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Merge branch 'linus' into tracing/hw-breakpoints

Browse source 
Conflicts:
	arch/x86/kernel/process_64.c

Semantic conflict fixed in:
	arch/x86/kvm/x86.c

Signed-off-by: Ingo Molnar <mingo@elte.hu>
This commit is contained in:
Ingo Molnar 2009-09-15 12:18:15 +02:00
commit dca2d6ac09
3318 changed files with 280751 additions and 124060 deletions
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2
Documentation/00-INDEX
View file

@ -82,6 +82,8 @@ block/
- info on the Block I/O (BIO) layer.
blockdev/
- info on block devices & drivers
btmrvl.txt
- info on Marvell Bluetooth driver usage.
cachetlb.txt
- describes the cache/TLB flushing interfaces Linux uses.
cdrom/

77
Documentation/RCU/RTFP.txt
View file

@ -743,3 +743,80 @@ Revised:
RCU, realtime RCU, sleepable RCU, performance.
"
}
@article{PaulEMcKenney2008RCUOSR
,author="Paul E. McKenney and Jonathan Walpole"
,title="Introducing technology into the {Linux} kernel: a case study"
,Year="2008"
,journal="SIGOPS Oper. Syst. Rev."
,volume="42"
,number="5"
,pages="4--17"
,issn="0163-5980"
,doi={http://doi.acm.org/10.1145/1400097.1400099}
,publisher="ACM"
,address="New York, NY, USA"
,annotation={
Linux changed RCU to a far greater degree than RCU has changed Linux.
}
}
@unpublished{PaulEMcKenney2008HierarchicalRCU
,Author="Paul E. McKenney"
,Title="Hierarchical {RCU}"
,month="November"
,day="3"
,year="2008"
,note="Available:
\url{http://lwn.net/Articles/305782/}
[Viewed November 6, 2008]"
,annotation="
RCU with combining-tree-based grace-period detection,
permitting it to handle thousands of CPUs.
"
}
@conference{PaulEMcKenney2009MaliciousURCU
,Author="Paul E. McKenney"
,Title="Using a Malicious User-Level {RCU} to Torture {RCU}-Based Algorithms"
,Booktitle="linux.conf.au 2009"
,month="January"
,year="2009"
,address="Hobart, Australia"
,note="Available:
\url{http://www.rdrop.com/users/paulmck/RCU/urcutorture.2009.01.22a.pdf}
[Viewed February 2, 2009]"
,annotation="
Realtime RCU and torture-testing RCU uses.
"
}
@unpublished{MathieuDesnoyers2009URCU
,Author="Mathieu Desnoyers"
,Title="[{RFC} git tree] Userspace {RCU} (urcu) for {Linux}"
,month="February"
,day="5"
,year="2009"
,note="Available:
\url{http://lkml.org/lkml/2009/2/5/572}
\url{git://lttng.org/userspace-rcu.git}
[Viewed February 20, 2009]"
,annotation="
Mathieu Desnoyers's user-space RCU implementation.
git://lttng.org/userspace-rcu.git
"
}
@unpublished{PaulEMcKenney2009BloatWatchRCU
,Author="Paul E. McKenney"
,Title="{RCU}: The {Bloatwatch} Edition"
,month="March"
,day="17"
,year="2009"
,note="Available:
\url{http://lwn.net/Articles/323929/}
[Viewed March 20, 2009]"
,annotation="
Uniprocessor assumptions allow simplified RCU implementation.
"
}

34
Documentation/RCU/UP.txt
View file

@ -2,14 +2,13 @@ RCU on Uniprocessor Systems
A common misconception is that, on UP systems, the call_rcu() primitive
may immediately invoke its function, and that the synchronize_rcu()
primitive may return immediately. The basis of this misconception
may immediately invoke its function. The basis of this misconception
is that since there is only one CPU, it should not be necessary to
wait for anything else to get done, since there are no other CPUs for
anything else to be happening on. Although this approach will -sort- -of-
work a surprising amount of the time, it is a very bad idea in general.
This document presents three examples that demonstrate exactly how bad an
idea this is.
This document presents three examples that demonstrate exactly how bad
an idea this is.
Example 1: softirq Suicide
@ -82,11 +81,18 @@ Quick Quiz #2: What locking restriction must RCU callbacks respect?
Summary
Permitting call_rcu() to immediately invoke its arguments or permitting
synchronize_rcu() to immediately return breaks RCU, even on a UP system.
So do not do it! Even on a UP system, the RCU infrastructure -must-
respect grace periods, and -must- invoke callbacks from a known environment
in which no locks are held.
Permitting call_rcu() to immediately invoke its arguments breaks RCU,
even on a UP system. So do not do it! Even on a UP system, the RCU
infrastructure -must- respect grace periods, and -must- invoke callbacks
from a known environment in which no locks are held.
It -is- safe for synchronize_sched() and synchronize_rcu_bh() to return
immediately on an UP system. It is also safe for synchronize_rcu()
to return immediately on UP systems, except when running preemptable
RCU.
Quick Quiz #3: Why can't synchronize_rcu() return immediately on
UP systems running preemptable RCU?
Answer to Quick Quiz #1:
@ -117,3 +123,13 @@ Answer to Quick Quiz #2:
callbacks acquire locks directly. However, a great many RCU
callbacks do acquire locks -indirectly-, for example, via
the kfree() primitive.
Answer to Quick Quiz #3:
Why can't synchronize_rcu() return immediately on UP systems
running preemptable RCU?
Because some other task might have been preempted in the middle
of an RCU read-side critical section. If synchronize_rcu()
simply immediately returned, it would prematurely signal the
end of the grace period, which would come as a nasty shock to
that other thread when it started running again.

