2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:00 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2006-06-26 00:27:19 -07:00
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2005-04-16 15:20:36 -07:00
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2011-08-03 16:21:06 -07:00
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2005-04-16 15:20:36 -07:00
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2006-12-06 20:33:20 -08:00
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2011-08-03 16:21:06 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:58 -07:00
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2005-04-16 15:20:36 -07:00
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2006-07-14 00:24:23 -07:00
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2005-04-16 15:20:36 -07:00
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2006-07-14 00:24:23 -07:00
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2005-04-16 15:20:36 -07:00
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2006-07-14 00:24:23 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:02 -07:00
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2006-06-25 05:49:34 -07:00
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2008-07-25 01:47:58 -07:00
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2006-06-25 05:49:34 -07:00
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2008-07-25 01:47:58 -07:00
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2005-04-16 15:20:36 -07:00
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2006-07-14 00:24:23 -07:00
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2005-04-16 15:20:36 -07:00
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2006-07-14 00:24:23 -07:00
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2008-07-25 01:47:58 -07:00
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2006-07-14 00:24:23 -07:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:12 +09:00
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2005-04-16 15:20:36 -07:00
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2010-10-26 14:19:08 -07:00
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2005-04-16 15:20:36 -07:00
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2010-10-26 14:23:03 -07:00
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2005-04-16 15:20:36 -07:00
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2010-10-26 14:19:08 -07:00
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2005-04-16 15:20:36 -07:00
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2005-10-21 03:18:50 -04:00
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2005-04-16 15:20:36 -07:00
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2009-01-15 13:51:21 -08:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:58 -07:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:12 +09:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:12 +09:00
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2007-10-14 19:35:50 +01:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:12 +09:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:12 +09:00
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2005-10-30 15:02:14 -08:00
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2007-06-14 03:45:12 +09:00
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2010-02-22 12:44:19 -08:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:59 -07:00
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2005-04-16 15:20:36 -07:00
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2010-02-22 12:44:19 -08:00
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2007-06-14 03:45:12 +09:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:59 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:58 -07:00
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2005-04-16 15:20:36 -07:00
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2008-12-01 13:14:02 -08:00
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2008-07-25 01:48:00 -07:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:12 +09:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:12 +09:00
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2005-04-16 15:20:36 -07:00
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2006-07-14 00:24:23 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:58 -07:00
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2005-04-16 15:20:36 -07:00
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2008-12-01 13:14:02 -08:00
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2005-04-16 15:20:36 -07:00
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2005-06-21 17:14:31 -07:00
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2005-04-16 15:20:36 -07:00
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2008-12-10 18:17:06 +01:00
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2005-04-16 15:20:36 -07:00
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2008-12-10 18:17:06 +01:00
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2008-07-25 01:47:58 -07:00
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2005-04-16 15:20:36 -07:00
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2006-07-14 00:24:23 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:58 -07:00
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2005-04-16 15:20:36 -07:00
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2006-07-14 00:24:23 -07:00
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2005-04-16 15:20:36 -07:00
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2008-12-01 13:14:02 -08:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:00 -07:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:12 +09:00
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2008-07-25 01:47:59 -07:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:12 +09:00
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2008-07-25 01:48:00 -07:00
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2007-06-14 03:45:12 +09:00
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2005-04-16 15:20:36 -07:00
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2005-08-26 14:02:04 -04:00
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2005-04-16 15:20:36 -07:00
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2009-10-16 15:20:49 +02:00
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2010-08-31 00:37:03 +09:00
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2005-04-16 15:20:36 -07:00
