switch do_fsync() to fget_light()

Signed-off-by: Al Viro <viro@zeniv.linux.org.uk>
fs/dyn_sync_cntrl: dynamic sync control

The dynamic sync control interface uses Android kernel's unique early
suspend / lat resume interface.

While screen is on, file sync is disabled
when screen is off, a file sync is called to flush all outstanding writes
and restore file sync operation as normal.

Signed-off-by: Paul Reioux <reioux@gmail.com>

Conflicts:
	fs/sync.c
fs/dyn_fsync: check dyn fsync control's active prior to performing fsync ops

Signed-off-by: Andrew Bartholomew <andrewb03@gmail.com>
dynamic filesync: add some cache optimizations

and clean up file format and typos

bump version to 1.1

Signed-off-by: Paul Reioux <reioux@gmail.com>
defconfig: Enable dynamic sync control
arm: Allow CPU-supported unaligned accesses

This change reconfigures the CPU to allow CPU-supported unaligned
accesses, which are generally faster than software-only fixups,
resulting in fewer alignment exceptions.

Signed-off-by: Brent DeGraaf <bdegraaf@codeaurora.org>
modified by faux123 for omap
defconfig: Enable ALLOW_CPU_ALIGNMENT
defconfig: Enable UACCESS_WITH_MEMCPY
lib/vsprintf: replace link to Draft by final RFC number

The draft has evolved to RFC 5952.

Signed-off-by: Jan Engelhardt <jengelh@medozas.de>
Signed-off-by: Jiri Kosina <jkosina@suse.cz>
lib: make _tolower() public

This function is required by *printf and kstrto* functions that are
located in the different modules.  This patch makes _tolower() public.
However, it's good idea to not use the helper outside of mentioned
functions.

[akpm@linux-foundation.org: coding-style fixes]
Signed-off-by: Andy Shevchenko <andriy.shevchenko@linux.intel.com>
Acked-by: Alexey Dobriyan <adobriyan@gmail.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
lib/kstrtox: common code between kstrto*() and simple_strto*() functions

Currently termination logic (\0 or \n\0) is hardcoded in _kstrtoull(),
avoid that for code reuse between kstrto*() and simple_strtoull().
Essentially, make them different only in termination logic.

simple_strtoull() (and scanf(), BTW) ignores integer overflow, that's a
bug we currently don't have guts to fix, making KSTRTOX_OVERFLOW hack
necessary.

Almost forgot: patch shrinks code size by about ~80 bytes on x86_64.

Signed-off-by: Alexey Dobriyan <adobriyan@gmail.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
vsprintf: make %pV handling compatible with kasprintf()

kasprintf() (and potentially other functions that I didn't run across so
far) want to evaluate argument lists twice.  Caring to do so for the
primary list is obviously their job, but they can't reasonably be
expected to check the format string for instances of %pV, which however
need special handling too: On architectures like x86-64 (as opposed to
e.g.  ix86), using the same argument list twice doesn't produce the
expected results, as an internally managed cursor gets updated during
the first run.

Fix the problem by always acting on a copy of the original list when
handling %pV.

Signed-off-by: Jan Beulich <jbeulich@suse.com>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
procfs: add num_to_str() to speed up /proc/stat

== stat_check.py
num = 0
with open("/proc/stat") as f:
        while num < 1000 :
                data = f.read()
                f.seek(0, 0)
                num = num + 1
==

perf shows

    20.39%  stat_check.py  [kernel.kallsyms]    [k] format_decode
    13.41%  stat_check.py  [kernel.kallsyms]    [k] number
    12.61%  stat_check.py  [kernel.kallsyms]    [k] vsnprintf
    10.85%  stat_check.py  [kernel.kallsyms]    [k] memcpy
     4.85%  stat_check.py  [kernel.kallsyms]    [k] radix_tree_lookup
     4.43%  stat_check.py  [kernel.kallsyms]    [k] seq_printf

This patch removes most of calls to vsnprintf() by adding num_to_str()
and seq_print_decimal_ull(), which prints decimal numbers without rich
functions provided by printf().

On my 8cpu box.
== Before patch ==
[root@bluextal test]# time ./stat_check.py

real    0m0.150s
user    0m0.026s
sys     0m0.121s

== After patch ==
[root@bluextal test]# time ./stat_check.py

real    0m0.055s
user    0m0.022s
sys     0m0.030s

[akpm@linux-foundation.org: remove incorrect comment, use less statck in num_to_str(), move comment from .h to .c, simplify seq_put_decimal_ull()]
[andrea@betterlinux.com: avoid breaking the ABI in /proc/stat]
Signed-off-by: KAMEZAWA Hiroyuki <kamezawa.hiroyu@jp.fujitsu.com>
Signed-off-by: Andrea Righi <andrea@betterlinux.com>
Cc: Eric Dumazet <eric.dumazet@gmail.com>
Cc: Glauber Costa <glommer@parallels.com>
Cc: Peter Zijlstra <a.p.zijlstra@chello.nl>
Cc: Ingo Molnar <mingo@elte.hu>
Cc: Paul Turner <pjt@google.com>
Cc: Russell King <rmk@arm.linux.org.uk>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
backported from Linux 3.4-rc4 to Linux 3.0.x by faux123
vsprintf: optimize decimal conversion (again)

    This patch is based upon an original from Michal Nazarewicz.