20
Documentation/RCU/checklist.txt
View file

@ -11,7 +11,10 @@ over a rather long period of time, but improvements are always welcome!
structure is updated more than about 10% of the time, then
you should strongly consider some other approach, unless
detailed performance measurements show that RCU is nonetheless
the right tool for the job.
the right tool for the job. Yes, you might think of RCU
as simply cutting overhead off of the readers and imposing it
on the writers. That is exactly why normal uses of RCU will
do much more reading than updating.
Another exception is where performance is not an issue, and RCU
provides a simpler implementation. An example of this situation
@ -240,10 +243,11 @@ over a rather long period of time, but improvements are always welcome!
instead need to use synchronize_irq() or synchronize_sched().
12. Any lock acquired by an RCU callback must be acquired elsewhere
with irq disabled, e.g., via spin_lock_irqsave(). Failing to
disable irq on a given acquisition of that lock will result in
deadlock as soon as the RCU callback happens to interrupt that
acquisition's critical section.
with softirq disabled, e.g., via spin_lock_irqsave(),
spin_lock_bh(), etc. Failing to disable irq on a given
acquisition of that lock will result in deadlock as soon as the
RCU callback happens to interrupt that acquisition's critical
section.
13. RCU callbacks can be and are executed in parallel. In many cases,
the callback code simply wrappers around kfree(), so that this
@ -310,3 +314,9 @@ over a rather long period of time, but improvements are always welcome!
Because these primitives only wait for pre-existing readers,
it is the caller's responsibility to guarantee safety to
any subsequent readers.
16. The various RCU read-side primitives do -not- contain memory
barriers. The CPU (and in some cases, the compiler) is free
to reorder code into and out of RCU read-side critical sections.
It is the responsibility of the RCU update-side primitives to
deal with this.

10
Documentation/RCU/rcu.txt
View file

@ -36,7 +36,7 @@ o How can the updater tell when a grace period has completed
executed in user mode, or executed in the idle loop, we can
safely free up that item.
Preemptible variants of RCU (CONFIG_PREEMPT_RCU) get the
Preemptible variants of RCU (CONFIG_TREE_PREEMPT_RCU) get the
same effect, but require that the readers manipulate CPU-local
counters. These counters allow limited types of blocking
within RCU read-side critical sections. SRCU also uses
@ -79,10 +79,10 @@ o I hear that RCU is patented? What is with that?
o I hear that RCU needs work in order to support realtime kernels?
This work is largely completed. Realtime-friendly RCU can be
enabled via the CONFIG_PREEMPT_RCU kernel configuration parameter.
However, work is in progress for enabling priority boosting of
preempted RCU read-side critical sections. This is needed if you
have CPU-bound realtime threads.
enabled via the CONFIG_TREE_PREEMPT_RCU kernel configuration
parameter. However, work is in progress for enabling priority
boosting of preempted RCU read-side critical sections. This is
needed if you have CPU-bound realtime threads.
o Where can I find more information on RCU?

7
Documentation/RCU/rcubarrier.txt
View file

@ -170,6 +170,13 @@ module invokes call_rcu() from timers, you will need to first cancel all
the timers, and only then invoke rcu_barrier() to wait for any remaining
RCU callbacks to complete.
Of course, if you module uses call_rcu_bh(), you will need to invoke
rcu_barrier_bh() before unloading. Similarly, if your module uses
call_rcu_sched(), you will need to invoke rcu_barrier_sched() before
unloading. If your module uses call_rcu(), call_rcu_bh(), -and-
call_rcu_sched(), then you will need to invoke each of rcu_barrier(),
rcu_barrier_bh(), and rcu_barrier_sched().
Implementing rcu_barrier()

23
Documentation/RCU/torture.txt
View file

@ -76,8 +76,10 @@ torture_type The type of RCU to test: "rcu" for the rcu_read_lock() API,
"rcu_sync" for rcu_read_lock() with synchronous reclamation,
"rcu_bh" for the rcu_read_lock_bh() API, "rcu_bh_sync" for
rcu_read_lock_bh() with synchronous reclamation, "srcu" for
the "srcu_read_lock()" API, and "sched" for the use of
preempt_disable() together with synchronize_sched().
the "srcu_read_lock()" API, "sched" for the use of
preempt_disable() together with synchronize_sched(),
and "sched_expedited" for the use of preempt_disable()
with synchronize_sched_expedited().
verbose Enable debug printk()s. Default is disabled.
@ -162,6 +164,23 @@ of the "old" and "current" counters for the corresponding CPU. The
"idx" value maps the "old" and "current" values to the underlying array,
and is useful for debugging.
Similarly, sched_expedited RCU provides the following:
sched_expedited-torture: rtc: d0000000016c1880 ver: 1090796 tfle: 0 rta: 1090796 rtaf: 0 rtf: 1090787 rtmbe: 0 nt: 27713319
sched_expedited-torture: Reader Pipe: 12660320201 95875 0 0 0 0 0 0 0 0 0
sched_expedited-torture: Reader Batch: 12660424885 0 0 0 0 0 0 0 0 0 0
sched_expedited-torture: Free-Block Circulation: 1090795 1090795 1090794 1090793 1090792 1090791 1090790 1090789 1090788 1090787 0
state: -1 / 0:0 3:0 4:0
As before, the first four lines are similar to those for RCU.
The last line shows the task-migration state. The first number is
-1 if synchronize_sched_expedited() is idle, -2 if in the process of
posting wakeups to the migration kthreads, and N when waiting on CPU N.
Each of the colon-separated fields following the "/" is a CPU:state pair.
Valid states are "0" for idle, "1" for waiting for quiescent state,
"2" for passed through quiescent state, and "3" when a race with a
CPU-hotplug event forces use of the synchronize_sched() primitive.
USAGE

7
Documentation/RCU/trace.txt
View file

@ -191,8 +191,7 @@ rcu/rcuhier (which displays the struct rcu_node hierarchy).
The output of "cat rcu/rcudata" looks as follows:
rcu:
rcu:
rcu_sched:
0 c=17829 g=17829 pq=1 pqc=17829 qp=0 dt=10951/1 dn=0 df=1101 of=0 ri=36 ql=0 b=10
1 c=17829 g=17829 pq=1 pqc=17829 qp=0 dt=16117/1 dn=0 df=1015 of=0 ri=0 ql=0 b=10
2 c=17829 g=17829 pq=1 pqc=17829 qp=0 dt=1445/1 dn=0 df=1839 of=0 ri=0 ql=0 b=10
@ -306,7 +305,7 @@ comma-separated-variable spreadsheet format.
The output of "cat rcu/rcugp" looks as follows:
rcu: completed=33062 gpnum=33063
rcu_sched: completed=33062 gpnum=33063
rcu_bh: completed=464 gpnum=464
Again, this output is for both "rcu" and "rcu_bh". The fields are
@ -413,7 +412,7 @@ o Each element of the form "1/1 0:127 ^0" represents one struct
The output of "cat rcu/rcu_pending" looks as follows:
rcu:
rcu_sched:
0 np=255892 qsp=53936 cbr=0 cng=14417 gpc=10033 gps=24320 nf=6445 nn=146741
1 np=261224 qsp=54638 cbr=0 cng=25723 gpc=16310 gps=2849 nf=5912 nn=155792
2 np=237496 qsp=49664 cbr=0 cng=2762 gpc=45478 gps=1762 nf=1201 nn=136629