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2010-10-26 14:23:03 -07:00
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2010-10-26 14:19:08 -07:00
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2010-10-26 14:23:03 -07:00
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2010-10-26 14:19:08 -07:00
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2005-04-16 15:20:36 -07:00
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2010-10-26 14:19:08 -07:00
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2005-04-16 15:20:36 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:59 -07:00
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2005-04-16 15:20:36 -07:00
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2009-10-16 15:20:49 +02:00
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2005-04-16 15:20:36 -07:00
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2010-10-26 14:23:03 -07:00
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2010-10-26 14:19:08 -07:00
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2010-10-26 14:23:03 -07:00
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2005-04-16 15:20:36 -07:00
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2010-10-26 14:19:08 -07:00
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2005-04-16 15:20:36 -07:00
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2010-10-26 14:19:08 -07:00
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2005-04-16 15:20:36 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:59 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:59 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:02 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:02 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:02 -07:00
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2005-04-16 15:20:36 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:02 -07:00
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2005-10-30 15:02:14 -08:00
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2005-04-16 15:20:36 -07:00
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2010-10-26 14:19:08 -07:00
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2007-02-10 01:45:59 -08:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:02 -07:00
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2005-04-16 15:20:36 -07:00
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2005-10-30 15:02:14 -08:00
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2008-07-25 01:48:02 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:02 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:02 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:47:58 -07:00
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2008-07-25 01:48:02 -07:00
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2005-04-16 15:20:36 -07:00
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2008-05-01 04:34:57 -07:00
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2005-04-16 15:20:36 -07:00
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2007-07-15 23:37:24 -07:00
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2010-10-26 14:19:08 -07:00
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2007-07-15 23:37:24 -07:00
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2007-07-31 00:39:19 -07:00
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idr: fix backtrack logic in idr_remove_all
Currently idr_remove_all will fail with a use after free error if
idr::layers is bigger than 2, which on 32 bit systems corresponds to items
more than 1024. This is due to stepping back too many levels during
backtracking. For simplicity let's assume that IDR_BITS=1 -> we have 2
nodes at each level below the root node and each leaf node stores two IDs.
(In reality for 32 bit systems IDR_BITS=5, with 32 nodes at each sub-root
level and 32 IDs in each leaf node). The sequence of freeing the nodes at
the moment is as follows:
layer
1 -> a(7)
2 -> b(3) c(5)
3 -> d(1) e(2) f(4) g(6)
Until step 4 things go fine, but then node c is freed, whereas node g
should be freed first. Since node c contains the pointer to node g we'll
have a use after free error at step 6.
How many levels we step back after visiting the leaf nodes is currently
determined by the msb of the id we are currently visiting:
Step
1. node d with IDs 0,1 is freed, current ID is advanced to 2.
msb of the current ID bit 1. This means we need to step back
1 level to node b and take the next sibling, node e.
2-3. node e with IDs 2,3 is freed, current ID is 4, msb is bit 2.
This means we need to step back 2 levels to node a, freeing
node b on the way.
4-5. node f with IDs 4,5 is freed, current ID is 6, msb is still
bit 2. This means we again need to step back 2 levels to node
a and free c on the way.
6. We should visit node g, but its pointer is not available as
node c was freed.
The fix changes how we determine the number of levels to step back.
Instead of deducting this merely from the msb of the current ID, we should
really check if advancing the ID causes an overflow to a bit position
corresponding to a given layer. In the above example overflow from bit 0
to bit 1 should mean stepping back 1 level. Overflow from bit 1 to bit 2
should mean stepping back 2 levels and so on.
The fix was tested with IDs up to 1 << 20, which corresponds to 4 layers
on 32 bit systems.
Signed-off-by: Imre Deak <imre.deak@nokia.com>
Reviewed-by: Tejun Heo <tj@kernel.org>
Cc: Eric Paris <eparis@redhat.com>
Cc: "Paul E. McKenney" <paulmck@linux.vnet.ibm.com>
Cc: <stable@kernel.org> [2.6.34.1]
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2010-05-26 14:43:38 -07:00
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2007-07-15 23:37:24 -07:00
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2009-03-10 12:55:52 -07:00
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2007-07-15 23:37:24 -07:00
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2007-07-31 00:39:19 -07:00
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2007-07-15 23:37:24 -07:00
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|
idr: fix backtrack logic in idr_remove_all
Currently idr_remove_all will fail with a use after free error if
idr::layers is bigger than 2, which on 32 bit systems corresponds to items
more than 1024. This is due to stepping back too many levels during
backtracking. For simplicity let's assume that IDR_BITS=1 -> we have 2
nodes at each level below the root node and each leaf node stores two IDs.
