struct gendisk and partition parsers divorced; all these parsers (IBM style,
disklabel, etc.) just fill the structure they get from check_partitions().

Actual setting the things up (filling hd_struct arrays, telling RAID that
we had found partitions worth a look, etc.) is taken into check_partitions()
and done only when we are done with parsing.  Parsers don't know (or care)
what majors/minors they are dealing with; that knowledge also went to
check_partitions().

a bunch of places doing invalidate_device() either didn't need it at all
or actually wanted wipe_partitions().  Switched.

unrelated to the rest, replaces home-grown (racy) semaphores in fs/hfs
with the real thing.

We should _not_ update the current LDT if it's not the current
MM that we are tearing down.

it unconditional for now.

into home.transmeta.com:/home/torvalds/v2.5/linux

This can be overridden by editing the .config file if you really want it.

into home.transmeta.com:/home/torvalds/v2.5/linux

This includes the security_* functions, and the default and capability
modules.

This is needed due to the next header file changes.

This patch changes cont_prepare_write(), in order to support a 4G-1
file for FAT32.

 int cont_prepare_write(struct page *page, unsigned offset,
-		unsigned to, get_block_t *get_block, unsigned long *bytes)
+		unsigned to, get_block_t *get_block, loff_t *bytes)

And it fixes broken adfs/affs/fat/hfs/hpfs/qnx4 by this
cont_prepare_write() change.

into home.transmeta.com:/home/torvalds/v2.5/linux

Been looking at a workload which involves several processes which seek
around and read from a large file.  There are a few problems:
generic_file_lseek is bouncing i_sem around like mad, and readahead is
doing lots of pointless pagecache probing.

This patch addresses readahead.

Presumably the change will be larger on machines which have higher
bandwidth memory than my test box, of which there are many.

This patch teaches readahead to detect the situation where no IO is
actually being performed as a result of its actions.  Now, we don't
want to sacrifice IO efficiency to save a bit of CPU, so the code is
very cautious.  But eventually, after some tens of consecutive
readahead attempts were found to perform no I/O at all, readahead will
turn itself off.

readahead will be turned on again when either generic_file_read() or
filemap_nopage() get a pagecache miss.  The function
handle_ra_thrashing() has been renamed to handle_ra_miss() to reflect
its widened role.

A performance bug in page_cache_readround() was fixed - if
ra->next_size is zero, that function needs to leave it well alone,
because next_size==0 is a magic value meaning that the file has just
been opened and that readahead needs to get aggressive.  This change
makes a `make dep' run at the same speed as in the 2.4 kernel.  It used
to take 4x as long...

`make dep' is an interesting test because it uses mmap to read the files.

The kernel has a number of problems wrt heavy write traffic to multiple
spindles.  What keeps on happening is that all processes which are
responsible for writeback get blocked on one of the queues and all the
others fall idle.

This happens in the balance_dirty_pages() path (balance_dirty() in 2.4)
and in the page reclaim code, when a dirty page is found on the LRU.

The latter is particularly bad because it causes "innocent" processes
to be suspended for long periods due to the activity of heavy writers.

The general idea is: the primary resource for writeback should be the
process which is dirtying memory.  The secondary resource is the
pdflush pool (although this is mainly for providing async writeback in
the presence of light-moderate loads).  Add the final
oh-gee-we-screwed-up resource for writeback is a caller to
shrink_cache().

This patch addresses the balance_dirty_pages() path.  This code was
initially modelled on the 2.4 writeback scheme: throttled processes
writeback all data regardless of its queue.  Instead, the patch changes
it so that the balance_dirty_pages() caller only writes back pages
which are dirty against the queue which that caller just dirtied.

So the effect is a better allocation of writeback resources across the
queues and increased parallelism.

The per-queue writeback is implemented by using
mapping->backing_dev_info as a search key during the walk across the
superblocks and inodes.

The patch also fixes an initialisation problem in
block_dev.c:do_open(): it was setting up the blockdev's
mapping->backing_dev_info too early, before the queue has been
identified.

Generally, this patch doesn't help much, because of the stalls in the
page allocator.  I have a patch which mostly fixes that up, and taken
together the kernel is achieving almost platter speed against six
spindles, but only when the system has a small amount of memory.  More
work is needed there.

A tasty patch from Hugh Dickens.  radix_tree_insert() fails if something
was already present at the target index, so that error can be
propagated back through add_to_page_cache().  Hence
add_to_page_cache_unique() is obsolete.