22
Documentation/RCU/whatisRCU.txt
View file

@ -136,10 +136,10 @@ rcu_read_lock()
Used by a reader to inform the reclaimer that the reader is
entering an RCU read-side critical section. It is illegal
to block while in an RCU read-side critical section, though
kernels built with CONFIG_PREEMPT_RCU can preempt RCU read-side
critical sections. Any RCU-protected data structure accessed
during an RCU read-side critical section is guaranteed to remain
unreclaimed for the full duration of that critical section.
kernels built with CONFIG_TREE_PREEMPT_RCU can preempt RCU
read-side critical sections. Any RCU-protected data structure
accessed during an RCU read-side critical section is guaranteed to
remain unreclaimed for the full duration of that critical section.
Reference counts may be used in conjunction with RCU to maintain
longer-term references to data structures.
@ -785,6 +785,7 @@ RCU pointer/list traversal:
rcu_dereference
list_for_each_entry_rcu
hlist_for_each_entry_rcu
hlist_nulls_for_each_entry_rcu
list_for_each_continue_rcu (to be deprecated in favor of new
list_for_each_entry_continue_rcu)
@ -807,19 +808,23 @@ RCU: Critical sections Grace period Barrier
rcu_read_lock synchronize_net rcu_barrier
rcu_read_unlock synchronize_rcu
synchronize_rcu_expedited
call_rcu
bh: Critical sections Grace period Barrier
rcu_read_lock_bh call_rcu_bh rcu_barrier_bh
rcu_read_unlock_bh
rcu_read_unlock_bh synchronize_rcu_bh
synchronize_rcu_bh_expedited
sched: Critical sections Grace period Barrier
[preempt_disable] synchronize_sched rcu_barrier_sched
[and friends] call_rcu_sched
rcu_read_lock_sched synchronize_sched rcu_barrier_sched
rcu_read_unlock_sched call_rcu_sched
[preempt_disable] synchronize_sched_expedited
[and friends]
SRCU: Critical sections Grace period Barrier
@ -827,6 +832,9 @@ SRCU: Critical sections Grace period Barrier
srcu_read_lock synchronize_srcu N/A
srcu_read_unlock
SRCU: Initialization/cleanup
init_srcu_struct
cleanup_srcu_struct
See the comment headers in the source code (or the docbook generated
from them) for more information.

75
Documentation/arm/Samsung-S3C24XX/CPUfreq.txt Normal file
View file

@ -0,0 +1,75 @@
S3C24XX CPUfreq support
=======================
Introduction
------------
The S3C24XX series support a number of power saving systems, such as
the ability to change the core, memory and peripheral operating
frequencies. The core control is exported via the CPUFreq driver
which has a number of different manual or automatic controls over the
rate the core is running at.
There are two forms of the driver depending on the specific CPU and
how the clocks are arranged. The first implementation used as single
PLL to feed the ARM, memory and peripherals via a series of dividers
and muxes and this is the implementation that is documented here. A
newer version where there is a seperate PLL and clock divider for the
ARM core is available as a seperate driver.
Layout
------
The code core manages the CPU specific drivers, any data that they
need to register and the interface to the generic drivers/cpufreq
system. Each CPU registers a driver to control the PLL, clock dividers
and anything else associated with it. Any board that wants to use this
framework needs to supply at least basic details of what is required.
The core registers with drivers/cpufreq at init time if all the data
necessary has been supplied.
CPU support
-----------
The support for each CPU depends on the facilities provided by the
SoC and the driver as each device has different PLL and clock chains
associated with it.
Slow Mode
---------
The SLOW mode where the PLL is turned off altogether and the
system is fed by the external crystal input is currently not
supported.
sysfs
-----
The core code exports extra information via sysfs in the directory
devices/system/cpu/cpu0/arch-freq.
Board Support
-------------
Each board that wants to use the cpufreq code must register some basic
information with the core driver to provide information about what the
board requires and any restrictions being placed on it.
The board needs to supply information about whether it needs the IO bank
timings changing, any maximum frequency limits and information about the
SDRAM refresh rate.
Document Author
---------------
Ben Dooks, Copyright 2009 Simtec Electronics
Licensed under GPLv2

119
Documentation/btmrvl.txt Normal file
View file

@ -0,0 +1,119 @@
=======================================================================
README for btmrvl driver
=======================================================================
All commands are used via debugfs interface.
=====================
Set/get driver configurations:
Path: /debug/btmrvl/config/
gpiogap=[n]
hscfgcmd
These commands are used to configure the host sleep parameters.
bit 8:0 -- Gap
bit 16:8 -- GPIO
where GPIO is the pin number of GPIO used to wake up the host.
It could be any valid GPIO pin# (e.g. 0-7) or 0xff (SDIO interface
wakeup will be used instead).
where Gap is the gap in milli seconds between wakeup signal and
wakeup event, or 0xff for special host sleep setting.
Usage:
# Use SDIO interface to wake up the host and set GAP to 0x80:
echo 0xff80 > /debug/btmrvl/config/gpiogap
echo 1 > /debug/btmrvl/config/hscfgcmd
# Use GPIO pin #3 to wake up the host and set GAP to 0xff:
echo 0x03ff > /debug/btmrvl/config/gpiogap
echo 1 > /debug/btmrvl/config/hscfgcmd
psmode=[n]
pscmd
These commands are used to enable/disable auto sleep mode
where the option is:
1 -- Enable auto sleep mode
0 -- Disable auto sleep mode
Usage:
# Enable auto sleep mode
echo 1 > /debug/btmrvl/config/psmode
echo 1 > /debug/btmrvl/config/pscmd
# Disable auto sleep mode
echo 0 > /debug/btmrvl/config/psmode
echo 1 > /debug/btmrvl/config/pscmd
hsmode=[n]
hscmd
These commands are used to enable host sleep or wake up firmware
where the option is:
1 -- Enable host sleep
0 -- Wake up firmware
Usage:
# Enable host sleep
echo 1 > /debug/btmrvl/config/hsmode
echo 1 > /debug/btmrvl/config/hscmd
# Wake up firmware
echo 0 > /debug/btmrvl/config/hsmode
echo 1 > /debug/btmrvl/config/hscmd
======================
Get driver status:
Path: /debug/btmrvl/status/
Usage:
cat /debug/btmrvl/status/<args>
where the args are:
curpsmode
This command displays current auto sleep status.
psstate
This command display the power save state.
hsstate
This command display the host sleep state.
txdnldrdy
This command displays the value of Tx download ready flag.
=====================
Use hcitool to issue raw hci command, refer to hcitool manual
Usage: Hcitool cmd <ogf> <ocf> [Parameters]
Interface Control Command
hcitool cmd 0x3f 0x5b 0xf5 0x01 0x00 --Enable All interface
hcitool cmd 0x3f 0x5b 0xf5 0x01 0x01 --Enable Wlan interface
hcitool cmd 0x3f 0x5b 0xf5 0x01 0x02 --Enable BT interface
hcitool cmd 0x3f 0x5b 0xf5 0x00 0x00 --Disable All interface
hcitool cmd 0x3f 0x5b 0xf5 0x00 0x01 --Disable Wlan interface
hcitool cmd 0x3f 0x5b 0xf5 0x00 0x02 --Disable BT interface
=======================================================================
SD8688 firmware:
/lib/firmware/sd8688_helper.bin
/lib/firmware/sd8688.bin
The images can be downloaded from:
git.infradead.org/users/dwmw2/linux-firmware.git/libertas/