(In reality for 32 bit systems IDR_BITS=5, with 32 nodes at each sub-root
level and 32 IDs in each leaf node). The sequence of freeing the nodes at
the moment is as follows:
layer
1 -> a(7)
2 -> b(3) c(5)
3 -> d(1) e(2) f(4) g(6)
Until step 4 things go fine, but then node c is freed, whereas node g
should be freed first. Since node c contains the pointer to node g we'll
have a use after free error at step 6.
How many levels we step back after visiting the leaf nodes is currently
determined by the msb of the id we are currently visiting:
Step
1. node d with IDs 0,1 is freed, current ID is advanced to 2.
msb of the current ID bit 1. This means we need to step back
1 level to node b and take the next sibling, node e.
2-3. node e with IDs 2,3 is freed, current ID is 4, msb is bit 2.
This means we need to step back 2 levels to node a, freeing
node b on the way.
4-5. node f with IDs 4,5 is freed, current ID is 6, msb is still
bit 2. This means we again need to step back 2 levels to node
a and free c on the way.
6. We should visit node g, but its pointer is not available as
node c was freed.
The fix changes how we determine the number of levels to step back.
Instead of deducting this merely from the msb of the current ID, we should
really check if advancing the ID causes an overflow to a bit position
corresponding to a given layer. In the above example overflow from bit 0
to bit 1 should mean stepping back 1 level. Overflow from bit 1 to bit 2
should mean stepping back 2 levels and so on.
The fix was tested with IDs up to 1 << 20, which corresponds to 4 layers
on 32 bit systems.
Signed-off-by: Imre Deak <imre.deak@nokia.com>
Reviewed-by: Tejun Heo <tj@kernel.org>
Cc: Eric Paris <eparis@redhat.com>
Cc: "Paul E. McKenney" <paulmck@linux.vnet.ibm.com>
Cc: <stable@kernel.org> [2.6.34.1]
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2010-05-26 14:43:38 -07:00
|
|
|
|
2007-07-15 23:37:24 -07:00
|
|
|
|
idr: fix backtrack logic in idr_remove_all
Currently idr_remove_all will fail with a use after free error if
idr::layers is bigger than 2, which on 32 bit systems corresponds to items
more than 1024. This is due to stepping back too many levels during
backtracking. For simplicity let's assume that IDR_BITS=1 -> we have 2
nodes at each level below the root node and each leaf node stores two IDs.
(In reality for 32 bit systems IDR_BITS=5, with 32 nodes at each sub-root
level and 32 IDs in each leaf node). The sequence of freeing the nodes at
the moment is as follows:
layer
1 -> a(7)
2 -> b(3) c(5)
3 -> d(1) e(2) f(4) g(6)
Until step 4 things go fine, but then node c is freed, whereas node g
should be freed first. Since node c contains the pointer to node g we'll
have a use after free error at step 6.
How many levels we step back after visiting the leaf nodes is currently
determined by the msb of the id we are currently visiting:
Step
1. node d with IDs 0,1 is freed, current ID is advanced to 2.
msb of the current ID bit 1. This means we need to step back
1 level to node b and take the next sibling, node e.
2-3. node e with IDs 2,3 is freed, current ID is 4, msb is bit 2.
This means we need to step back 2 levels to node a, freeing
node b on the way.
4-5. node f with IDs 4,5 is freed, current ID is 6, msb is still
bit 2. This means we again need to step back 2 levels to node
a and free c on the way.
6. We should visit node g, but its pointer is not available as
node c was freed.
The fix changes how we determine the number of levels to step back.
Instead of deducting this merely from the msb of the current ID, we should
really check if advancing the ID causes an overflow to a bit position
corresponding to a given layer. In the above example overflow from bit 0
to bit 1 should mean stepping back 1 level. Overflow from bit 1 to bit 2
should mean stepping back 2 levels and so on.
