2005-04-16 15:20:36 -07:00
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2005-05-05 16:16:16 -07:00
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2005-04-16 15:20:36 -07:00
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2007-08-28 15:50:33 -07:00
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2005-04-16 15:20:36 -07:00
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2008-11-16 19:39:21 -08:00
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2005-04-16 15:20:36 -07:00
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2006-07-03 00:25:35 -07:00
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2005-04-16 15:20:36 -07:00
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2006-12-03 23:15:30 -05:00
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2005-04-16 15:20:36 -07:00
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include cleanup: Update gfp.h and slab.h includes to prepare for breaking implicit slab.h inclusion from percpu.h
percpu.h is included by sched.h and module.h and thus ends up being
included when building most .c files. percpu.h includes slab.h which
in turn includes gfp.h making everything defined by the two files
universally available and complicating inclusion dependencies.
percpu.h -> slab.h dependency is about to be removed. Prepare for
this change by updating users of gfp and slab facilities include those
headers directly instead of assuming availability. As this conversion
needs to touch large number of source files, the following script is
used as the basis of conversion.
http://userweb.kernel.org/~tj/misc/slabh-sweep.py
The script does the followings.
* Scan files for gfp and slab usages and update includes such that
only the necessary includes are there. ie. if only gfp is used,
gfp.h, if slab is used, slab.h.
* When the script inserts a new include, it looks at the include
blocks and try to put the new include such that its order conforms
to its surrounding. It's put in the include block which contains
core kernel includes, in the same order that the rest are ordered -
alphabetical, Christmas tree, rev-Xmas-tree or at the end if there
doesn't seem to be any matching order.
* If the script can't find a place to put a new include (mostly
because the file doesn't have fitting include block), it prints out
an error message indicating which .h file needs to be added to the
file.
The conversion was done in the following steps.
1. The initial automatic conversion of all .c files updated slightly
over 4000 files, deleting around 700 includes and adding ~480 gfp.h
and ~3000 slab.h inclusions. The script emitted errors for ~400
files.
2. Each error was manually checked. Some didn't need the inclusion,
some needed manual addition while adding it to implementation .h or
embedding .c file was more appropriate for others. This step added
inclusions to around 150 files.
3. The script was run again and the output was compared to the edits
from #2 to make sure no file was left behind.
4. Several build tests were done and a couple of problems were fixed.
e.g. lib/decompress_*.c used malloc/free() wrappers around slab
APIs requiring slab.h to be added manually.
5. The script was run on all .h files but without automatically
editing them as sprinkling gfp.h and slab.h inclusions around .h
files could easily lead to inclusion dependency hell. Most gfp.h
inclusion directives were ignored as stuff from gfp.h was usually
wildly available and often used in preprocessor macros. Each
slab.h inclusion directive was examined and added manually as
necessary.
6. percpu.h was updated not to include slab.h.
7. Build test were done on the following configurations and failures
were fixed. CONFIG_GCOV_KERNEL was turned off for all tests (as my
distributed build env didn't work with gcov compiles) and a few
more options had to be turned off depending on archs to make things
build (like ipr on powerpc/64 which failed due to missing writeq).
* x86 and x86_64 UP and SMP allmodconfig and a custom test config.
* powerpc and powerpc64 SMP allmodconfig
* sparc and sparc64 SMP allmodconfig
* ia64 SMP allmodconfig
* s390 SMP allmodconfig
* alpha SMP allmodconfig
* um on x86_64 SMP allmodconfig
8. percpu.h modifications were reverted so that it could be applied as
a separate patch and serve as bisection point.
Given the fact that I had only a couple of failures from tests on step
6, I'm fairly confident about the coverage of this conversion patch.
If there is a breakage, it's likely to be something in one of the arch
headers which should be easily discoverable easily on most builds of
the specific arch.
Signed-off-by: Tejun Heo <tj@kernel.org>
Guess-its-ok-by: Christoph Lameter <cl@linux-foundation.org>
Cc: Ingo Molnar <mingo@redhat.com>
Cc: Lee Schermerhorn <Lee.Schermerhorn@hp.com>
2010-03-24 17:04:11 +09:00
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2005-04-16 15:20:36 -07:00
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2008-11-16 19:39:21 -08:00
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2009-07-08 12:09:13 +00:00
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2005-04-16 15:20:36 -07:00
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2008-03-21 15:54:53 -07:00
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2010-05-02 13:42:39 -07:00
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2008-03-21 15:54:53 -07:00
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2005-04-16 15:20:36 -07:00
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2007-09-12 10:44:19 +02:00
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2005-04-16 15:20:36 -07:00
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2006-07-03 00:25:35 -07:00
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2005-04-16 15:20:36 -07:00
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2005-08-09 20:09:30 -07:00
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2007-12-04 01:15:45 -08:00
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2005-04-16 15:20:36 -07:00
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2005-05-01 08:59:25 -07:00
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2009-07-15 23:13:10 +00:00
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2009-11-08 10:17:58 +00:00
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2009-07-15 23:13:10 +00:00
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2009-10-19 23:46:20 +00:00
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2009-07-15 23:13:10 +00:00
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2009-11-08 10:17:30 +00:00
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2005-05-01 08:59:25 -07:00
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2009-11-08 10:17:58 +00:00
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2005-08-09 20:09:30 -07:00
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2007-09-12 11:58:02 +02:00
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2005-05-01 08:59:25 -07:00
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2005-08-09 20:09:30 -07:00
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2005-04-16 15:20:36 -07:00
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2009-07-15 23:13:10 +00:00
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2008-11-16 19:39:21 -08:00
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2005-04-16 15:20:36 -07:00
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2009-10-19 23:46:20 +00:00
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2009-07-15 23:13:10 +00:00
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2009-11-08 10:17:30 +00:00
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2009-07-15 23:13:10 +00:00
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2009-11-08 10:17:58 +00:00
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2005-08-09 20:09:30 -07:00
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2008-03-26 02:26:21 +09:00
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2007-09-12 11:58:02 +02:00
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2008-03-26 02:26:21 +09:00
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2005-04-16 15:20:36 -07:00
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2005-08-09 20:09:30 -07:00
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2005-05-01 08:59:25 -07:00
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2010-04-29 11:01:49 +00:00
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2005-05-01 08:59:25 -07:00
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2006-05-23 17:55:33 -07:00
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2005-05-01 08:59:25 -07:00
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2007-11-13 20:30:01 -08:00
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2009-02-12 05:03:38 +00:00
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2005-05-01 08:59:25 -07:00
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2010-05-16 00:36:33 -07:00
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2006-06-30 13:36:35 -07:00
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[NET]: Add per-connection option to set max TSO frame size
Update: My mailer ate one of Jarek's feedback mails... Fixed the
parameter in netif_set_gso_max_size() to be u32, not u16. Fixed the
whitespace issue due to a patch import botch. Changed the types from
u32 to unsigned int to be more consistent with other variables in the
area. Also brought the patch up to the latest net-2.6.26 tree.