5
Documentation/connector/Makefile
View file

@ -9,3 +9,8 @@ hostprogs-y := ucon
always := $(hostprogs-y)
HOSTCFLAGS_ucon.o += -I$(objtree)/usr/include
all: modules
modules clean:
$(MAKE) -C ../.. SUBDIRS=$(PWD) $@

33
Documentation/connector/cn_test.c
View file

@ -19,6 +19,8 @@
* Foundation, Inc., 59 Temple Place, Suite 330, Boston, MA 02111-1307 USA
*/
#define pr_fmt(fmt) "cn_test: " fmt
#include <linux/kernel.h>
#include <linux/module.h>
#include <linux/moduleparam.h>
@ -27,18 +29,17 @@
#include <linux/connector.h>
static struct cb_id cn_test_id = { 0x123, 0x456 };
static struct cb_id cn_test_id = { CN_NETLINK_USERS + 3, 0x456 };
static char cn_test_name[] = "cn_test";
static struct sock *nls;
static struct timer_list cn_test_timer;
void cn_test_callback(void *data)
static void cn_test_callback(struct cn_msg *msg)
{
struct cn_msg *msg = (struct cn_msg *)data;
printk("%s: %lu: idx=%x, val=%x, seq=%u, ack=%u, len=%d: %s.\n",
__func__, jiffies, msg->id.idx, msg->id.val,
msg->seq, msg->ack, msg->len, (char *)msg->data);
pr_info("%s: %lu: idx=%x, val=%x, seq=%u, ack=%u, len=%d: %s.\n",
__func__, jiffies, msg->id.idx, msg->id.val,
msg->seq, msg->ack, msg->len,
msg->len ? (char *)msg->data : "");
}
/*
@ -63,9 +64,7 @@ static int cn_test_want_notify(void)
skb = alloc_skb(size, GFP_ATOMIC);
if (!skb) {
printk(KERN_ERR "Failed to allocate new skb with size=%u.\n",
size);
pr_err("failed to allocate new skb with size=%u\n", size);
return -ENOMEM;
}
@ -114,12 +113,12 @@ static int cn_test_want_notify(void)
//netlink_broadcast(nls, skb, 0, ctl->group, GFP_ATOMIC);
netlink_unicast(nls, skb, 0, 0);
printk(KERN_INFO "Request was sent. Group=0x%x.\n", ctl->group);
pr_info("request was sent: group=0x%x\n", ctl->group);
return 0;
nlmsg_failure:
printk(KERN_ERR "Failed to send %u.%u\n", msg->seq, msg->ack);
pr_err("failed to send %u.%u\n", msg->seq, msg->ack);
kfree_skb(skb);
return -EINVAL;
}
@ -131,6 +130,8 @@ static void cn_test_timer_func(unsigned long __data)
struct cn_msg *m;
char data[32];
pr_debug("%s: timer fired with data %lu\n", __func__, __data);
m = kzalloc(sizeof(*m) + sizeof(data), GFP_ATOMIC);
if (m) {
@ -150,7 +151,7 @@ static void cn_test_timer_func(unsigned long __data)
cn_test_timer_counter++;
mod_timer(&cn_test_timer, jiffies + HZ);
mod_timer(&cn_test_timer, jiffies + msecs_to_jiffies(1000));
}
static int cn_test_init(void)
@ -168,8 +169,10 @@ static int cn_test_init(void)
}
setup_timer(&cn_test_timer, cn_test_timer_func, 0);
cn_test_timer.expires = jiffies + HZ;
add_timer(&cn_test_timer);
mod_timer(&cn_test_timer, jiffies + msecs_to_jiffies(1000));
pr_info("initialized with id={%u.%u}\n",
cn_test_id.idx, cn_test_id.val);
return 0;