Hugh's patch removes add_to_page_cache_unique() and cleans up a bunch of
stuff.

Some cleanup from the surprise direct-to-bio for O_DIRECT merge.

- Remove bits and pieces from the kiobuf implementation

- Replace the waitqueue in struct dio with just a task_struct pointer
  and use wake_up_process.  (Ben).

- Only take mmap_sem around the individual calls to get_user_pages().
   (It pins the vmas, yes?)

- Remove some debug code.

- Fix JFS.

Cleanup patch from Martin Bligh: convert some loops which want to be
`for' loops into that, and add some commentary.

generic_writepages() is just a wrapper around mpage_writepages(), so
inline it.

Put the CHECK_EMERGENCY_SYNC back into the kupdate function.  I seem to
keep removing it.

Updated forward-port of Aodrea's O_DIRECT open() checks.  If the user
asked for O_DIRECT and the inode has no mapping or no a_ops then fail
the open up-front.

A patch from Rik which adds some operational statitics to the VM.

In /proc/meminfo:

PageTables:	Amount of memory used for process pagetables
PteChainTot:	Amount of memory allocated for pte_chain objects
PteChainUsed:	Amount of memory currently in use for pte chains.

In /proc/stat:

pageallocs:	Number of pages allocated in the page allocator
pagefrees:	Number of pages returned to the page allocator

		(These can be used to measure the allocation rate)

pageactiv:	Number of pages activated (moved to the active list)
pagedeact:	Number of pages deactivated (moved to the inactive list)
pagefault:	Total pagefaults
majorfault:	Major pagefaults
pagescan:	Number of pages which shrink_cache looked at
pagesteal:	Number of pages which shrink_cache freed
pageoutrun:	Number of calls to try_to_free_pages()
allocstall:	Number of calls to balance_classzone()


Rik will be writing a userspace app which interprets these things.

The /proc/meminfo stats are efficient, but the /proc/stat accumulators
will cause undesirable cacheline bouncing.  We need to break the disk
statistics out of struct kernel_stat and make everything else in there
per-cpu.  If that doesn't happen in time for 2.6 then we disable
KERNEL_STAT_INC().

Patch from David McCracken.  It is an optimisation to the rmap
pte_chains.

In the common case where a page is mapped by only a single pte, we
don't need to allocate a pte_chain structure.  Just make the page's
pte_chain pointer point straight at that pte and flag this with
PG_direct.

Fix to the page reclaim code from Rik.

Anonymous pages which have buffers arise when
truncate_complete_page()'s call to ->releasepage() failed.  Those pages
may still be mapped into process address spaces.

We should not remove them from the LRU, because that makes them
unswappable and they hang around until process exit.

This is the "minimal rmap" patch, writen by Rik, ported to 2.5 by Craig
Kulsea.

Basically,

before: When the page reclaim code decides that is has scanned too many
unreclaimable pages on the LRU it does a scan of process virtual
address spaces for pages to add to swapcache.  ptes pointing at the
page are unmapped as the scan proceeds.  When all ptes referring to a
page have been unmapped and it has been written to swap the page is
reclaimable.

after: When an anonymous page is encountered on the tail of the LRU we
use the rmap to see if it hasn't been referenced lately.  If so then
add it to swapcache.  When the page is again encountered on the LRU, if
it is still unreferenced then try to unmap all ptes which refer to it
in one hit, and if it is clean (ie: on swap) then free it.

The rest of the VM - list management, the classzone concept, etc
remains unchanged.

There are a number of things which the per-page pte chain could be
used for.  Bill Irwin has identified the following.


(1)  page replacement no longer goes around randomly unmapping things

(2)  referenced bits are more accurate because there aren't several ms
        or even seconds between find the multiple pte's mapping a page

(3)  reduces page replacement from O(total virtually mapped) to O(physical)

(4)  enables defragmentation of physical memory

(5)  enables cooperative offlining of memory for friendly guest instance
        behavior in UML and/or LPAR settings

(6)  demonstrable benefit in performance of swapping which is common in
        end-user interactive workstation workloads (I don't like the word
        "desktop"). c.f. Craig Kulesa's post wrt. swapping performance

(7)  evidence from 2.4-based rmap trees indicates approximate parity
        with mainline in kernel compiles with appropriate locking bits

(8)  partitioning of physical memory can reduce the complexity of page
        replacement searches by scanning only the "interesting" zones
        implemented and merged in 2.4-based rmap