Update: Made gso_max_size container 32 bits, not 16. Moved the
location of gso_max_size within netdev to be less hotpath. Made more
consistent names between the sock and netdev layers, and added a
define for the max GSO size.
Update: Respun for net-2.6.26 tree.
Update: changed max_gso_frame_size and sk_gso_max_size from signed to
unsigned - thanks Stephen!
This patch adds the ability for device drivers to control the size of
the TSO frames being sent to them, per TCP connection. By setting the
netdevice's gso_max_size value, the socket layer will set the GSO
frame size based on that value. This will propogate into the TCP
layer, and send TSO's of that size to the hardware.
This can be desirable to help tune the bursty nature of TSO on a
per-adapter basis, where one may have 1 GbE and 10 GbE devices
coexisting in a system, one running multiqueue and the other not, etc.
This can also be desirable for devices that cannot support full 64 KB
TSO's, but still want to benefit from some level of segmentation
offloading.
Signed-off-by: Peter P Waskiewicz Jr <peter.p.waskiewicz.jr@intel.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-03-21 03:43:19 -07:00
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2005-05-01 08:59:25 -07:00
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2007-11-13 20:30:01 -08:00
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2005-05-01 08:59:25 -07:00
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2007-11-13 20:30:01 -08:00
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2008-06-17 21:04:56 -07:00
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2005-05-01 08:59:25 -07:00
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2010-04-27 15:05:31 -07:00
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2005-05-01 08:59:25 -07:00
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2005-05-01 08:59:26 -07:00
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2008-02-18 20:52:13 -08:00
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2005-05-01 08:59:25 -07:00
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2005-04-16 15:20:36 -07:00
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2005-08-09 20:09:30 -07:00
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2005-04-16 15:20:36 -07:00
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2009-07-15 23:13:10 +00:00
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2009-10-19 23:46:20 +00:00
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2009-07-15 23:13:10 +00:00
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2005-04-16 15:20:36 -07:00
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2005-08-09 20:09:30 -07:00
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2007-09-12 11:58:02 +02:00
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2009-02-26 14:46:57 +01:00
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2009-10-08 22:50:25 +00:00
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2009-02-26 14:46:57 +01:00
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2005-04-16 15:20:36 -07:00
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2007-03-04 16:05:44 -08:00
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2010-03-04 18:01:40 +00:00
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2007-03-04 16:05:44 -08:00
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2010-04-29 11:01:49 +00:00
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2005-04-16 15:20:36 -07:00
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2008-10-28 13:24:06 -07:00
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2005-04-16 15:20:36 -07:00
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2008-10-28 13:24:06 -07:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2007-05-29 13:17:47 -07:00
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2005-04-16 15:20:36 -07:00
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2008-11-12 23:25:32 -08:00
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2006-05-23 17:55:33 -07:00
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2008-11-12 23:25:32 -08:00
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2005-04-16 15:20:36 -07:00
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2005-10-21 03:20:43 -04:00
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2005-04-16 15:20:36 -07:00
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2010-05-16 00:36:33 -07:00
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2006-06-30 13:36:35 -07:00
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|
[NET]: Add per-connection option to set max TSO frame size
Update: My mailer ate one of Jarek's feedback mails... Fixed the
parameter in netif_set_gso_max_size() to be u32, not u16. Fixed the
whitespace issue due to a patch import botch. Changed the types from
u32 to unsigned int to be more consistent with other variables in the
area. Also brought the patch up to the latest net-2.6.26 tree.
Update: Made gso_max_size container 32 bits, not 16. Moved the
location of gso_max_size within netdev to be less hotpath. Made more
consistent names between the sock and netdev layers, and added a
define for the max GSO size.
Update: Respun for net-2.6.26 tree.
Update: changed max_gso_frame_size and sk_gso_max_size from signed to
unsigned - thanks Stephen!
This patch adds the ability for device drivers to control the size of
the TSO frames being sent to them, per TCP connection. By setting the
netdevice's gso_max_size value, the socket layer will set the GSO
frame size based on that value. This will propogate into the TCP
layer, and send TSO's of that size to the hardware.
This can be desirable to help tune the bursty nature of TSO on a
per-adapter basis, where one may have 1 GbE and 10 GbE devices
coexisting in a system, one running multiqueue and the other not, etc.
This can also be desirable for devices that cannot support full 64 KB
TSO's, but still want to benefit from some level of segmentation
offloading.
Signed-off-by: Peter P Waskiewicz Jr <peter.p.waskiewicz.jr@intel.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-03-21 03:43:19 -07:00
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2006-03-24 15:12:37 -08:00
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2010-04-27 15:05:31 -07:00
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2005-04-16 15:20:36 -07:00
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2005-05-05 13:35:15 -07:00
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2005-04-16 15:20:36 -07:00
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2007-11-13 20:30:01 -08:00
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2005-04-16 15:20:36 -07:00
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2007-04-19 16:16:32 -07:00
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2005-04-16 15:20:36 -07:00
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2008-11-04 14:45:58 -08:00
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2005-04-16 15:20:36 -07:00
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2008-11-04 14:45:58 -08:00
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2008-01-30 19:08:16 -08:00
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cls_cgroup: Store classid in struct sock
Up until now cls_cgroup has relied on fetching the classid out of
the current executing thread. This runs into trouble when a packet
processing is delayed in which case it may execute out of another
thread's context.
Furthermore, even when a packet is not delayed we may fail to
classify it if soft IRQs have been disabled, because this scenario
is indistinguishable from one where a packet unrelated to the
current thread is processed by a real soft IRQ.
In fact, the current semantics is inherently broken, as a single
skb may be constructed out of the writes of two different tasks.
