2055 lines
101 KiB
Text
2055 lines
101 KiB
Text
==Phrack Inc.==
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Volume 0x0b, Issue 0x3b, Phile #0x06 of 0x12
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|=--------------=[ Defeating Forensic Analysis on Unix ]=----------------=|
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|=-----------------------------------------------------------------------=|
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|=-------------=[ the grugq <grugq@anti-forensics.com> ]=----------------=|
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|=--------------------[ www.anti-forensics.com ]=------------------------=|
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--[ Contents
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1 - Introduction
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1.1 - Generic Unix File Systems
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1.2 - Forensics
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2 - Anti-Forensics
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3 - Runefs
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3.1 - Creating hidden space
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3.2 - Using hidden space
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3.3 - TCT unclear on ext2fs specifications
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4 - The Defiler's Toolkit
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4.1 - Necrofile
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4.1.1 - TCT locates deleted inodes
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4.1.2 - Necrofile locates and eradicates deleted inodes
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4.1.3 - TCT unable to locate non-existant data
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4.2 - Klismafile
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4.2.1 - fls listing deleted directory entries
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4.2.2 - Klismafile cleaning deleted directory entries
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4.2.3 - fls unable to find non-existant data
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5 - Conclusion
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6 - Greets
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7 - References
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8 - Appendix
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8.1 - The Ext2fs
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8.2 - runefs.tar.gz (uuencoded)
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8.3 - tdt.tar.gz (uuencoded)
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--[ 1 - Introduction
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Anti-forensics: the removal, or hiding, of evidence in an attempt to
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mitigate the effectiveness of a forensics investigation.
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Digital forensic analysis is rapidly becoming an integral part of
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incident response, capitalising on a steady increase in the number of
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trained forensic investigators and forensic toolkits available. Strangly,
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despite the increased interest in, and focus on, forensics within the
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information security industry, there is surprisingly little discussion of
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anti-forensics. In an attempt to remedy the lack of coverage in the
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literature, this article presents anti-forensic strategies to defeat
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digital forensic analysis on Unix file systems. Included are example
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implementations of these strategies targeting the most common Linux file
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system -- ext2fs.
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To facilitate a useful discussion of anti-forensic strategies it is
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important that the reader possess certain background information. In
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particular, the understanding of anti-forensic file system sanitization
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requires the comprehension of basic Unix file system organisation. And, of
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course, the understanding of any anti-forensic theory demands at least a
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rudimentary grasp of digital forensic methodology and practise. This
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article provides a limited introduction to both Unix file systems and
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digital forensics. Space constraints, however, limit the amount of coverage
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available to these topics, and the interested reader is directed to the
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references, which discuss them in greater depth.
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----[ 1.1 - Generic Unix File Systems
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This section will describe basic Unix file system theory (not focussing
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on any specific implementation), discussing the meta-data structures used
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to organise the file system internally. Files within the Unix OS are
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continuous streams of bytes of arbitrary length and are the main
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abstraction used for I/O. This article will focus on files in the more
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general sense of data stored on disk and organised by a file system.
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The data on a disk compriising a Unix file systems is commonly divided
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into two groups, information about the files and the data within the files.
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The organizational and accounting information (normally only visible only
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to the kernel) is called "meta-data", and includes the super-block, inodes
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and directory files. The content stored in the files is simply called
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"data".
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To create the abstraction of a file the kernel has to transparently
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translate data stored across one or more sectors on a hard disk into a
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seemless stream of bytes. The file system is used to keep track of which,
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and in what order, these sectors should be group together into a file.
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Additionally, these sector groups need to be kept seperate, and
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individually distinguishable to the operating system. For this reason there
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are several types of meta-data, each responsible for accomplishing one of
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these various tasks.
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The content of a file is stored on data blocks which are logical
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clusters of hard disk sectors. The higher the number of sectors per data
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block the faster the speed of the disk I/O, improving the file system's
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performance. At the same time, the larger the data blocks the larger the
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disk space wasted for files which don't end on block boundaries. Modern
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file systems typically compromise with block size of 4096 or 8192 bytes,
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and combat the disk wastage with "fragments" (something not dealt with
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here). The portion of the disk dedicated to the data blocks is organised as
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an array, and blocks are referred to by their offsets within this array.
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The state of a given block, i.e. free vs. allocated, is stored in a bitmap
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called the "block bitmap".