119
Documentation/connector/connector.txt
View file

@ -5,10 +5,10 @@ Kernel Connector.
Kernel connector - new netlink based userspace <-> kernel space easy
to use communication module.
Connector driver adds possibility to connect various agents using
netlink based network. One must register callback and
identifier. When driver receives special netlink message with
appropriate identifier, appropriate callback will be called.
The Connector driver makes it easy to connect various agents using a
netlink based network. One must register a callback and an identifier.
When the driver receives a special netlink message with the appropriate
identifier, the appropriate callback will be called.
From the userspace point of view it's quite straightforward:
@ -17,10 +17,10 @@ From the userspace point of view it's quite straightforward:
send();
recv();
But if kernelspace want to use full power of such connections, driver
writer must create special sockets, must know about struct sk_buff
handling... Connector allows any kernelspace agents to use netlink
based networking for inter-process communication in a significantly
But if kernelspace wants to use the full power of such connections, the
driver writer must create special sockets, must know about struct sk_buff
handling, etc... The Connector driver allows any kernelspace agents to use
netlink based networking for inter-process communication in a significantly
easier way:
int cn_add_callback(struct cb_id *id, char *name, void (*callback) (void *));
@ -32,15 +32,15 @@ struct cb_id
__u32 val;
};
idx and val are unique identifiers which must be registered in
connector.h for in-kernel usage. void (*callback) (void *) - is a
callback function which will be called when message with above idx.val
will be received by connector core. Argument for that function must
idx and val are unique identifiers which must be registered in the
connector.h header for in-kernel usage. void (*callback) (void *) is a
callback function which will be called when a message with above idx.val
is received by the connector core. The argument for that function must
be dereferenced to struct cn_msg *.
struct cn_msg
{
struct cb_id id;
struct cb_id id;
__u32 seq;
__u32 ack;
@ -55,92 +55,95 @@ Connector interfaces.
int cn_add_callback(struct cb_id *id, char *name, void (*callback) (void *));
Registers new callback with connector core.
Registers new callback with connector core.
struct cb_id *id - unique connector's user identifier.
It must be registered in connector.h for legal in-kernel users.
char *name - connector's callback symbolic name.
void (*callback) (void *) - connector's callback.
struct cb_id *id - unique connector's user identifier.
It must be registered in connector.h for legal in-kernel users.
char *name - connector's callback symbolic name.
void (*callback) (void *) - connector's callback.
Argument must be dereferenced to struct cn_msg *.
void cn_del_callback(struct cb_id *id);
Unregisters new callback with connector core.
Unregisters new callback with connector core.
struct cb_id *id - unique connector's user identifier.
struct cb_id *id - unique connector's user identifier.
int cn_netlink_send(struct cn_msg *msg, u32 __groups, int gfp_mask);
Sends message to the specified groups. It can be safely called from
softirq context, but may silently fail under strong memory pressure.
If there are no listeners for given group -ESRCH can be returned.
Sends message to the specified groups. It can be safely called from
softirq context, but may silently fail under strong memory pressure.
If there are no listeners for given group -ESRCH can be returned.
struct cn_msg * - message header(with attached data).
u32 __group - destination group.
struct cn_msg * - message header(with attached data).
u32 __group - destination group.
If __group is zero, then appropriate group will
be searched through all registered connector users,
and message will be delivered to the group which was
created for user with the same ID as in msg.
If __group is not zero, then message will be delivered
to the specified group.
int gfp_mask - GFP mask.
int gfp_mask - GFP mask.
Note: When registering new callback user, connector core assigns
netlink group to the user which is equal to it's id.idx.
Note: When registering new callback user, connector core assigns
netlink group to the user which is equal to it's id.idx.
/*****************************************/
Protocol description.
/*****************************************/
Current offers transport layer with fixed header. Recommended
protocol which uses such header is following:
The current framework offers a transport layer with fixed headers. The
recommended protocol which uses such a header is as following:
msg->seq and msg->ack are used to determine message genealogy. When
someone sends message it puts there locally unique sequence and random
acknowledge numbers. Sequence number may be copied into
someone sends a message, they use a locally unique sequence and random
acknowledge number. The sequence number may be copied into
nlmsghdr->nlmsg_seq too.
Sequence number is incremented with each message to be sent.
The sequence number is incremented with each message sent.
If we expect reply to our message, then sequence number in received
message MUST be the same as in original message, and acknowledge
number MUST be the same + 1.
If you expect a reply to the message, then the sequence number in the
received message MUST be the same as in the original message, and the
acknowledge number MUST be the same + 1.
If we receive message and it's sequence number is not equal to one we
are expecting, then it is new message. If we receive message and it's
sequence number is the same as one we are expecting, but it's
acknowledge is not equal acknowledge number in original message + 1,
then it is new message.
If we receive a message and its sequence number is not equal to one we
are expecting, then it is a new message. If we receive a message and
its sequence number is the same as one we are expecting, but its
acknowledge is not equal to the acknowledge number in the original
message + 1, then it is a new message.
Obviously, protocol header contains above id.
Obviously, the protocol header contains the above id.
connector allows event notification in the following form: kernel
The connector allows event notification in the following form: kernel
driver or userspace process can ask connector to notify it when
selected id's will be turned on or off(registered or unregistered it's
callback). It is done by sending special command to connector
driver(it also registers itself with id={-1, -1}).
selected ids will be turned on or off (registered or unregistered its
callback). It is done by sending a special command to the connector
driver (it also registers itself with id={-1, -1}).
As example of usage Documentation/connector now contains cn_test.c -
testing module which uses connector to request notification and to
send messages.
As example of this usage can be found in the cn_test.c module which
uses the connector to request notification and to send messages.
/*****************************************/
Reliability.
/*****************************************/
Netlink itself is not reliable protocol, that means that messages can
Netlink itself is not a reliable protocol. That means that messages can
be lost due to memory pressure or process' receiving queue overflowed,
so caller is warned must be prepared. That is why struct cn_msg [main
connector's message header] contains u32 seq and u32 ack fields.
so caller is warned that it must be prepared. That is why the struct
cn_msg [main connector's message header] contains u32 seq and u32 ack
fields.
/*****************************************/
Userspace usage.
/*****************************************/
2.6.14 has a new netlink socket implementation, which by default does not
allow to send data to netlink groups other than 1.
So, if to use netlink socket (for example using connector)
with different group number userspace application must subscribe to
that group. It can be achieved by following pseudocode:
allow people to send data to netlink groups other than 1.
So, if you wish to use a netlink socket (for example using connector)
with a different group number, the userspace application must subscribe to
that group first. It can be achieved by the following pseudocode:
s = socket(PF_NETLINK, SOCK_DGRAM, NETLINK_CONNECTOR);
@ -160,8 +163,8 @@ if (bind(s, (struct sockaddr *)&l_local, sizeof(struct sockaddr_nl)) == -1) {
}
Where 270 above is SOL_NETLINK, and 1 is a NETLINK_ADD_MEMBERSHIP socket
option. To drop multicast subscription one should call above socket option
with NETLINK_DROP_MEMBERSHIP parameter which is defined as 0.
option. To drop a multicast subscription, one should call the above socket
option with the NETLINK_DROP_MEMBERSHIP parameter which is defined as 0.
2.6.14 netlink code only allows to select a group which is less or equal to
the maximum group number, which is used at netlink_kernel_create() time.