A different manifestation of this problem is when the TCP stack
transmits in response of an incoming ACK. This is currently
unclassified.
As we already have a concept of packet ownership for accounting
purposes in the skb->sk pointer, this is a natural place to store
the classid in a persistent manner.
This patch adds the cls_cgroup classid in struct sock, filling up
an existing hole on 64-bit :)
The value is set at socket creation time. So all sockets created
via socket(2) automatically gains the ID of the thread creating it.
Whenever another process touches the socket by either reading or
writing to it, we will change the socket classid to that of the
process if it has a valid (non-zero) classid.
For sockets created on inbound connections through accept(2), we
inherit the classid of the original listening socket through
sk_clone, possibly preceding the actual accept(2) call.
In order to minimise risks, I have not made this the authoritative
classid. For now it is only used as a backup when we execute
with soft IRQs disabled. Once we're completely happy with its
semantics we can use it as the sole classid.
Footnote: I have rearranged the error path on cls_group module
creation. If we didn't do this, then there is a window where
someone could create a tc rule using cls_group before the cgroup
subsystem has been registered.
Signed-off-by: Herbert Xu <herbert@gondor.apana.org.au>
Signed-off-by: David S. Miller <davem@davemloft.net>
2010-05-24 00:12:34 -07:00
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2005-04-16 15:20:36 -07:00
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2010-02-08 23:18:45 +00:00
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2005-08-09 20:09:46 -07:00
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2005-04-16 15:20:36 -07:00
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2005-08-09 20:09:46 -07:00
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2005-04-16 15:20:36 -07:00
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2008-11-16 19:39:21 -08:00
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2005-08-09 20:09:46 -07:00
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2005-04-16 15:20:36 -07:00
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2008-11-16 19:39:21 -08:00
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2005-08-09 20:09:46 -07:00
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2005-04-16 15:20:36 -07:00
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2005-08-09 20:09:46 -07:00
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2005-04-16 15:20:36 -07:00
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2006-04-28 15:21:23 -07:00
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2005-04-16 15:20:36 -07:00
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2008-11-16 19:39:21 -08:00
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2005-04-16 15:20:36 -07:00
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2010-02-22 07:57:18 +00:00
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2005-04-16 15:20:36 -07:00
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2010-02-22 07:57:18 +00:00
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2005-04-16 15:20:36 -07:00
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2008-11-16 19:39:21 -08:00
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udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
|
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2008-11-16 19:39:21 -08:00
|
|
|
|
udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
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2008-11-16 19:39:21 -08:00
|
|
|
|
udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
|
|
|
|
2008-11-16 19:39:21 -08:00
|
|
|
|
udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
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2005-04-16 15:20:36 -07:00
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2010-02-22 07:57:18 +00:00
|
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|
2008-11-16 19:39:21 -08:00
|
|
|
|
udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
|
|
|
|
2008-11-16 19:39:21 -08:00
|
|
|
|
udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
|
|
|
|
|
|
|
|
|
2008-11-16 19:39:21 -08:00
|
|
|
|
udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
|
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|
2008-11-16 19:39:21 -08:00
|
|
|
|
udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
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2005-04-16 15:20:36 -07:00
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2010-02-22 07:57:18 +00:00
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2008-11-16 19:39:21 -08:00
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2005-04-16 15:20:36 -07:00
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2008-11-16 19:39:21 -08:00
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2005-04-16 15:20:36 -07:00
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2007-03-25 22:14:49 -07:00
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2005-04-16 15:20:36 -07:00
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2009-02-12 05:03:38 +00:00
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net: speedup sk_wake_async()
An incoming datagram must bring into cpu cache *lot* of cache lines,
in particular : (other parts omitted (hash chains, ip route cache...))
On 32bit arches :
offsetof(struct sock, sk_rcvbuf) =0x30 (read)
offsetof(struct sock, sk_lock) =0x34 (rw)
offsetof(struct sock, sk_sleep) =0x50 (read)
offsetof(struct sock, sk_rmem_alloc) =0x64 (rw)
offsetof(struct sock, sk_receive_queue)=0x74 (rw)
offsetof(struct sock, sk_forward_alloc)=0x98 (rw)
offsetof(struct sock, sk_callback_lock)=0xcc (rw)
offsetof(struct sock, sk_drops) =0xd8 (read if we add dropcount support, rw if frame dropped)
offsetof(struct sock, sk_filter) =0xf8 (read)
offsetof(struct sock, sk_socket) =0x138 (read)
offsetof(struct sock, sk_data_ready) =0x15c (read)
We can avoid sk->sk_socket and socket->fasync_list referencing on sockets
with no fasync() structures. (socket->fasync_list ptr is probably already in cache
because it shares a cache line with socket->wait, ie location pointed by sk->sk_sleep)
This avoids one cache line load per incoming packet for common cases (no fasync())
We can leave (or even move in a future patch) sk->sk_socket in a cold location
Signed-off-by: Eric Dumazet <eric.dumazet@gmail.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2009-10-06 17:28:29 -07:00
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net: Generalize socket rx gap / receive queue overflow cmsg
Create a new socket level option to report number of queue overflows
Recently I augmented the AF_PACKET protocol to report the number of frames lost
on the socket receive queue between any two enqueued frames. This value was
exported via a SOL_PACKET level cmsg. AFter I completed that work it was
requested that this feature be generalized so that any datagram oriented socket
could make use of this option. As such I've created this patch, It creates a
new SOL_SOCKET level option called SO_RXQ_OVFL, which when enabled exports a
SOL_SOCKET level cmsg that reports the nubmer of times the sk_receive_queue
overflowed between any two given frames. It also augments the AF_PACKET
protocol to take advantage of this new feature (as it previously did not touch
sk->sk_drops, which this patch uses to record the overflow count). Tested
successfully by me.
Notes:
1) Unlike my previous patch, this patch simply records the sk_drops value, which
is not a number of drops between packets, but rather a total number of drops.
Deltas must be computed in user space.
2) While this patch currently works with datagram oriented protocols, it will
also be accepted by non-datagram oriented protocols. I'm not sure if thats
agreeable to everyone, but my argument in favor of doing so is that, for those
protocols which aren't applicable to this option, sk_drops will always be zero,
and reporting no drops on a receive queue that isn't used for those
non-participating protocols seems reasonable to me. This also saves us having
to code in a per-protocol opt in mechanism.