The fix was tested with IDs up to 1 << 20, which corresponds to 4 layers
on 32 bit systems.
Signed-off-by: Imre Deak <imre.deak@nokia.com>
Reviewed-by: Tejun Heo <tj@kernel.org>
Cc: Eric Paris <eparis@redhat.com>
Cc: "Paul E. McKenney" <paulmck@linux.vnet.ibm.com>
Cc: <stable@kernel.org> [2.6.34.1]
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2010-05-26 14:43:38 -07:00
|
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2008-07-25 01:48:02 -07:00
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2007-07-15 23:37:24 -07:00
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2005-10-23 12:57:18 -07:00
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|
2010-08-31 00:37:03 +09:00
|
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2005-10-23 12:57:18 -07:00
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2008-07-25 01:47:58 -07:00
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2005-10-23 12:57:18 -07:00
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2005-04-16 15:20:36 -07:00
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2008-07-25 01:48:01 -07:00
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2005-04-16 15:20:36 -07:00
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2010-02-22 17:04:55 -08:00
|
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2008-12-01 13:14:02 -08:00
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2005-04-16 15:20:36 -07:00
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2008-12-01 13:14:02 -08:00
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2005-04-16 15:20:36 -07:00
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2008-12-01 13:14:02 -08:00
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2010-02-22 17:04:55 -08:00
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2005-04-16 15:20:36 -07:00
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2007-07-15 23:37:24 -07:00
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2010-10-26 14:19:08 -07:00
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2007-07-15 23:37:24 -07:00
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2010-02-22 17:04:55 -08:00
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2007-07-15 23:37:24 -07:00
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2010-02-22 17:04:55 -08:00
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2007-07-15 23:37:24 -07:00
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cgroup: CSS ID support
Patch for Per-CSS(Cgroup Subsys State) ID and private hierarchy code.
This patch attaches unique ID to each css and provides following.
- css_lookup(subsys, id)
returns pointer to struct cgroup_subysys_state of id.
- css_get_next(subsys, id, rootid, depth, foundid)
returns the next css under "root" by scanning
When cgroup_subsys->use_id is set, an id for css is maintained.
The cgroup framework only parepares
- css_id of root css for subsys
- id is automatically attached at creation of css.
- id is *not* freed automatically. Because the cgroup framework
don't know lifetime of cgroup_subsys_state.
free_css_id() function is provided. This must be called by subsys.
There are several reasons to develop this.
- Saving space .... For example, memcg's swap_cgroup is array of
pointers to cgroup. But it is not necessary to be very fast.
By replacing pointers(8bytes per ent) to ID (2byes per ent), we can
reduce much amount of memory usage.
- Scanning without lock.
CSS_ID provides "scan id under this ROOT" function. By this, scanning
css under root can be written without locks.
ex)
do {
rcu_read_lock();
next = cgroup_get_next(subsys, id, root, &found);
/* check sanity of next here */
css_tryget();
rcu_read_unlock();
id = found + 1
} while(...)
Characteristics:
- Each css has unique ID under subsys.
- Lifetime of ID is controlled by subsys.
- css ID contains "ID" and "Depth in hierarchy" and stack of hierarchy
- Allowed ID is 1-65535, ID 0 is UNUSED ID.
Design Choices:
- scan-by-ID v.s. scan-by-tree-walk.
As /proc's pid scan does, scan-by-ID is robust when scanning is done
by following kind of routine.
scan -> rest a while(release a lock) -> conitunue from interrupted
memcg's hierarchical reclaim does this.
- When subsys->use_id is set, # of css in the system is limited to
65535.