62
Documentation/connector/ucon.c
View file

@ -30,18 +30,24 @@
#include <arpa/inet.h>
#include <stdbool.h>
#include <stdio.h>
#include <stdlib.h>
#include <unistd.h>
#include <string.h>
#include <errno.h>
#include <time.h>
#include <getopt.h>
#include <linux/connector.h>
#define DEBUG
#define NETLINK_CONNECTOR 11
/* Hopefully your userspace connector.h matches this kernel */
#define CN_TEST_IDX CN_NETLINK_USERS + 3
#define CN_TEST_VAL 0x456
#ifdef DEBUG
#define ulog(f, a...) fprintf(stdout, f, ##a)
#else
@ -83,6 +89,25 @@ static int netlink_send(int s, struct cn_msg *msg)
return err;
}
static void usage(void)
{
printf(
"Usage: ucon [options] [output file]\n"
"\n"
"\t-h\tthis help screen\n"
"\t-s\tsend buffers to the test module\n"
"\n"
"The default behavior of ucon is to subscribe to the test module\n"
"and wait for state messages. Any ones received are dumped to the\n"
"specified output file (or stdout). The test module is assumed to\n"
"have an id of {%u.%u}\n"
"\n"
"If you get no output, then verify the cn_test module id matches\n"
"the expected id above.\n"
, CN_TEST_IDX, CN_TEST_VAL
);
}
int main(int argc, char *argv[])
{
int s;
@ -94,17 +119,34 @@ int main(int argc, char *argv[])
FILE *out;
time_t tm;
struct pollfd pfd;
bool send_msgs = false;
if (argc < 2)
out = stdout;
else {
out = fopen(argv[1], "a+");
while ((s = getopt(argc, argv, "hs")) != -1) {
switch (s) {
case 's':
send_msgs = true;
break;
case 'h':
usage();
return 0;
default:
/* getopt() outputs an error for us */
usage();
return 1;
}
}
if (argc != optind) {
out = fopen(argv[optind], "a+");
if (!out) {
ulog("Unable to open %s for writing: %s\n",
argv[1], strerror(errno));
out = stdout;
}
}
} else
out = stdout;
memset(buf, 0, sizeof(buf));
@ -115,9 +157,11 @@ int main(int argc, char *argv[])
}
l_local.nl_family = AF_NETLINK;
l_local.nl_groups = 0x123; /* bitmask of requested groups */
l_local.nl_groups = -1; /* bitmask of requested groups */
l_local.nl_pid = 0;
ulog("subscribing to %u.%u\n", CN_TEST_IDX, CN_TEST_VAL);
if (bind(s, (struct sockaddr *)&l_local, sizeof(struct sockaddr_nl)) == -1) {
perror("bind");
close(s);
@ -130,15 +174,15 @@ int main(int argc, char *argv[])
setsockopt(s, SOL_NETLINK, NETLINK_ADD_MEMBERSHIP, &on, sizeof(on));
}
#endif
if (0) {
if (send_msgs) {
int i, j;
memset(buf, 0, sizeof(buf));
data = (struct cn_msg *)buf;
data->id.idx = 0x123;
data->id.val = 0x456;
data->id.idx = CN_TEST_IDX;
data->id.val = CN_TEST_VAL;
data->seq = seq++;
data->ack = 0;
data->len = 0;

105
Documentation/feature-removal-schedule.txt
View file

@ -6,6 +6,35 @@ be removed from this file.
---------------------------
What: PRISM54
When: 2.6.34
Why: prism54 FullMAC PCI / Cardbus devices used to be supported only by the
prism54 wireless driver. After Intersil stopped selling these
devices in preference for the newer more flexible SoftMAC devices
a SoftMAC device driver was required and prism54 did not support
them. The p54pci driver now exists and has been present in the kernel for
a while. This driver supports both SoftMAC devices and FullMAC devices.
The main difference between these devices was the amount of memory which
could be used for the firmware. The SoftMAC devices support a smaller
amount of memory. Because of this the SoftMAC firmware fits into FullMAC
devices's memory. p54pci supports not only PCI / Cardbus but also USB
and SPI. Since p54pci supports all devices prism54 supports
you will have a conflict. I'm not quite sure how distributions are
handling this conflict right now. prism54 was kept around due to
claims users may experience issues when using the SoftMAC driver.
Time has passed users have not reported issues. If you use prism54
and for whatever reason you cannot use p54pci please let us know!
E-mail us at: linux-wireless@vger.kernel.org
For more information see the p54 wiki page:
http://wireless.kernel.org/en/users/Drivers/p54
Who: Luis R. Rodriguez <lrodriguez@atheros.com>
---------------------------
What: IRQF_SAMPLE_RANDOM
Check: IRQF_SAMPLE_RANDOM
When: July 2009
@ -206,24 +235,6 @@ Who: Len Brown <len.brown@intel.com>
---------------------------
What: libata spindown skipping and warning
When: Dec 2008
Why: Some halt(8) implementations synchronize caches for and spin
down libata disks because libata didn't use to spin down disk on
system halt (only synchronized caches).
Spin down on system halt is now implemented. sysfs node
/sys/class/scsi_disk/h:c:i:l/manage_start_stop is present if
spin down support is available.
Because issuing spin down command to an already spun down disk
makes some disks spin up just to spin down again, libata tracks
device spindown status to skip the extra spindown command and
warn about it.
This is to give userspace tools the time to get updated and will
be removed after userspace is reasonably updated.
Who: Tejun Heo <htejun@gmail.com>
---------------------------
What: i386/x86_64 bzImage symlinks
When: April 2010
@ -235,31 +246,6 @@ Who: Thomas Gleixner <tglx@linutronix.de>
---------------------------
What (Why):
- include/linux/netfilter_ipv4/ipt_TOS.h ipt_tos.h header files
(superseded by xt_TOS/xt_tos target & match)
- "forwarding" header files like ipt_mac.h in
include/linux/netfilter_ipv4/ and include/linux/netfilter_ipv6/
- xt_CONNMARK match revision 0
(superseded by xt_CONNMARK match revision 1)
- xt_MARK target revisions 0 and 1
(superseded by xt_MARK match revision 2)
- xt_connmark match revision 0
(superseded by xt_connmark match revision 1)
- xt_conntrack match revision 0
(superseded by xt_conntrack match revision 1)
- xt_iprange match revision 0,
include/linux/netfilter_ipv4/ipt_iprange.h
(superseded by xt_iprange match revision 1)
- xt_mark match revision 0
(superseded by xt_mark match revision 1)
- xt_recent: the old ipt_recent proc dir
(superseded by /proc/net/xt_recent)
@ -394,15 +380,6 @@ Who: Thomas Gleixner <tglx@linutronix.de>
-----------------------------
What: obsolete generic irq defines and typedefs
When: 2.6.30
Why: The defines and typedefs (hw_interrupt_type, no_irq_type, irq_desc_t)
have been kept around for migration reasons. After more than two years
it's time to remove them finally
Who: Thomas Gleixner <tglx@linutronix.de>
---------------------------
What: fakephp and associated sysfs files in /sys/bus/pci/slots/
When: 2011
Why: In 2.6.27, the semantics of /sys/bus/pci/slots was redefined to
@ -468,3 +445,27 @@ Why: cpu_policy_rwsem has a new cleaner definition making it local to
cpufreq core and contained inside cpufreq.c. Other dependent
drivers should not use it in order to safely avoid lockdep issues.
Who: Venkatesh Pallipadi <venkatesh.pallipadi@intel.com>
----------------------------
What: sound-slot/service-* module aliases and related clutters in
sound/sound_core.c
When: August 2010
Why: OSS sound_core grabs all legacy minors (0-255) of SOUND_MAJOR
(14) and requests modules using custom sound-slot/service-*
module aliases. The only benefit of doing this is allowing
use of custom module aliases which might as well be considered
a bug at this point. This preemptive claiming prevents
alternative OSS implementations.
Till the feature is removed, the kernel will be requesting
both sound-slot/service-* and the standard char-major-* module
aliases and allow turning off the pre-claiming selectively via
CONFIG_SOUND_OSS_CORE_PRECLAIM and soundcore.preclaim_oss
kernel parameter.
After the transition phase is complete, both the custom module
aliases and switches to disable it will go away. This removal
will also allow making ALSA OSS emulation independent of
sound_core. The dependency will be broken then too.
Who: Tejun Heo <tj@kernel.org>

