSIGN).

- Based on the comments received from Zwane Mwaikambo, this patch
  consolidates the semantics of vector allocator assign_irq_vector() in
  drivers/pci/msi.c into the relevant architecture's vector allocator
  assign_irq_vector() in arch/i386/kernel/io_apic.c.

- Regarding vector allocation, this patch modifies the existing function
  assign_irq_vector() to maximize the number of allocated vectors to 188
  before going -ENOSPC.

- Based on your comments, this patch creates <asm-i386/msi.h>,
  <asm-ia64/msi.h> and <asm-x86_64/msi.h>, includes <asm/msi.h> from within
  drivers/pci/msi.h and then places all the code which is currently under
  ifdef in msi.h into the relevant architecture's <asm/msi.h> file.

- Based on your comments, this patch places pci_vector_resources() in
  existing drivers/pci/msi.c in the relevant architecture implementations
  such as into arch/.../pci/irq.c.

From: James Cleverdon <jamesclv@us.ibm.com>

Bump up MAX_MP_BUSSES for summit/generic subarch to cope with big IBM x440
systems.

From: James Cleverdon <jamesclv@us.ibm.com>

Break out the definition of NR_IRQ_VECTORS, etc from irq_vectors.h into
irq_vectors_limits.h, so we can change it per subarch without having code
duplication for the rest of the file.  Stick the same values back for
mach-default, and override them for mach-summit/generic which needs bigger
limits.

From: Rusty Russell <rusty@rustcorp.com.au>

Agustin Martin <agmartin@debian.org> pointed out that this doesn't work:

	options ide-mod options="ide=nodma hdc=cdrom"

The quotes are understood by kernel/params.c (ie.  it skips over spaces
inside them), but are not stripped before handing to the underlying
function.  They should be.

From: Hugh Dickins <hugh@veritas.com>

Kevin P.  Fleming pointed out that the 2.6 tmpfs does not allow writing huge
sparse files.  This is an unintended side-effect of the strict memory commit
changes: which should make no difference.

The solution is to treat the tmpfs files (of variable size) and the shmem
objects (of fixed size) differently: sounds nasty but works out well.  The
shmem objects follow the VM preallocation convention as before, but the tmpfs
files revert to allocation on demand as a filesystem would.  If there's not
enough memory to write to a tmpfs hole, it is reported as -ENOSPC rather than
-ENOMEM, so the mmap writer gets SIGBUS rather than everyone else getting
OOM-killed.

From: William Lee Irwin III <wli@holomorphy.com>

Chang bitmap_shift_left()/bitmap_shift_right() to have O(1) stackspace
requirements.

Given zeroed tail preconditions these implementations satisfy zeroed tail
postconditions, which makes them compatible with whatever changes from Paul
Jackson one may want to merge in the future.  No particular effort was
required to ensure this.

A small (but hopefully forgiveable) cleanup is a spelling correction:
s/bitmap_shift_write/bitmap_shift_right/ in one of the kerneldoc comments.

The primary effect of the patch is to remove the MAX_BITMAP_BITS
limitation, so restoring the NR_CPUS to be limited only by stackspace and
slab allocator maximums.  They also look vaguely more efficient than the
current code, though as this was not done for performance reasons, no
performance testing was done.

From: Marcelo Tosatti <marcelo.tosatti@cyclades.com>

From: Alain Knaff <alain.knaff@lll.lu>

This patch adds support for floppy disks whose sectors are numbered
starting at 0 rather than 1 as usual disks would be.  This format is used
for some CP/M disks, and also for certain music samplers (such as Ensoniq
Ensoniq EPS 16plus).

In order to use it, you need an fdutils with the current patch from
http://fdutils.linux.lu as well, and then do setfdrpm /dev/fd0 dd zerobased
sect=10 or setfdprm /dev/fd0 hd zerobased sect.

In addtion, the patch also fixes my email addresses.  I no longer use
pobox.com.

From: Rusty Russell <rusty@rustcorp.com.au>

Brian Gerst's patch which moved __this_module out from module.h into the
module post-processing had a side effect.  genksyms didn't see the
undefined symbols for modules without a module_init (or module_exit), and
hence didn't generate a version for them, causing the kernel to be tainted.

The simple solution is to always include the versions for these functions. 
Also includes two cleanups:

1) alloc_symbol is easier to use if it populates ->next for us.

2) add_exported_symbol should set owner to module, not head of module
   list (we don't use this field in entries in that list, fortunately).

From: Brian Gerst <bgerst@didntduck.org>

Move the __this_module structure to the modpost code where it really
belongs.

Eric Dumazet <dada1@cosmosbay.com>

We can avoid evaluating `current' in a few places.