3) This applies cleanly to net-next assuming that commit
977750076d98c7ff6cbda51858bb5a5894a9d9ab (my af packet cmsg patch) is reverted
Signed-off-by: Neil Horman <nhorman@tuxdriver.com>
Signed-off-by: Eric Dumazet <eric.dumazet@gmail.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2009-10-12 13:26:31 -07:00
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2005-04-16 15:20:36 -07:00
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2005-08-23 10:11:30 -07:00
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2005-04-16 15:20:36 -07:00
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2007-03-06 11:21:05 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-21 03:07:41 -08:00
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2005-04-16 15:20:36 -07:00
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2010-03-04 18:01:40 +00:00
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2010-03-04 18:01:47 +00:00
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2005-11-08 09:39:42 -08:00
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2010-05-11 23:19:48 +00:00
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2005-11-08 09:39:42 -08:00
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2010-05-11 23:19:48 +00:00
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2005-11-08 09:39:42 -08:00
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2005-04-16 15:20:36 -07:00
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2010-04-27 15:13:20 -07:00
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2010-03-04 18:01:40 +00:00
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2010-03-07 16:21:39 +00:00
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2010-03-04 18:01:40 +00:00
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2010-04-27 15:13:20 -07:00
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2010-03-04 18:01:40 +00:00
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2010-03-04 18:01:47 +00:00
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2010-03-04 18:01:40 +00:00
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2008-10-07 14:18:42 -07:00
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2010-04-27 15:05:31 -07:00
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2007-10-09 01:59:42 -07:00
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2005-04-16 15:20:36 -07:00
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2005-06-18 22:47:21 -07:00
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2005-12-13 23:25:19 -08:00
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[SOCK] proto: Add hashinfo member to struct proto
This way we can remove TCP and DCCP specific versions of
sk->sk_prot->get_port: both v4 and v6 use inet_csk_get_port
sk->sk_prot->hash: inet_hash is directly used, only v6 need
a specific version to deal with mapped sockets
sk->sk_prot->unhash: both v4 and v6 use inet_hash directly
struct inet_connection_sock_af_ops also gets a new member, bind_conflict, so
that inet_csk_get_port can find the per family routine.
Now only the lookup routines receive as a parameter a struct inet_hashtable.
With this we further reuse code, reducing the difference among INET transport
protocols.
Eventually work has to be done on UDP and SCTP to make them share this
infrastructure and get as a bonus inet_diag interfaces so that iproute can be
used with these protocols.
net-2.6/net/ipv4/inet_hashtables.c:
struct proto | +8
struct inet_connection_sock_af_ops | +8
2 structs changed
__inet_hash_nolisten | +18
__inet_hash | -210
inet_put_port | +8
inet_bind_bucket_create | +1
__inet_hash_connect | -8
5 functions changed, 27 bytes added, 218 bytes removed, diff: -191
net-2.6/net/core/sock.c:
proto_seq_show | +3
1 function changed, 3 bytes added, diff: +3
net-2.6/net/ipv4/inet_connection_sock.c:
inet_csk_get_port | +15
1 function changed, 15 bytes added, diff: +15
net-2.6/net/ipv4/tcp.c:
tcp_set_state | -7
1 function changed, 7 bytes removed, diff: -7
net-2.6/net/ipv4/tcp_ipv4.c:
tcp_v4_get_port | -31
tcp_v4_hash | -48
tcp_v4_destroy_sock | -7
tcp_v4_syn_recv_sock | -2
tcp_unhash | -179
5 functions changed, 267 bytes removed, diff: -267
net-2.6/net/ipv6/inet6_hashtables.c:
__inet6_hash | +8
1 function changed, 8 bytes added, diff: +8
net-2.6/net/ipv4/inet_hashtables.c:
inet_unhash | +190
inet_hash | +242
2 functions changed, 432 bytes added, diff: +432
vmlinux:
16 functions changed, 485 bytes added, 492 bytes removed, diff: -7
/home/acme/git/net-2.6/net/ipv6/tcp_ipv6.c:
tcp_v6_get_port | -31
tcp_v6_hash | -7
tcp_v6_syn_recv_sock | -9
3 functions changed, 47 bytes removed, diff: -47
/home/acme/git/net-2.6/net/dccp/proto.c:
dccp_destroy_sock | -7
dccp_unhash | -179
dccp_hash | -49
dccp_set_state | -7
dccp_done | +1
5 functions changed, 1 bytes added, 242 bytes removed, diff: -241
/home/acme/git/net-2.6/net/dccp/ipv4.c:
dccp_v4_get_port | -31
dccp_v4_request_recv_sock | -2
2 functions changed, 33 bytes removed, diff: -33
/home/acme/git/net-2.6/net/dccp/ipv6.c:
dccp_v6_get_port | -31
dccp_v6_hash | -7
dccp_v6_request_recv_sock | +5
3 functions changed, 5 bytes added, 38 bytes removed, diff: -33
Signed-off-by: Arnaldo Carvalho de Melo <acme@redhat.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-02-03 04:06:04 -08:00
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2008-03-22 16:56:51 -07:00
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[NET] Generalise TCP's struct open_request minisock infrastructure
Kept this first changeset minimal, without changing existing names to
ease peer review.
Basicaly tcp_openreq_alloc now receives the or_calltable, that in turn
has two new members:
->slab, that replaces tcp_openreq_cachep
->obj_size, to inform the size of the openreq descendant for
a specific protocol
The protocol specific fields in struct open_request were moved to a
class hierarchy, with the things that are common to all connection
oriented PF_INET protocols in struct inet_request_sock, the TCP ones
in tcp_request_sock, that is an inet_request_sock, that is an
open_request.
I.e. this uses the same approach used for the struct sock class
hierarchy, with sk_prot indicating if the protocol wants to use the
open_request infrastructure by filling in sk_prot->rsk_prot with an
or_calltable.
Results? Performance is improved and TCP v4 now uses only 64 bytes per
open request minisock, down from 96 without this patch :-)
Next changeset will rename some of the structs, fields and functions
mentioned above, struct or_calltable is way unclear, better name it
struct request_sock_ops, s/struct open_request/struct request_sock/g,
etc.