[bharata@linux.vnet.ibm.com: remove rcu_read_lock() from css_get_next()]
Signed-off-by: KAMEZAWA Hiroyuki <kamezawa.hiroyu@jp.fujitsu.com>
Acked-by: Paul Menage <menage@google.com>
Cc: Li Zefan <lizf@cn.fujitsu.com>
Cc: Balbir Singh <balbir@in.ibm.com>
Cc: Daisuke Nishimura <nishimura@mxp.nes.nec.co.jp>
Signed-off-by: Bharata B Rao <bharata@linux.vnet.ibm.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2009-04-02 16:57:25 -07:00
|
|
|
|
|
|
|
|
|
|
|
|
|
|
2010-08-31 00:37:03 +09:00
|
|
|
|
cgroup: CSS ID support
Patch for Per-CSS(Cgroup Subsys State) ID and private hierarchy code.
This patch attaches unique ID to each css and provides following.
- css_lookup(subsys, id)
returns pointer to struct cgroup_subysys_state of id.
- css_get_next(subsys, id, rootid, depth, foundid)
returns the next css under "root" by scanning
When cgroup_subsys->use_id is set, an id for css is maintained.
The cgroup framework only parepares
- css_id of root css for subsys
- id is automatically attached at creation of css.
- id is *not* freed automatically. Because the cgroup framework
don't know lifetime of cgroup_subsys_state.
free_css_id() function is provided. This must be called by subsys.
There are several reasons to develop this.
- Saving space .... For example, memcg's swap_cgroup is array of
pointers to cgroup. But it is not necessary to be very fast.
By replacing pointers(8bytes per ent) to ID (2byes per ent), we can
reduce much amount of memory usage.
- Scanning without lock.
CSS_ID provides "scan id under this ROOT" function. By this, scanning
css under root can be written without locks.
ex)
do {
rcu_read_lock();
next = cgroup_get_next(subsys, id, root, &found);
/* check sanity of next here */
css_tryget();
rcu_read_unlock();
id = found + 1
} while(...)
Characteristics:
- Each css has unique ID under subsys.
- Lifetime of ID is controlled by subsys.
- css ID contains "ID" and "Depth in hierarchy" and stack of hierarchy
- Allowed ID is 1-65535, ID 0 is UNUSED ID.
Design Choices:
- scan-by-ID v.s. scan-by-tree-walk.
As /proc's pid scan does, scan-by-ID is robust when scanning is done
by following kind of routine.
scan -> rest a while(release a lock) -> conitunue from interrupted
memcg's hierarchical reclaim does this.
- When subsys->use_id is set, # of css in the system is limited to
65535.
[bharata@linux.vnet.ibm.com: remove rcu_read_lock() from css_get_next()]
Signed-off-by: KAMEZAWA Hiroyuki <kamezawa.hiroyu@jp.fujitsu.com>
Acked-by: Paul Menage <menage@google.com>
Cc: Li Zefan <lizf@cn.fujitsu.com>
Cc: Balbir Singh <balbir@in.ibm.com>
Cc: Daisuke Nishimura <nishimura@mxp.nes.nec.co.jp>
Signed-off-by: Bharata B Rao <bharata@linux.vnet.ibm.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2009-04-02 16:57:25 -07:00
|
|
|
|
|
|
|
|
|
2010-08-27 17:43:46 +09:00
|
|
|
|
|
|
|
|
|
cgroup: CSS ID support
Patch for Per-CSS(Cgroup Subsys State) ID and private hierarchy code.
This patch attaches unique ID to each css and provides following.
- css_lookup(subsys, id)
returns pointer to struct cgroup_subysys_state of id.
- css_get_next(subsys, id, rootid, depth, foundid)
returns the next css under "root" by scanning
When cgroup_subsys->use_id is set, an id for css is maintained.
The cgroup framework only parepares
- css_id of root css for subsys
- id is automatically attached at creation of css.
- id is *not* freed automatically. Because the cgroup framework
don't know lifetime of cgroup_subsys_state.
free_css_id() function is provided. This must be called by subsys.
There are several reasons to develop this.
- Saving space .... For example, memcg's swap_cgroup is array of
pointers to cgroup. But it is not necessary to be very fast.
By replacing pointers(8bytes per ent) to ID (2byes per ent), we can
reduce much amount of memory usage.
- Scanning without lock.