    Previous code was using optimizations which were developed
    to work well even on narrow-word CPUs (by today's standards).
    But Linux runs only on 32-bit and wider CPUs. We can use that.

    First: using 32x32->64 multiply and trivial 32-bit shift,
    we can correctly divide by 10 much larger numbers, and thus
    we can print groups of 9 digits instead of groups of 5 digits.

    Next: there are two algorithms to print larger numbers.
    One is generic: divide by 1000000000 and repeatedly print
    groups of (up to) 9 digits. It's conceptually simple,
    but requires an (unsigned long long) / 1000000000 division.
    Second algorithm splits 64-bit unsigned long long into 16-bit chunks,
    manipulates them cleverly and generates groups of 4 decimal digits.
    It so happens that it does NOT require long long division.

    If long is > 32 bits, division of 64-bit values is relatively easy,
    and we will use the first algorithm.
    If long long is > 64 bits (strange architecture with VERY large long long),
    second algorithm can't be used, and we again use the first one.
    Else (if long is 32 bits and long long is 64 bits) we use second one.

    And third: there is a simple optimization which takes fast path
    not only for zero as was done before, but for all one-digit numbers.

    In all tested cases new code is faster than old one, in many cases by 30%,
    in few cases by more than 50% (for example, on x86-32, conversion of 12345678).
    Code growth is ~0 in 32-bit case and ~130 bytes in 64-bit case.

    Signed-off-by: Michal Nazarewicz <mina86@mina86.com>
    Signed-off-by: Denys Vlasenko <vda.linux@googlemail.com>
    Cc: Douglas W Jones <jones@cs.uiowa.edu>a
    backported from Linux 3.4+ to Linux 3.0 by faux123
panic: Fix a possible deadlock in panic()

panic_lock is meant to ensure that panic processing takes
place only on one cpu; if any of the other cpus encounter
a panic, they will spin waiting to be shut down.

However, this causes a regression in this scenario:

1. Cpu 0 encounters a panic and acquires the panic_lock
   and proceeds with the panic processing.
2. There is an interrupt on cpu 0 that also encounters
   an error condition and invokes panic.
3. This second invocation fails to acquire the panic_lock
   and enters the infinite while loop in panic_smp_self_stop.

Thus all panic processing is stopped, and the cpu is stuck
for eternity in the while(1) inside panic_smp_self_stop.
To address this, disable local interrupts with
local_irq_disable before acquiring the panic_lock. This will
prevent interrupt handlers from executing during the panic
processing, thus avoiding this particular problem.

Signed-off-by: Vikram Mulukutla <markivx@codeaurora.org>
Reviewed-by: Stephen Boyd <sboyd@codeaurora.org>
panic: fix incomplete panic log in panic()

Panic log should be printed on the console, but if someone lock the
console when panic, console won't print out panic log.

The incomplete panic log issue will happen in below scenarios:
1. One task call console_lock(), then panic happend before it call
console_unlock(). No panic log can be printed.
2. Cpu 0 call panic()->Cpu 1 call console_lock()->Cpu 0 call
smp_send_stop()
Cpu 1 will be stopped and can't unlock console,only top part of panic log
will be printed.

So unlock console anyway in panic() to keep panic log printed.

Signed-off-by: Qing Zhu <qzhu@marvell.com>
hrtimers: teach usleep_range() to return how many usecs was slept

Teach usleep_range() to return how many usecs was actually spent in
sleep. The rationale beyond this is to convert jiffies-based time-bound
wait-for-hardware loops from using msleep() to usleep_range().

Signed-off-by: Dmitry Antipov <dmitry.antipov@linaro.org>
kernel/timer: Optimise apply_slack() for size and speed.

To apply proper slack, the original algorithm used to prepare a mask and
then apply the mask to obtain the appropriately rounded-off absolute
time the timer expires.

This patch modifies the masking logic to a bit-shift logic, therby
reducing the complexity and number of operations. Thus obtaining a minor
speed-up.

Signed-off-by: Chinmay V S <chinmay.v.s@pathpartnertech.com>
Linux 3.0.74
mutex: Make more scalable by doing less atomic operations

Date	Thu, 4 Apr 2013 10:54:16 -0400

In the __mutex_lock_common() function, an initial entry into
the lock slow path will cause two atomic_xchg instructions to be
issued. Together with the atomic decrement in the fast path, a total
of three atomic read-modify-write instructions will be issued in
rapid succession. This can cause a lot of cache bouncing when many
tasks are trying to acquire the mutex at the same time.