Signed-off-by: Arnaldo Carvalho de Melo <acme@ghostprotocols.net>
Signed-off-by: David S. Miller <davem@davemloft.net>
2005-06-18 22:46:52 -07:00
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2005-04-16 15:20:36 -07:00
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2008-06-14 17:04:49 -07:00
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2005-04-16 15:20:36 -07:00
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2009-09-30 16:12:20 -07:00
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2005-04-16 15:20:36 -07:00
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2008-08-28 02:53:51 -07:00
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2006-03-20 22:45:21 -08:00
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2009-09-30 16:12:20 -07:00
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2006-03-20 22:45:21 -08:00
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2008-08-28 02:53:51 -07:00
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2005-04-16 15:20:36 -07:00
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[NET]: Define infrastructure to keep 'inuse' changes in an efficent SMP/NUMA way.
"struct proto" currently uses an array stats[NR_CPUS] to track change on
'inuse' sockets per protocol.
If NR_CPUS is big, this means we use a big memory area for this.
Moreover, all this memory area is located on a single node on NUMA
machines, increasing memory pressure on the boot node.
In this patch, I tried to :
- Keep a fast !CONFIG_SMP implementation
- Keep a fast CONFIG_SMP implementation for often used protocols
(tcp,udp,raw,...)
- Introduce a NUMA efficient implementation
Some helper macros are defined in include/net/sock.h
These macros take into account CONFIG_SMP
If a "struct proto" is declared without using DEFINE_PROTO_INUSE /
REF_PROTO_INUSE
macros, it will automatically use a default implementation, using a
dynamically allocated percpu zone.
This default implementation will be NUMA efficient, but might use 32/64
bytes per possible cpu
because of current alloc_percpu() implementation.
However it still should be better than previous implementation based on
stats[NR_CPUS] field.
When a "struct proto" is changed to use the new macros, we use a single
static "int" percpu variable,
lowering the memory and cpu costs, still preserving NUMA efficiency.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2007-11-05 23:38:39 -08:00
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2008-01-03 20:46:48 -08:00
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2008-03-28 16:38:17 -07:00
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2008-01-03 20:46:48 -08:00
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2007-11-21 22:08:50 +08:00
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2005-04-16 15:20:36 -07:00
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2008-07-16 20:28:10 -07:00
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2005-04-16 15:20:36 -07:00
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2008-11-25 21:16:35 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
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2005-04-16 15:20:36 -07:00
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|
udp: RCU handling for Unicast packets.
Goals are :
1) Optimizing handling of incoming Unicast UDP frames, so that no memory
writes should happen in the fast path.
Note: Multicasts and broadcasts still will need to take a lock,
because doing a full lockless lookup in this case is difficult.
2) No expensive operations in the socket bind/unhash phases :
- No expensive synchronize_rcu() calls.
- No added rcu_head in socket structure, increasing memory needs,
but more important, forcing us to use call_rcu() calls,
that have the bad property of making sockets structure cold.
(rcu grace period between socket freeing and its potential reuse
make this socket being cold in CPU cache).
David did a previous patch using call_rcu() and noticed a 20%
impact on TCP connection rates.
Quoting Cristopher Lameter :
"Right. That results in cacheline cooldown. You'd want to recycle
the object as they are cache hot on a per cpu basis. That is screwed
up by the delayed regular rcu processing. We have seen multiple
regressions due to cacheline cooldown.
The only choice in cacheline hot sensitive areas is to deal with the
complexity that comes with SLAB_DESTROY_BY_RCU or give up on RCU."
- Because udp sockets are allocated from dedicated kmem_cache,
use of SLAB_DESTROY_BY_RCU can help here.
Theory of operation :
---------------------
As the lookup is lockfree (using rcu_read_lock()/rcu_read_unlock()),
special attention must be taken by readers and writers.
Use of SLAB_DESTROY_BY_RCU is tricky too, because a socket can be freed,
reused, inserted in a different chain or in worst case in the same chain
while readers could do lookups in the same time.
In order to avoid loops, a reader must check each socket found in a chain
really belongs to the chain the reader was traversing. If it finds a
mismatch, lookup must start again at the begining. This *restart* loop
is the reason we had to use rdlock for the multicast case, because
we dont want to send same message several times to the same socket.
We use RCU only for fast path.
Thus, /proc/net/udp still takes spinlocks.
Signed-off-by: Eric Dumazet <dada1@cosmosbay.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-10-29 02:11:14 -07:00
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2005-04-16 15:20:36 -07:00
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2008-11-25 21:17:14 -08:00
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2005-08-09 20:09:30 -07:00
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2005-06-18 22:47:21 -07:00
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2005-12-13 23:25:19 -08:00
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[NET] Generalise TCP's struct open_request minisock infrastructure
Kept this first changeset minimal, without changing existing names to
ease peer review.
Basicaly tcp_openreq_alloc now receives the or_calltable, that in turn
has two new members:
->slab, that replaces tcp_openreq_cachep
->obj_size, to inform the size of the openreq descendant for
a specific protocol
The protocol specific fields in struct open_request were moved to a
class hierarchy, with the things that are common to all connection
oriented PF_INET protocols in struct inet_request_sock, the TCP ones
in tcp_request_sock, that is an inet_request_sock, that is an
open_request.
I.e. this uses the same approach used for the struct sock class
hierarchy, with sk_prot indicating if the protocol wants to use the
open_request infrastructure by filling in sk_prot->rsk_prot with an
or_calltable.
Results? Performance is improved and TCP v4 now uses only 64 bytes per
open request minisock, down from 96 without this patch :-)
Next changeset will rename some of the structs, fields and functions
mentioned above, struct or_calltable is way unclear, better name it
struct request_sock_ops, s/struct open_request/struct request_sock/g,
etc.
Signed-off-by: Arnaldo Carvalho de Melo <acme@ghostprotocols.net>
Signed-off-by: David S. Miller <davem@davemloft.net>
2005-06-18 22:46:52 -07:00
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2008-03-22 16:50:58 -07:00
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2008-10-29 01:41:45 -07:00
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2008-03-22 16:56:51 -07:00
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2008-03-22 16:50:58 -07:00
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[SOCK] proto: Add hashinfo member to struct proto
This way we can remove TCP and DCCP specific versions of
sk->sk_prot->get_port: both v4 and v6 use inet_csk_get_port
sk->sk_prot->hash: inet_hash is directly used, only v6 need
a specific version to deal with mapped sockets
sk->sk_prot->unhash: both v4 and v6 use inet_hash directly
struct inet_connection_sock_af_ops also gets a new member, bind_conflict, so
that inet_csk_get_port can find the per family routine.