(9)  partitioning of physical memory can increase the parallelism of page
        replacement searches by independently processing different zones
        implemented, but not merged in 2.4-based rmap

(10) the reverse mappings may be used for efficiently keeping pte cache
        attributes coherent

(11) they may be used for virtual cache invalidation (with changes)

(12) the reverse mappings enable proper RSS limit enforcement
        implemented and merged in 2.4-based rmap



The code adds a pointer to struct page, consumes additional storage for
the pte chains and adds computational expense to the page reclaim code
(I measured it at 3% additional load during streaming I/O).  The
benefits which we get back for all this are, I must say, theoretical
and unproven.  If it has real advantages (or, indeed, disadvantages)
then why has nobody demonstrated them?



There are a number of things remaining to be done:

1: Demonstrate the above advantages.

2: Make it work with pte-highmem  (Bill Irwin is signed up for this)

3: Don't add pte_chains to non-shared pages optimisation (Dave McCracken's
   patch does this)

4: Move the pte_chains into highmem too (Bill, I guess)

5: per-cpu pte_chain freelists (Rik?)

6: maybe GC the pte_chain backing pages. (Seems unavoidable.  Rik?)

7: multithread the page reclaim code.  (I have patches).

8: clustered add-to-swap.  Not sure if I buy this.  anon pages are
   often well-ordered-by-virtual-address on the LRU, so it "just
   works" for benchmarky loads.  But there may be some other loads...

9: Fix bad IO latency in page reclaim (I have lame patches)

10: Develop tuning tools, use them.

11: The nightly updatedb run is still evicting everything.

into home.transmeta.com:/home/torvalds/v2.5/linux

into home.transmeta.com:/home/torvalds/v2.5/linux

create_serial, get_free_serial and usb_serial_probe all do pretty much
the same thing. I'd like to reorg this into create_serial does all the
alloc and most of the setup, and get_free_serial just fills in the
MAGIC.

There's currently a memory leak: if create_serial is called at probe
time or calc_ports time, and then get_free_serial returns NULL because
the table has no entries left, that usb_serial struct is leaked.

get_free_serial doesn't check properly for free slots. The middle loop
doesn't terminate when the end of the table is reached, although the
assignment loop later does. The effect is that stuff past the end of
the table is allowed to decide if there's free space or not, and
occasionally it'll say "yes" and then the assignment loop will only
allocate slots up to the end of the table, preventing memory
scribbling.

I haven't fixed any of this just yet because I'm not sure what the
intended behaviour is. Should get_free_serial allocate as many slots
as possible, or just be all or nothing? Similarly, I don't see a
problem with calling create_serial early in usb_serial_probe, and
removing the alloc code from get_free_serial; this would fix the leak.

Ah heck, here's a patch. This is what I think things should look like.
get_free_serial is all or none, the leak is fixed and create_serial
does all the allocation.

Name: Designated initializers for drivers/usb
Author: Rusty Russell
Status: Trivial

D: The old form of designated initializers are obsolete: we need to
D: replace them with the ISO C forms before 2.6.  Gcc has always supported
D: both forms anyway.

  Trivia time:

  - C99 conforming initializations by Rusty.

  - ide__sti() -> local_irq_enable() and its friends.

Most noticable in the patch:

1. we handle IRQ sharing now better then ever

2. survives quite a lot of testing by few people. Forexample
cat /dev/hdb > /dev/null, where /dev/hdb contains a CD-ROM
with a big cratch on the surface making sure it's broken :-).
it's BTW. amanzing how wide the cratch had to be until errors
ocurred.

3. Doesn't play with rq_rdev and friends

Fri Jul 12 05:04:32 CEST 2002 ide-clean-99

- Push nIEN disabling down at the place where we are finished with a particular
   request.

- First round of command line parser cleanups by Gerald Champagne.

- Unfold the drive eviction functions in do_request(). This allowed us to
   realize that we don't have to re-get the major/minor numbers of the device we
   are action on from the raw device field of the currently running request. One
   significant place less in kernel where major/minor data gets manipulated.

- Move the big IDE_BUSY loop out of do_request to do_ide_request().  This makes
   us realize that we don't have to clear the IDE_BUSY bit just before
   reentering do_request to look for more requests still pending on the queue
   and set it immediately again.

   This is fixing a tinny race on the code path from IRQ or timer function,
   where we had a tinny window between the clearing of the IDE_BUSY bit and
   reentering the request queue for completely unrelated requests to come in to
   our way.