CSS_ID provides "scan id under this ROOT" function. By this, scanning
css under root can be written without locks.
ex)
do {
rcu_read_lock();
next = cgroup_get_next(subsys, id, root, &found);
/* check sanity of next here */
css_tryget();
rcu_read_unlock();
id = found + 1
} while(...)
Characteristics:
- Each css has unique ID under subsys.
- Lifetime of ID is controlled by subsys.
- css ID contains "ID" and "Depth in hierarchy" and stack of hierarchy
- Allowed ID is 1-65535, ID 0 is UNUSED ID.
Design Choices:
- scan-by-ID v.s. scan-by-tree-walk.
As /proc's pid scan does, scan-by-ID is robust when scanning is done
by following kind of routine.
scan -> rest a while(release a lock) -> conitunue from interrupted
memcg's hierarchical reclaim does this.
- When subsys->use_id is set, # of css in the system is limited to
65535.
[bharata@linux.vnet.ibm.com: remove rcu_read_lock() from css_get_next()]
Signed-off-by: KAMEZAWA Hiroyuki <kamezawa.hiroyu@jp.fujitsu.com>
Acked-by: Paul Menage <menage@google.com>
Cc: Li Zefan <lizf@cn.fujitsu.com>
Cc: Balbir Singh <balbir@in.ibm.com>
Cc: Daisuke Nishimura <nishimura@mxp.nes.nec.co.jp>
Signed-off-by: Bharata B Rao <bharata@linux.vnet.ibm.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2009-04-02 16:57:25 -07:00
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2010-06-07 17:09:45 -07:00
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cgroup: CSS ID support
Patch for Per-CSS(Cgroup Subsys State) ID and private hierarchy code.
This patch attaches unique ID to each css and provides following.
- css_lookup(subsys, id)
returns pointer to struct cgroup_subysys_state of id.
- css_get_next(subsys, id, rootid, depth, foundid)
returns the next css under "root" by scanning
When cgroup_subsys->use_id is set, an id for css is maintained.
The cgroup framework only parepares
- css_id of root css for subsys
- id is automatically attached at creation of css.
- id is *not* freed automatically. Because the cgroup framework
don't know lifetime of cgroup_subsys_state.
free_css_id() function is provided. This must be called by subsys.
There are several reasons to develop this.
- Saving space .... For example, memcg's swap_cgroup is array of
pointers to cgroup. But it is not necessary to be very fast.
By replacing pointers(8bytes per ent) to ID (2byes per ent), we can
reduce much amount of memory usage.
- Scanning without lock.
CSS_ID provides "scan id under this ROOT" function. By this, scanning
css under root can be written without locks.
ex)
do {
rcu_read_lock();
next = cgroup_get_next(subsys, id, root, &found);
/* check sanity of next here */
css_tryget();
rcu_read_unlock();
id = found + 1
} while(...)
Characteristics:
- Each css has unique ID under subsys.
- Lifetime of ID is controlled by subsys.
- css ID contains "ID" and "Depth in hierarchy" and stack of hierarchy
- Allowed ID is 1-65535, ID 0 is UNUSED ID.
Design Choices:
- scan-by-ID v.s. scan-by-tree-walk.
As /proc's pid scan does, scan-by-ID is robust when scanning is done
by following kind of routine.
scan -> rest a while(release a lock) -> conitunue from interrupted
memcg's hierarchical reclaim does this.
- When subsys->use_id is set, # of css in the system is limited to
65535.
[bharata@linux.vnet.ibm.com: remove rcu_read_lock() from css_get_next()]
Signed-off-by: KAMEZAWA Hiroyuki <kamezawa.hiroyu@jp.fujitsu.com>
Acked-by: Paul Menage <menage@google.com>
Cc: Li Zefan <lizf@cn.fujitsu.com>
Cc: Balbir Singh <balbir@in.ibm.com>
Cc: Daisuke Nishimura <nishimura@mxp.nes.nec.co.jp>
Signed-off-by: Bharata B Rao <bharata@linux.vnet.ibm.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2009-04-02 16:57:25 -07:00
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2010-06-07 17:09:45 -07:00
|
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|
|
cgroup: CSS ID support
Patch for Per-CSS(Cgroup Subsys State) ID and private hierarchy code.