Now only the lookup routines receive as a parameter a struct inet_hashtable.
With this we further reuse code, reducing the difference among INET transport
protocols.
Eventually work has to be done on UDP and SCTP to make them share this
infrastructure and get as a bonus inet_diag interfaces so that iproute can be
used with these protocols.
net-2.6/net/ipv4/inet_hashtables.c:
struct proto | +8
struct inet_connection_sock_af_ops | +8
2 structs changed
__inet_hash_nolisten | +18
__inet_hash | -210
inet_put_port | +8
inet_bind_bucket_create | +1
__inet_hash_connect | -8
5 functions changed, 27 bytes added, 218 bytes removed, diff: -191
net-2.6/net/core/sock.c:
proto_seq_show | +3
1 function changed, 3 bytes added, diff: +3
net-2.6/net/ipv4/inet_connection_sock.c:
inet_csk_get_port | +15
1 function changed, 15 bytes added, diff: +15
net-2.6/net/ipv4/tcp.c:
tcp_set_state | -7
1 function changed, 7 bytes removed, diff: -7
net-2.6/net/ipv4/tcp_ipv4.c:
tcp_v4_get_port | -31
tcp_v4_hash | -48
tcp_v4_destroy_sock | -7
tcp_v4_syn_recv_sock | -2
tcp_unhash | -179
5 functions changed, 267 bytes removed, diff: -267
net-2.6/net/ipv6/inet6_hashtables.c:
__inet6_hash | +8
1 function changed, 8 bytes added, diff: +8
net-2.6/net/ipv4/inet_hashtables.c:
inet_unhash | +190
inet_hash | +242
2 functions changed, 432 bytes added, diff: +432
vmlinux:
16 functions changed, 485 bytes added, 492 bytes removed, diff: -7
/home/acme/git/net-2.6/net/ipv6/tcp_ipv6.c:
tcp_v6_get_port | -31
tcp_v6_hash | -7
tcp_v6_syn_recv_sock | -9
3 functions changed, 47 bytes removed, diff: -47
/home/acme/git/net-2.6/net/dccp/proto.c:
dccp_destroy_sock | -7
dccp_unhash | -179
dccp_hash | -49
dccp_set_state | -7
dccp_done | +1
5 functions changed, 1 bytes added, 242 bytes removed, diff: -241
/home/acme/git/net-2.6/net/dccp/ipv4.c:
dccp_v4_get_port | -31
dccp_v4_request_recv_sock | -2
2 functions changed, 33 bytes removed, diff: -33
/home/acme/git/net-2.6/net/dccp/ipv6.c:
dccp_v6_get_port | -31
dccp_v6_hash | -7
dccp_v6_request_recv_sock | +5
3 functions changed, 5 bytes added, 38 bytes removed, diff: -33
Signed-off-by: Arnaldo Carvalho de Melo <acme@redhat.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2008-02-03 04:06:04 -08:00
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2005-04-16 15:20:36 -07:00
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2005-08-09 19:45:38 -07:00
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2005-04-16 15:20:36 -07:00
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2005-08-09 19:45:38 -07:00
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2008-01-03 20:46:48 -08:00
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2005-04-16 15:20:36 -07:00
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2008-03-31 19:41:46 -07:00
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2008-01-03 20:46:48 -08:00
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2008-03-31 19:41:46 -07:00
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2008-01-03 20:46:48 -08:00
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2005-04-16 15:20:36 -07:00
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2005-08-09 19:47:37 -07:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-09-01 17:48:23 -07:00
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2007-12-31 00:11:19 -08:00
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2005-09-01 17:48:23 -07:00
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2007-12-31 00:11:19 -08:00
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2008-01-10 21:56:38 -08:00
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2007-12-31 00:11:19 -08:00
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2005-09-01 17:48:23 -07:00
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2005-04-16 15:20:36 -07:00
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2007-09-12 10:44:19 +02:00
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2005-04-16 15:20:36 -07:00
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2006-12-06 20:35:24 -08:00
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2008-11-12 01:38:36 +00:00
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2006-12-06 20:35:24 -08:00
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2007-12-12 10:46:51 -08:00
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2006-11-08 22:44:35 -08:00
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2007-12-12 10:46:51 -08:00
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2005-04-16 15:20:36 -07:00
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2006-07-03 00:25:13 -07:00
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2005-04-16 15:20:36 -07:00
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2010-05-26 19:20:18 +00:00
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2010-04-28 14:35:48 -07:00
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2010-05-26 19:20:18 +00:00
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2010-04-28 14:35:48 -07:00
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2007-10-08 23:24:22 -07:00
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2005-10-07 07:46:04 +01:00
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2007-11-01 00:39:31 -07:00
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2005-04-16 15:20:36 -07:00
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2008-02-29 11:18:32 -08:00
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2005-08-09 20:10:12 -07:00
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2005-10-07 07:46:04 +01:00
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2005-04-16 15:20:36 -07:00
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2005-10-07 07:46:04 +01:00
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2005-04-16 15:20:36 -07:00
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2005-10-07 07:46:04 +01:00
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2005-04-16 15:20:36 -07:00
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2009-09-30 16:12:20 -07:00
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2005-04-16 15:20:36 -07:00
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2009-02-04 16:55:54 -08:00
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2005-07-08 14:57:47 -07:00
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2005-10-07 07:46:04 +01:00
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2005-04-16 15:20:36 -07:00
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cls_cgroup: Store classid in struct sock
Up until now cls_cgroup has relied on fetching the classid out of
the current executing thread. This runs into trouble when a packet
processing is delayed in which case it may execute out of another
thread's context.
Furthermore, even when a packet is not delayed we may fail to
classify it if soft IRQs have been disabled, because this scenario
is indistinguishable from one where a packet unrelated to the
current thread is processed by a real soft IRQ.
In fact, the current semantics is inherently broken, as a single
skb may be constructed out of the writes of two different tasks.
A different manifestation of this problem is when the TCP stack
transmits in response of an incoming ACK. This is currently
unclassified.