- Don't return any value in do_reset1(). It's always ATA_OP_CONTINUES. Split it
   up in to two functions one for disks (well in fact channels) and one for
   ATAPI devices. It turns out that they can be moved to the places where they
   are used to clarify the code flow. The only function remaining is
   do_reset_channel() now.

- Duplicate code from ide_do_drive_code explicitely in ide_raw_taskfile().
   Simplify ide_raw_taskfile() thereafter. Realize that ide_do_drive_cmd()
   is now only used by ATAPI devices. Move it therefore to atapi.c.

- Do busy polling for ATAPI reset operations. This is much safer then the
   previous timer games played there. It simply doesn't make sense to give the
   bus up during such a subtile operation. We don't have to disable IRQs here as
   well, since we are already under the protection of the do_request mechanisms.
   (Well hopefully...)

- Remove no longer used reset_poll() function. poll_timeout and friends are now
   used only in pdc4030 code. Those function where not called from IRQ context
   but they where set as handlers and not as expiry functions.

- Return ATA_OP_CONTINUES instead of ATA_OP_FINISHED in ata_error(), to signal
   that we are willing to retry the operation until the maximal number of retry
   attempts is exceeded. Returning ATA_OP_FINISHED without prior end_request()
   hangs the system.

- Apply trivia from DJ patch set.

- Apply small configuration fix to ide-pci.c from Muli Ben-Yehuda.

- Feed add_blkdev_randomness with information we already have in struct
   ata_channel *ch->major, instead of using the major(macro) on the request in
   question.

- Make ide_raw_taskfile use the same request submission mechanism as
   tcq_invalidate_queue(). Something similar would be ideal for ioctl() code as
   well.

- Implement actual device reset. Realize that the recalibration procedure is
   doomed by the standard. Don't try to recover by recalibrating devices
   therefore -just our retry mechanism should work in those cases. And suddenly
   the error handling code is IRQ safe.

- Reinvent the ATA reset operation, since it is apparently needed. We still
   have to do the whole transfer timing reconfiguration there.

- Move drive_is_ready(), which is in reality an attempt to check for IRQ
   requesters without clearing the IRQ line, over to the place where it belongs:
   device.c, which is the direct device access abstraction place.  Rename it to
   ata_status_irq() to prevent global name space pollution.

- Updates to the pdc202xxx host chip controller setup code by Bart³omiej
   ¯o³nierkiewicz:

   Forward port 2.4 patch by Hank Yang from Promise:

	- Add PDC20271 support
	- Disable LBA48 support on PDC20262
	- Fix ATAPI UDMA port value
	- Add new quirk drive
	- Adjust timings for all drives when using ATA133
	- Update pdc202xx_reset() waiting time

- Mark TCQ as dangerous and add some bits about it to the help.

- Add some missing exports.

- Some small ide-scsi.c host allocation fixes by sullivan.

Get rid of dev in rdev and use bdev exclusively.

There is an awkwardness here in that userspace sometimes
passed down a dev_t (e.g. hot_add_disk) and sometime
a major and a minor (e.g. add_new_disk).  Should we convert
both to kdev_t as the uniform standard....
That is what was being done but it seemed very clumsy and
things were gets converted back and forth a lot.

As bdget used a dev_t, I felt safe in staying with dev_t once I
had one rather than converting to kdev_t and back.

Change partition_name calls to bdev_partition_name were possible.

All part of decreasing reliance on device numbers... atleast in
appearance.

Remove the sb from the mddev

Now that al the important information is in mddev, we don't need
to have an sb off the mddev.  We only keep the per-device ones.

Previously we determined if "set_array_info" had been run byb checking
mddev->sb.  Now we check mddev->raid_disks on the assumption that
any valid array MUST have a non-zero number of devices.

Remove dependance on superblock

All the remaining field of interest in the superblock
get duplicated in the mddev struture and this is treated as
authoritative.  The superblock gets completely generated at
write time, and all useful information extracted at read time.

This means that we can slot in different superblock formats
without affecting the bulk of the code.

Move persistent from superblock to mddev

Tidyup calc_dev_sboffset and calc_dev_size on the way

Remove number and raid_disk from personality arrays

These are redundant.  number not needed any more
raid_disk never was as that is the index.

nr_disks is gone from multipath/raid1

Never used.

Remove old_dev field.

We used to monitor the pervious device number of a
component device for superblock maintenance.  This is
not needed any more.