100
Documentation/filesystems/gfs2-uevents.txt Normal file
View file

@ -0,0 +1,100 @@
uevents and GFS2
==================
During the lifetime of a GFS2 mount, a number of uevents are generated.
This document explains what the events are and what they are used
for (by gfs_controld in gfs2-utils).
A list of GFS2 uevents
-----------------------
1. ADD
The ADD event occurs at mount time. It will always be the first
uevent generated by the newly created filesystem. If the mount
is successful, an ONLINE uevent will follow. If it is not successful
then a REMOVE uevent will follow.
The ADD uevent has two environment variables: SPECTATOR=[0|1]
and RDONLY=[0|1] that specify the spectator status (a read-only mount
with no journal assigned), and read-only (with journal assigned) status
of the filesystem respectively.
2. ONLINE
The ONLINE uevent is generated after a successful mount or remount. It
has the same environment variables as the ADD uevent. The ONLINE
uevent, along with the two environment variables for spectator and
RDONLY are a relatively recent addition (2.6.32-rc+) and will not
be generated by older kernels.
3. CHANGE
The CHANGE uevent is used in two places. One is when reporting the
successful mount of the filesystem by the first node (FIRSTMOUNT=Done).
This is used as a signal by gfs_controld that it is then ok for other
nodes in the cluster to mount the filesystem.
The other CHANGE uevent is used to inform of the completion
of journal recovery for one of the filesystems journals. It has
two environment variables, JID= which specifies the journal id which
has just been recovered, and RECOVERY=[Done|Failed] to indicate the
success (or otherwise) of the operation. These uevents are generated
for every journal recovered, whether it is during the initial mount
process or as the result of gfs_controld requesting a specific journal
recovery via the /sys/fs/gfs2/<fsname>/lock_module/recovery file.
Because the CHANGE uevent was used (in early versions of gfs_controld)
without checking the environment variables to discover the state, we
cannot add any more functions to it without running the risk of
someone using an older version of the user tools and breaking their
cluster. For this reason the ONLINE uevent was used when adding a new
uevent for a successful mount or remount.
4. OFFLINE
The OFFLINE uevent is only generated due to filesystem errors and is used
as part of the "withdraw" mechanism. Currently this doesn't give any
information about what the error is, which is something that needs to
be fixed.
5. REMOVE
The REMOVE uevent is generated at the end of an unsuccessful mount
or at the end of a umount of the filesystem. All REMOVE uevents will
have been preceeded by at least an ADD uevent for the same fileystem,
and unlike the other uevents is generated automatically by the kernel's
kobject subsystem.
Information common to all GFS2 uevents (uevent environment variables)
----------------------------------------------------------------------
1. LOCKTABLE=
The LOCKTABLE is a string, as supplied on the mount command
line (locktable=) or via fstab. It is used as a filesystem label
as well as providing the information for a lock_dlm mount to be
able to join the cluster.
2. LOCKPROTO=
The LOCKPROTO is a string, and its value depends on what is set
on the mount command line, or via fstab. It will be either
lock_nolock or lock_dlm. In the future other lock managers
may be supported.
3. JOURNALID=
If a journal is in use by the filesystem (journals are not
assigned for spectator mounts) then this will give the
numeric journal id in all GFS2 uevents.
4. UUID=
With recent versions of gfs2-utils, mkfs.gfs2 writes a UUID
into the filesystem superblock. If it exists, this will
be included in every uevent relating to the filesystem.