This patch attaches unique ID to each css and provides following.
- css_lookup(subsys, id)
returns pointer to struct cgroup_subysys_state of id.
- css_get_next(subsys, id, rootid, depth, foundid)
returns the next css under "root" by scanning
When cgroup_subsys->use_id is set, an id for css is maintained.
The cgroup framework only parepares
- css_id of root css for subsys
- id is automatically attached at creation of css.
- id is *not* freed automatically. Because the cgroup framework
don't know lifetime of cgroup_subsys_state.
free_css_id() function is provided. This must be called by subsys.
There are several reasons to develop this.
- Saving space .... For example, memcg's swap_cgroup is array of
pointers to cgroup. But it is not necessary to be very fast.
By replacing pointers(8bytes per ent) to ID (2byes per ent), we can
reduce much amount of memory usage.
- Scanning without lock.
CSS_ID provides "scan id under this ROOT" function. By this, scanning
css under root can be written without locks.
ex)
do {
rcu_read_lock();
next = cgroup_get_next(subsys, id, root, &found);
/* check sanity of next here */
css_tryget();
rcu_read_unlock();
id = found + 1
} while(...)
Characteristics:
- Each css has unique ID under subsys.
- Lifetime of ID is controlled by subsys.
- css ID contains "ID" and "Depth in hierarchy" and stack of hierarchy
- Allowed ID is 1-65535, ID 0 is UNUSED ID.
Design Choices:
- scan-by-ID v.s. scan-by-tree-walk.
As /proc's pid scan does, scan-by-ID is robust when scanning is done
by following kind of routine.
scan -> rest a while(release a lock) -> conitunue from interrupted
memcg's hierarchical reclaim does this.
- When subsys->use_id is set, # of css in the system is limited to
65535.
[bharata@linux.vnet.ibm.com: remove rcu_read_lock() from css_get_next()]
Signed-off-by: KAMEZAWA Hiroyuki <kamezawa.hiroyu@jp.fujitsu.com>
Acked-by: Paul Menage <menage@google.com>
Cc: Li Zefan <lizf@cn.fujitsu.com>
Cc: Balbir Singh <balbir@in.ibm.com>
Cc: Daisuke Nishimura <nishimura@mxp.nes.nec.co.jp>
Signed-off-by: Bharata B Rao <bharata@linux.vnet.ibm.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2009-04-02 16:57:25 -07:00
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2010-01-29 20:59:17 +00:00
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|
cgroup: CSS ID support
Patch for Per-CSS(Cgroup Subsys State) ID and private hierarchy code.
This patch attaches unique ID to each css and provides following.
- css_lookup(subsys, id)
returns pointer to struct cgroup_subysys_state of id.
- css_get_next(subsys, id, rootid, depth, foundid)
returns the next css under "root" by scanning
When cgroup_subsys->use_id is set, an id for css is maintained.
The cgroup framework only parepares
- css_id of root css for subsys
- id is automatically attached at creation of css.
- id is *not* freed automatically. Because the cgroup framework
don't know lifetime of cgroup_subsys_state.
free_css_id() function is provided. This must be called by subsys.
There are several reasons to develop this.
- Saving space .... For example, memcg's swap_cgroup is array of
pointers to cgroup. But it is not necessary to be very fast.
By replacing pointers(8bytes per ent) to ID (2byes per ent), we can
reduce much amount of memory usage.
- Scanning without lock.
CSS_ID provides "scan id under this ROOT" function. By this, scanning
css under root can be written without locks.
ex)
do {
rcu_read_lock();
next = cgroup_get_next(subsys, id, root, &found);
/* check sanity of next here */
css_tryget();
rcu_read_unlock();
id = found + 1
} while(...)
Characteristics:
- Each css has unique ID under subsys.
- Lifetime of ID is controlled by subsys.
- css ID contains "ID" and "Depth in hierarchy" and stack of hierarchy
- Allowed ID is 1-65535, ID 0 is UNUSED ID.