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Data blocks are clustered and organised into files by inodes. Inodes
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are the meta-data structure which represent the user visible files; one for
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each unique file. Each inode contains an array of block pointers (that is,
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indexes into the data block array) and various other information about the
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file. This additional information about the file includes: the UID; GID;
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size; permissions; modification/access/creation (MAC) times, and some other
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data. The limited amount of space available to inodes means the the block
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pointer array can only contain a small number of pointers. To allow file
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sizes to be of substantial length, inodes employ "indirect blocks". An
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indirect block acts as an extension to the block array, storing additional
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pointers. Doubly and trebly indirect blocks contain block pointers to
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further indirect blocks, and doubly indirect blocks respectively. Inodes
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are stored in an array called the inode table, and are referred to by their
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0-based indexes within this table. The state of an inode, i.e. free vs.
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allocated, is stored in a bitmap called, imaginitively, the "inode bitmap".
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Files, that is, inodes, are associated with file names by special
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structures called directory entries stored within directory files. These
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structures are stored contigously inside the directory file. Directory
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entries have a basic structure of:
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struct dirent {
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int inode;
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short rec_size;
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short name_len;
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char file_name[NAME_LEN];
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};
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The 'inode' element of the dirent contains the inode number which is
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linked with the file name, stored in 'file_name'. To save space, the actual
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length of the file name is recorded in 'name_len' and the remaining space
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in the file_name array is used by the next directory entry structure. The
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size of a dirent is usually rounded up to the closest power of two, and
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this size is stored in 'rec_size'. When a file name/inode link is removed,
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the inode value is set to 0 and the rec_size of the preceding dirent is
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extended to encompass the deleted dirent. This has the effect of storing
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the names of deleted files inside directory files.
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Everytime an file name is linked with a file name, and internal counter
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within the inode is incremented. Likewise, everytime a link is removed,
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this counter is decremented. When this counter reaches 0, there are no
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references to the inode from within the directory structure; the file is
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deleted. Files which have been deleted can safely have their resources, the
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data blocks and the inode itself, freed. This is accomplished by marking
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the appropriate bitmaps.
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Directories files themselves are logically organised as a tree starting
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from a root directory. This root directory file is associated with a known
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inode (inode 2) so that the kernel can locate it, and mount the file
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system.
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To mount a file system the kernel needs to know the size and locations
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of the meta-data. The first piece of meta-data, the super block, is stored
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at a known location. The super-block contains information such as the
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number of inodes and blocks, the size of a block, and a great deal of
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additional information. Based on the data within the super block, the
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kernel is able to calculate the locations and sizes of the inode table and
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the data portion of the disk.
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For performance reasons, no modern file system actually has just one
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inode table and one block array. Rather inodes and blocks are clustered
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together in groups spread out across the disk. These groups usually contain
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private bitmaps for their inodes and blocks, as well as copies of the
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superblock to aid recovery in case of catastrophic data loss.
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Thus concludes the whirlwind tour of a generic unix file system. A
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specific implementation is described in Appendix A: The Second Extended
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File System. The next section will provide an introduction to digital file
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system forensics.
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----[ 1.2 - Forensics
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Digital forensic analysis on a file system is conducted to gather
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evidence for some purpose. As stated previously, this purpose is irrelevant
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to this discussion because anti-forensics theory shouldn't rely on the
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intended use of the evidence; it should focus on preventing the evidence
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from being gathered. That being said, ignorance as to the reasons behind an
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analysis provides no benefit, so we will examine the two primary motivators
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behind an investigation.
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The purpose of an incident response analysis of a file system is either
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casual, or legal. These terms are not the standard means to describing
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motives and because there are significant differences between the two, some
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explanation is in order.
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Legal investigations are to aid a criminal prosecution. The strict
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requirements on evidence to be submitted to a court of law make subversion
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of a legal forensic investigations fairly easy. For instance, merely
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overwriting the file system with random data is sufficient to demonstrate
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that none of the data gathered is reliable enough for submission as
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evidence.
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Casual investigations do not have as their goal the criminal
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prosecution of an individual. The investigation is executed because of
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interest on the part of the forensic analyst, and so the techniques, tools
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and methodology used are more liberally inclined. Subverting a casual
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forensic analysis requires more effort and skill because there are no
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strict third party requirements regarding the quality or quantity of
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evidence.
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Regardless of the intent of the forensics investigation, the steps
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followed are essentially the same:
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* the file system needs to be captured
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* the information contained on it gathered
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* this data parsed into evidence
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* this evidence examined.
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This evidence is both file content (data), and information about the
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file(s) (meta-data). Based on the evidence retrieved from the file system
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the investigator will attempt to:
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* gather information about the individual(s) involved [who]
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* determine the exact nature of events that transpired [what]
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* construct a timeline of events [when]
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* discover what tools or exploits where used [how]
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As an example to how the forensics process works, the example of the
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recovery of a deleted file will be presented.
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A file is deleted on a Unix file system by decrementing the inode's
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internal link count to 0. This is accomplished by removing all directory
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entry file name inode pairs. When the inode is deleted, the kernel will
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mark is resources as available for use by other files -- and that is all.