98
Documentation/filesystems/nfs.txt Normal file
View file

@ -0,0 +1,98 @@
The NFS client
==============
The NFS version 2 protocol was first documented in RFC1094 (March 1989).
Since then two more major releases of NFS have been published, with NFSv3
being documented in RFC1813 (June 1995), and NFSv4 in RFC3530 (April
2003).
The Linux NFS client currently supports all the above published versions,
and work is in progress on adding support for minor version 1 of the NFSv4
protocol.
The purpose of this document is to provide information on some of the
upcall interfaces that are used in order to provide the NFS client with
some of the information that it requires in order to fully comply with
the NFS spec.
The DNS resolver
================
NFSv4 allows for one server to refer the NFS client to data that has been
migrated onto another server by means of the special "fs_locations"
attribute. See
http://tools.ietf.org/html/rfc3530#section-6
and
http://tools.ietf.org/html/draft-ietf-nfsv4-referrals-00
The fs_locations information can take the form of either an ip address and
a path, or a DNS hostname and a path. The latter requires the NFS client to
do a DNS lookup in order to mount the new volume, and hence the need for an
upcall to allow userland to provide this service.
Assuming that the user has the 'rpc_pipefs' filesystem mounted in the usual
/var/lib/nfs/rpc_pipefs, the upcall consists of the following steps:
(1) The process checks the dns_resolve cache to see if it contains a
valid entry. If so, it returns that entry and exits.
(2) If no valid entry exists, the helper script '/sbin/nfs_cache_getent'
(may be changed using the 'nfs.cache_getent' kernel boot parameter)
is run, with two arguments:
- the cache name, "dns_resolve"
- the hostname to resolve
(3) After looking up the corresponding ip address, the helper script
writes the result into the rpc_pipefs pseudo-file
'/var/lib/nfs/rpc_pipefs/cache/dns_resolve/channel'
in the following (text) format:
"<ip address> <hostname> <ttl>\n"
Where <ip address> is in the usual IPv4 (123.456.78.90) or IPv6
(ffee:ddcc:bbaa:9988:7766:5544:3322:1100, ffee::1100, ...) format.
<hostname> is identical to the second argument of the helper
script, and <ttl> is the 'time to live' of this cache entry (in
units of seconds).
Note: If <ip address> is invalid, say the string "0", then a negative
entry is created, which will cause the kernel to treat the hostname
as having no valid DNS translation.
A basic sample /sbin/nfs_cache_getent
=====================================
#!/bin/bash
#
ttl=600
#
cut=/usr/bin/cut
getent=/usr/bin/getent
rpc_pipefs=/var/lib/nfs/rpc_pipefs
#
die()
{
echo "Usage: $0 cache_name entry_name"
exit 1
}
[ $# -lt 2 ] && die
cachename="$1"
cache_path=${rpc_pipefs}/cache/${cachename}/channel
case "${cachename}" in
dns_resolve)
name="$2"
result="$(${getent} hosts ${name} | ${cut} -f1 -d\ )"
[ -z "${result}" ] && result="0"
;;
*)
die
;;
esac
echo "${result} ${name} ${ttl}" >${cache_path}

2
Documentation/filesystems/seq_file.txt
View file

@ -46,7 +46,7 @@ better to do. The file is seekable, in that one can do something like the
following:
dd if=/proc/sequence of=out1 count=1
dd if=/proc/sequence skip=1 out=out2 count=1
dd if=/proc/sequence skip=1 of=out2 count=1
Then concatenate the output files out1 and out2 and get the right
result. Yes, it is a thoroughly useless module, but the point is to show

99
Documentation/flexible-arrays.txt Normal file
View file

@ -0,0 +1,99 @@
Using flexible arrays in the kernel
Last updated for 2.6.31
Jonathan Corbet <corbet@lwn.net>
Large contiguous memory allocations can be unreliable in the Linux kernel.
Kernel programmers will sometimes respond to this problem by allocating
pages with vmalloc(). This solution not ideal, though. On 32-bit systems,
memory from vmalloc() must be mapped into a relatively small address space;
it's easy to run out. On SMP systems, the page table changes required by
vmalloc() allocations can require expensive cross-processor interrupts on
all CPUs. And, on all systems, use of space in the vmalloc() range
increases pressure on the translation lookaside buffer (TLB), reducing the
performance of the system.
In many cases, the need for memory from vmalloc() can be eliminated by
piecing together an array from smaller parts; the flexible array library
exists to make this task easier.
A flexible array holds an arbitrary (within limits) number of fixed-sized
objects, accessed via an integer index. Sparse arrays are handled
reasonably well. Only single-page allocations are made, so memory
allocation failures should be relatively rare. The down sides are that the
arrays cannot be indexed directly, individual object size cannot exceed the
system page size, and putting data into a flexible array requires a copy
operation. It's also worth noting that flexible arrays do no internal
locking at all; if concurrent access to an array is possible, then the
caller must arrange for appropriate mutual exclusion.
The creation of a flexible array is done with:
#include <linux/flex_array.h>
struct flex_array *flex_array_alloc(int element_size,
unsigned int total,
gfp_t flags);
The individual object size is provided by element_size, while total is the
maximum number of objects which can be stored in the array. The flags
argument is passed directly to the internal memory allocation calls. With
the current code, using flags to ask for high memory is likely to lead to
notably unpleasant side effects.
Storing data into a flexible array is accomplished with a call to:
int flex_array_put(struct flex_array *array, unsigned int element_nr,
void *src, gfp_t flags);
This call will copy the data from src into the array, in the position
indicated by element_nr (which must be less than the maximum specified when
the array was created). If any memory allocations must be performed, flags
will be used. The return value is zero on success, a negative error code
otherwise.
There might possibly be a need to store data into a flexible array while
running in some sort of atomic context; in this situation, sleeping in the
memory allocator would be a bad thing. That can be avoided by using
GFP_ATOMIC for the flags value, but, often, there is a better way. The
trick is to ensure that any needed memory allocations are done before
entering atomic context, using:
int flex_array_prealloc(struct flex_array *array, unsigned int start,
unsigned int end, gfp_t flags);
This function will ensure that memory for the elements indexed in the range
defined by start and end has been allocated. Thereafter, a
flex_array_put() call on an element in that range is guaranteed not to
block.
Getting data back out of the array is done with:
void *flex_array_get(struct flex_array *fa, unsigned int element_nr);
The return value is a pointer to the data element, or NULL if that
particular element has never been allocated.
Note that it is possible to get back a valid pointer for an element which
has never been stored in the array. Memory for array elements is allocated
one page at a time; a single allocation could provide memory for several
adjacent elements. The flexible array code does not know if a specific
element has been written; it only knows if the associated memory is
present. So a flex_array_get() call on an element which was never stored
in the array has the potential to return a pointer to random data. If the
caller does not have a separate way to know which elements were actually
stored, it might be wise, at least, to add GFP_ZERO to the flags argument
to ensure that all elements are zeroed.
There is no way to remove a single element from the array. It is possible,
though, to remove all elements with a call to:
void flex_array_free_parts(struct flex_array *array);
This call frees all elements, but leaves the array itself in place.
Freeing the entire array is done with:
void flex_array_free(struct flex_array *array);
As of this writing, there are no users of flexible arrays in the mainline
kernel. The functions described here are also not exported to modules;
that will probably be fixed when somebody comes up with a need for it.

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