This patch will reduce the number of atomic_xchg instructions used by
checking the counter value first before issuing the instruction. The
atomic_read() function is just a simple memory read. The atomic_xchg()
function, on the other hand, can be up to 2 order of magnitude or even
more in cost when compared with atomic_read(). By using atomic_read()
to check the value first before calling atomic_xchg(), we can avoid a
lot of unnecessary cache coherency traffic. The only downside with this
change is that a task on the slow path will have a tiny bit
less chance of getting the mutex when competing with another task
in the fast path.

The same is true for the atomic_cmpxchg() function in the
mutex-spin-on-owner loop. So an atomic_read() is also performed before
calling atomic_cmpxchg().

The mutex locking and unlocking code for the x86 architecture can allow
any negative number to be used in the mutex count to indicate that some
tasks are waiting for the mutex. I am not so sure if that is the case
for the other architectures. So the default is to avoid atomic_xchg()
if the count has already been set to -1. For x86, the check is modified
to include all negative numbers to cover a larger case.

The following table shows the scalability data on an 8-node 80-core
Westmere box with a 3.7.10 kernel. The numactl command is used to
restrict the running of the high_systime workloads to 1/2/4/8 nodes
with hyperthreading on and off.

+-----------------+------------------+------------------+----------+
|  Configuration  | Mean Transaction | Mean Transaction | % Change |
|		  |  Rate w/o patch  | Rate with patch  |	   |
+-----------------+------------------------------------------------+
|		  |              User Range 1100 - 2000		   |
+-----------------+------------------------------------------------+
| 8 nodes, HT on  |      36980       |      148590      | +301.8%  |
| 8 nodes, HT off |      42799       |      145011      | +238.8%  |
| 4 nodes, HT on  |	 61318       |      118445      |  +51.1%  |
| 4 nodes, HT off |     158481       |      158592      |   +0.1%  |
| 2 nodes, HT on  |     180602       |      173967      |   -3.7%  |
| 2 nodes, HT off |     198409       |      198073      |   -0.2%  |
| 1 node , HT on  |     149042       |      147671      |   -0.9%  |
| 1 node , HT off |     126036       |      126533      |   +0.4%  |
+-----------------+------------------------------------------------+
|		  |              User Range 200 - 1000		   |
+-----------------+------------------------------------------------+
| 8 nodes, HT on  |      41525       |      122349      | +194.6%  |
| 8 nodes, HT off |      49866       |      124032      | +148.7%  |
| 4 nodes, HT on  |	 66409       |      106984      |  +61.1%  |
| 4 nodes, HT off |     119880       |      130508      |   +8.9%  |
| 2 nodes, HT on  |     138003       |      133948      |   -2.9%  |
| 2 nodes, HT off |     132792       |      131997      |   -0.6%  |
| 1 node , HT on  |     116593       |      115859      |   -0.6%  |
| 1 node , HT off |     104499       |      104597      |   +0.1%  |
+-----------------+------------------+------------------+----------+
AIM7 benchmark run has a pretty large run-to-run variance due to random
nature of the subtests executed. So a difference of less than +-5%
may not be really significant.

This patch improves high_systime workload performance at 4 nodes
and up by maintaining transaction rates without significant drop-off
at high node count.  The patch has practically no impact on 1 and 2
nodes system.

The table below shows the percentage time (as reported by perf
record -a -s -g) spent on the __mutex_lock_slowpath() function by
the high_systime workload at 1500 users for 2/4/8-node configurations
with hyperthreading off.

+---------------+-----------------+------------------+---------+
| Configuration | %Time w/o patch | %Time with patch | %Change |
+---------------+-----------------+------------------+---------+
|    8 nodes    |      65.34%     |      0.69%       |  -99%   |
|    4 nodes    |       8.70%	  |      1.02%	     |  -88%   |
|    2 nodes    |       0.41%     |      0.32%       |  -22%   |
+---------------+-----------------+------------------+---------+
It is obvious that the dramatic performance improvement at 8
nodes was due to the drastic cut in the time spent within the
__mutex_lock_slowpath() function.

The table below show the improvements in other AIM7 workloads (at 8
nodes, hyperthreading off).

+--------------+---------------+----------------+-----------------+
|   Workload   | mean % change | mean % change  | mean % change   |
|              | 10-100 users  | 200-1000 users | 1100-2000 users |
+--------------+---------------+----------------+-----------------+
| alltests     |     +0.6%     |   +104.2%      |   +185.9%       |
| five_sec     |     +1.9%     |     +0.9%      |     +0.9%       |
| fserver      |     +1.4%     |     -7.7%      |     +5.1%       |
| new_fserver  |     -0.5%     |     +3.2%      |     +3.1%       |
| shared       |    +13.1%     |   +146.1%      |   +181.5%       |
| short        |     +7.4%     |     +5.0%      |     +4.2%       |
+--------------+---------------+----------------+-----------------+
Signed-off-by: Waiman Long <Waiman.Long@hp.com>
Reviewed-by: Davidlohr Bueso <davidlohr.bueso@hp.com>