As we already have a concept of packet ownership for accounting
purposes in the skb->sk pointer, this is a natural place to store
the classid in a persistent manner.
This patch adds the cls_cgroup classid in struct sock, filling up
an existing hole on 64-bit :)
The value is set at socket creation time. So all sockets created
via socket(2) automatically gains the ID of the thread creating it.
Whenever another process touches the socket by either reading or
writing to it, we will change the socket classid to that of the
process if it has a valid (non-zero) classid.
For sockets created on inbound connections through accept(2), we
inherit the classid of the original listening socket through
sk_clone, possibly preceding the actual accept(2) call.
In order to minimise risks, I have not made this the authoritative
classid. For now it is only used as a backup when we execute
with soft IRQs disabled. Once we're completely happy with its
semantics we can use it as the sole classid.
Footnote: I have rearranged the error path on cls_group module
creation. If we didn't do this, then there is a window where
someone could create a tc rule using cls_group before the cgroup
subsystem has been registered.
Signed-off-by: Herbert Xu <herbert@gondor.apana.org.au>
Signed-off-by: David S. Miller <davem@davemloft.net>
2010-05-24 00:12:34 -07:00
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2005-04-16 15:20:36 -07:00
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2009-09-30 16:12:20 -07:00
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2005-04-16 15:20:36 -07:00
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2009-09-30 16:12:20 -07:00
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2006-03-20 22:45:21 -08:00
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2009-09-30 16:12:20 -07:00
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2005-04-16 15:20:36 -07:00
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2006-11-23 17:56:13 -08:00
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2010-02-14 22:35:47 -08:00
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2006-11-23 17:56:13 -08:00
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2007-10-17 21:21:51 -07:00
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2007-10-17 21:22:42 -07:00
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2007-10-17 21:21:51 -07:00
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2005-04-16 15:20:36 -07:00
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2007-10-17 21:21:51 -07:00
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2005-04-16 15:20:36 -07:00
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2006-11-16 14:06:06 -02:00
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2005-12-27 02:42:22 -02:00
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2009-10-19 23:46:20 +00:00
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2008-06-17 22:41:38 -07:00
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2009-10-19 23:46:20 +00:00
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2008-06-17 22:41:38 -07:00
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2010-04-20 13:03:51 +00:00
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2010-04-29 11:01:49 +00:00
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2010-04-20 13:03:51 +00:00
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2005-04-16 15:20:36 -07:00
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2008-06-17 22:41:38 -07:00
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2010-04-29 11:01:49 +00:00
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2005-04-16 15:20:36 -07:00
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2010-04-29 11:01:49 +00:00
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2005-04-16 15:20:36 -07:00
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2008-06-17 22:41:38 -07:00
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2006-07-24 23:32:50 -07:00
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2005-04-16 15:20:36 -07:00
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2010-04-08 23:03:29 +00:00
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2010-04-22 16:06:59 -07:00
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2005-04-16 15:20:36 -07:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2009-10-19 23:46:20 +00:00
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2010-04-26 20:40:43 +00:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2010-04-08 23:03:29 +00:00
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2005-04-16 15:20:36 -07:00
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2006-03-28 01:08:21 -08:00
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2005-04-16 15:20:36 -07:00
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2006-03-28 01:08:21 -08:00
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2005-04-16 15:20:36 -07:00
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2006-06-30 13:36:35 -07:00
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2007-04-20 17:12:43 -07:00
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2005-08-09 19:49:02 -07:00
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2010-05-16 00:36:33 -07:00
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2005-04-16 15:20:36 -07:00
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2006-11-14 21:36:34 -08:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2009-06-16 10:12:03 +00:00
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2009-07-08 12:09:13 +00:00
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2010-04-29 11:01:49 +00:00
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2010-05-24 23:54:18 -07:00
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2009-07-08 12:09:13 +00:00
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2010-04-29 11:01:49 +00:00
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2009-07-08 12:09:13 +00:00
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2010-04-29 11:01:49 +00:00
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2009-07-08 12:09:13 +00:00
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2010-04-29 11:01:49 +00:00
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2009-07-08 12:09:13 +00:00
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2009-07-08 12:10:31 +00:00
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2009-07-08 12:09:13 +00:00
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2010-04-29 11:01:49 +00:00
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2009-07-08 12:09:13 +00:00
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2010-04-29 11:01:49 +00:00
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2009-07-08 12:09:13 +00:00
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2010-04-29 11:01:49 +00:00
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2009-07-08 12:09:13 +00:00
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2010-04-29 11:01:49 +00:00
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2009-07-08 12:09:13 +00:00
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2010-04-29 11:01:49 +00:00
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2009-07-08 12:09:13 +00:00
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2005-04-16 15:20:36 -07:00
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2009-06-22 02:25:25 +00:00
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2005-04-16 15:20:36 -07:00
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net: No more expensive sock_hold()/sock_put() on each tx
One of the problem with sock memory accounting is it uses
a pair of sock_hold()/sock_put() for each transmitted packet.
This slows down bidirectional flows because the receive path
also needs to take a refcount on socket and might use a different
cpu than transmit path or transmit completion path. So these
two atomic operations also trigger cache line bounces.
We can see this in tx or tx/rx workloads (media gateways for example),
where sock_wfree() can be in top five functions in profiles.
We use this sock_hold()/sock_put() so that sock freeing
is delayed until all tx packets are completed.
As we also update sk_wmem_alloc, we could offset sk_wmem_alloc
by one unit at init time, until sk_free() is called.
Once sk_free() is called, we atomic_dec_and_test(sk_wmem_alloc)
to decrement initial offset and atomicaly check if any packets
are in flight.
skb_set_owner_w() doesnt call sock_hold() anymore
sock_wfree() doesnt call sock_put() anymore, but check if sk_wmem_alloc
reached 0 to perform the final freeing.
Drawback is that a skb->truesize error could lead to unfreeable sockets, or
even worse, prematurely calling __sk_free() on a live socket.
Nice speedups on SMP. tbench for example, going from 2691 MB/s to 2711 MB/s
on my 8 cpu dev machine, even if tbench was not really hitting sk_refcnt
contention point. 5 % speedup on a UDP transmit workload (depends
on number of flows), lowering TX completion cpu usage.