Design Choices:
- scan-by-ID v.s. scan-by-tree-walk.
As /proc's pid scan does, scan-by-ID is robust when scanning is done
by following kind of routine.
scan -> rest a while(release a lock) -> conitunue from interrupted
memcg's hierarchical reclaim does this.
- When subsys->use_id is set, # of css in the system is limited to
65535.
[bharata@linux.vnet.ibm.com: remove rcu_read_lock() from css_get_next()]
Signed-off-by: KAMEZAWA Hiroyuki <kamezawa.hiroyu@jp.fujitsu.com>
Acked-by: Paul Menage <menage@google.com>
Cc: Li Zefan <lizf@cn.fujitsu.com>
Cc: Balbir Singh <balbir@in.ibm.com>
Cc: Daisuke Nishimura <nishimura@mxp.nes.nec.co.jp>
Signed-off-by: Bharata B Rao <bharata@linux.vnet.ibm.com>
Signed-off-by: Andrew Morton <akpm@linux-foundation.org>
Signed-off-by: Linus Torvalds <torvalds@linux-foundation.org>
2009-04-02 16:57:25 -07:00
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2006-06-26 00:27:19 -07:00
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2010-10-26 14:19:08 -07:00
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2006-06-26 00:27:19 -07:00
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2008-07-25 01:48:02 -07:00
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2006-06-26 00:27:19 -07:00
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2008-12-01 13:14:02 -08:00
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2006-06-26 00:27:19 -07:00
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2008-07-25 01:48:02 -07:00
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2006-06-26 00:27:19 -07:00
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2008-04-29 01:03:13 -07:00
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2005-04-16 15:20:36 -07:00
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2008-04-29 01:03:13 -07:00
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2009-01-15 13:51:21 -08:00
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2005-04-16 15:20:36 -07:00
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2007-06-14 03:45:13 +09:00
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2010-10-26 14:19:08 -07:00
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2007-06-14 03:45:13 +09:00
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2010-10-26 14:19:08 -07:00
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2007-06-14 03:45:13 +09:00
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2010-10-26 14:19:08 -07:00
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2007-06-14 03:45:13 +09:00
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2010-08-31 00:37:03 +09:00
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2007-06-14 03:45:13 +09:00
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2011-10-31 17:12:36 -07:00
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2007-06-14 03:45:13 +09:00
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2010-10-26 14:19:08 -07:00
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2007-06-14 03:45:13 +09:00
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2010-10-26 14:19:08 -07:00
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2007-06-14 03:45:13 +09:00
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2010-10-26 14:19:08 -07:00
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2007-06-14 03:45:13 +09:00
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2008-07-25 01:47:59 -07:00
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2007-06-14 03:45:13 +09:00
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2008-07-25 01:48:00 -07:00
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2007-06-14 03:45:13 +09:00
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2008-07-25 01:47:58 -07:00
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2007-06-14 03:45:13 +09:00
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2010-10-26 14:19:08 -07:00
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2007-06-14 03:45:13 +09:00
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2010-10-26 14:19:08 -07:00
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2007-06-14 03:45:13 +09:00
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2011-08-03 16:18:39 +02:00
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2007-06-14 03:45:13 +09:00
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2010-08-31 00:37:03 +09:00
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2007-06-14 03:45:13 +09:00
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2011-08-03 16:21:06 -07:00
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2011-11-02 13:38:46 -07:00
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2011-08-03 16:21:06 -07:00
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2011-11-02 13:38:46 -07:00
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2011-08-03 16:21:06 -07:00
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2011-11-02 13:38:46 -07:00
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2011-08-03 16:21:06 -07:00
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2011-11-02 13:38:46 -07:00
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2011-08-03 16:21:06 -07:00
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2011-11-02 13:38:46 -07:00
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2011-08-03 16:21:06 -07:00
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2011-11-02 13:38:46 -07:00
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2011-08-03 16:21:06 -07:00
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2007-06-14 03:45:13 +09:00
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