Signed-off-by: Eric Dumazet <eric.dumazet@gmail.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2009-06-11 02:55:43 -07:00
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2005-04-16 15:20:36 -07:00
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2009-06-22 02:25:25 +00:00
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2005-04-16 15:20:36 -07:00
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2007-12-31 00:11:19 -08:00
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2005-04-16 15:20:36 -07:00
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2006-03-28 01:08:21 -08:00
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2005-04-16 15:20:36 -07:00
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2010-05-31 23:44:05 -07:00
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2005-04-16 15:20:36 -07:00
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2005-12-13 23:22:19 -08:00
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2005-04-16 15:20:36 -07:00
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net: speedup sk_wake_async()
An incoming datagram must bring into cpu cache *lot* of cache lines,
in particular : (other parts omitted (hash chains, ip route cache...))
On 32bit arches :
offsetof(struct sock, sk_rcvbuf) =0x30 (read)
offsetof(struct sock, sk_lock) =0x34 (rw)
offsetof(struct sock, sk_sleep) =0x50 (read)
offsetof(struct sock, sk_rmem_alloc) =0x64 (rw)
offsetof(struct sock, sk_receive_queue)=0x74 (rw)
offsetof(struct sock, sk_forward_alloc)=0x98 (rw)
offsetof(struct sock, sk_callback_lock)=0xcc (rw)
offsetof(struct sock, sk_drops) =0xd8 (read if we add dropcount support, rw if frame dropped)
offsetof(struct sock, sk_filter) =0xf8 (read)
offsetof(struct sock, sk_socket) =0x138 (read)
offsetof(struct sock, sk_data_ready) =0x15c (read)
We can avoid sk->sk_socket and socket->fasync_list referencing on sockets
with no fasync() structures. (socket->fasync_list ptr is probably already in cache
because it shares a cache line with socket->wait, ie location pointed by sk->sk_sleep)
This avoids one cache line load per incoming packet for common cases (no fasync())
We can leave (or even move in a future patch) sk->sk_socket in a cold location
Signed-off-by: Eric Dumazet <eric.dumazet@gmail.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2009-10-06 17:28:29 -07:00
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2005-04-16 15:20:36 -07:00
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2007-12-21 03:07:41 -08:00
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2005-04-16 15:20:36 -07:00
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2007-11-29 21:22:33 +11:00
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2005-04-16 15:20:36 -07:00
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2005-09-01 17:48:59 -07:00
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2008-07-16 20:28:10 -07:00
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2005-04-16 15:20:36 -07:00
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2007-12-21 03:07:41 -08:00
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2005-04-16 15:20:36 -07:00
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2005-10-07 07:46:04 +01:00
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2005-04-16 15:20:36 -07:00
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2009-02-12 16:43:17 -08:00
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2005-04-16 15:20:36 -07:00
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2007-03-25 22:14:49 -07:00
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2005-04-16 15:20:36 -07:00
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2007-04-19 16:16:32 -07:00
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2009-02-12 05:03:38 +00:00
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2005-08-14 17:24:31 -07:00
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2009-02-12 05:03:38 +00:00
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2007-03-25 22:14:49 -07:00
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2007-04-19 16:16:32 -07:00
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2005-04-16 15:20:36 -07:00
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2010-04-28 19:14:43 +00:00
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net: Generalize socket rx gap / receive queue overflow cmsg
Create a new socket level option to report number of queue overflows
Recently I augmented the AF_PACKET protocol to report the number of frames lost
on the socket receive queue between any two enqueued frames. This value was
exported via a SOL_PACKET level cmsg. AFter I completed that work it was
requested that this feature be generalized so that any datagram oriented socket
could make use of this option. As such I've created this patch, It creates a
new SOL_SOCKET level option called SO_RXQ_OVFL, which when enabled exports a
SOL_SOCKET level cmsg that reports the nubmer of times the sk_receive_queue
overflowed between any two given frames. It also augments the AF_PACKET
protocol to take advantage of this new feature (as it previously did not touch
sk->sk_drops, which this patch uses to record the overflow count). Tested
successfully by me.
Notes:
1) Unlike my previous patch, this patch simply records the sk_drops value, which
is not a number of drops between packets, but rather a total number of drops.
Deltas must be computed in user space.
2) While this patch currently works with datagram oriented protocols, it will
also be accepted by non-datagram oriented protocols. I'm not sure if thats
agreeable to everyone, but my argument in favor of doing so is that, for those
protocols which aren't applicable to this option, sk_drops will always be zero,
and reporting no drops on a receive queue that isn't used for those
non-participating protocols seems reasonable to me. This also saves us having
to code in a per-protocol opt in mechanism.
3) This applies cleanly to net-next assuming that commit
977750076d98c7ff6cbda51858bb5a5894a9d9ab (my af packet cmsg patch) is reverted
Signed-off-by: Neil Horman <nhorman@tuxdriver.com>
Signed-off-by: Eric Dumazet <eric.dumazet@gmail.com>
Signed-off-by: David S. Miller <davem@davemloft.net>
2009-10-12 13:26:31 -07:00
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2009-02-12 05:03:38 +00:00
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2005-04-16 15:20:36 -07:00
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2005-05-01 08:59:25 -07:00
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2006-06-22 16:00:11 -07:00
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2005-04-16 15:20:36 -07:00
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2006-05-23 18:01:28 -07:00
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2005-04-16 15:20:36 -07:00
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2006-05-23 18:01:28 -07:00
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2005-04-16 15:20:36 -07:00
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2008-03-26 02:26:21 +09:00
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2008-03-26 00:48:17 -07:00
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2008-03-26 02:26:21 +09:00
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2008-02-29 11:18:32 -08:00
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2008-03-26 02:26:21 +09:00
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2008-04-16 01:59:46 -07:00
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2008-02-29 11:18:32 -08:00
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2008-10-07 12:41:01 -07:00
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2009-02-12 05:03:38 +00:00
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2005-04-16 15:20:36 -07:00
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2007-03-18 17:33:16 -07:00
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2005-04-16 15:20:36 -07:00
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2007-03-08 20:41:08 -08:00
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2005-04-16 15:20:36 -07:00
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2007-03-08 20:41:08 -08:00
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2005-04-16 15:20:36 -07:00
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2005-08-16 02:18:02 -03:00
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2005-09-05 18:14:11 -07:00
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2005-08-16 02:18:02 -03:00
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2005-04-16 15:20:36 -07:00
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