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The inode will still contain all of the data about the file which it
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referenced, and the data blocks it points to will still contain file
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content. This remains the case until they have been reallocated, and
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reused; overwriting this residual data.
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Given this dismal state of affairs, recovering a deleted file is
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trivial for the forensic analyst. Simply searching for inodes which have
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some data (i.e. are not virgin inodes), but have a link count of 0 reveals
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all deleted inodes. The block pointers can then be followed up and the file
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contents (hopefully) recovered. Even without the file content, a forensic
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analyst can learn much about what happened on a file system with only the
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meta-data present in the directory entries and inodes. This meta-data is
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not accessable through the kernel system call interface and thus is not
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alterable by normal system tools (this is not strictly true, but is
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accurate enough from a forensics POV).
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Unfortunately, accomplishing this is extremely difficult, if not
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impossible, when the forensic analyst is faced with a hostile
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anti-forensics agent. The digital forensics industry has had an easy time
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of late due to the near absense of anti-forensics information and tools,
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but that is (obviously) about to change.
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--[ 2 - Anti-Forensics
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In the previous section forensic analysis was outlined, and means of
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subverting the forensic process were hinted at, this section will expand on
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anti-forensic theory. Anti-forensics is the attempt to mitigate the
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quantity and quality of information that an investigator can examine. At
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each steps of the analysis, the forensics process is vulnerable to attack
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and subversion. This article focuses primarily on subverting the data
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gathering phase of a digital forensics investigation, with two mechanisms
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being detailed here: the first is data destruction, and the second data
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hiding. Some mention will also be given to exploiting vulnerabilities
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throughout the analytic process.
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The digital forensics process is extremely vulnerable to subversion
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when raw data (e.g. a bit copy of a file system) is converted into evidence
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(e.g. emails). This conversion process is vulnerable at almost every step,
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usually because of an abstraction that is performed on the data. When an
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abstraction layer is encountered, details are lost, and details *are* data.
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Abstractions remove data, and this creates gaps in the evidence which can
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be exploit. But abstractions are not the only source of error during a
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forensic analysis, the tools used are themselves frequently flawed and
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imperfect. Bugs in the implementations of forensic tools provide even
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greater oppurtunities for exploitation by anti-forensic agents.
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There is little that a remote anti-forensics agent can do to prevent
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the file system from being captured, and so focus has been given to
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exploiting the next phase of a forensic investigation -- preventing the
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evidence from being gathered off the file system. Halting data aquisition
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can be accomplished by either of two primary mechanisms: data destruction
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and data hiding. Of the two methods, data destruction is the most reliable,
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leaving nothing behind for the investigator to analyse. Data destruction
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provides a means of securely removing all trace of the existance of
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evidence, effectively covering tracks.
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Data hiding, on the other hand, is useful only so long as the analyst
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doesn't know where to look. Long term integrity of the data storage area
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cannot be garaunteed. For this reason, data hiding should be used in
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combination with attacks against the parsing phase (e.g. proprietary file
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formats), and against the examination phase (e.g. encryption). Data hiding
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is most useful in the case of essential data which must be stored for some
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length of time (e.g. photographs of young women in artistic poses).
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The two toolkits which accompany this article provide demonstration
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implementations of both data destruction, and data hiding methodologies.
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The toolkits will be used to provide examples when examining data
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destruction and hiding in greater detail below. The first anti-forensics
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methodology that will be examined in depth is data hiding.
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--[ 3 - Runefs
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The most common toolkit for Unix forensic file system analysis is "The
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Coronor's Toolkit"[1] (TCT) developed by Dan Farmer and Wietse Venema.
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Despite being relied on for years as the mainstay of the Unix digital
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forensic analyst, and providing the basis for several enhancements [2][3],
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it remains as flawed today as when it was first released. A major file
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system implementation bug allows an attacker to store arbitrary amounts of
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data in a location which the TCT tools cannot examine.
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The TCT implementations of the Berkley Fast File System (FFS or
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sometimes UFS), and the Second Extended File System (ext2fs), fail to
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correctly reproduce the file system specifications. TCT makes the incorrect
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assumption that no data blocks can be allocated to an inode before the root
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inode; failing to take into account the bad blocks inode.
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Historically, the bad blocks inode was used to reference data blocks
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occupying bad sectors of the hard disk, preventing these blocks from being
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used by live files. The FFS has deprecated the bad blocks inode, preventing
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the successful exploitation of this bug, but it is still in use on ext2fs.
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Successfully exploiting a file system data hiding attack means, for an
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anti-forensics agent, manipulating the file system without altering it
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outside of the specifications implemented in the file system checker: fsck.
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Although, it is interesting to note that no forensic analysis methodology
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uses fsck to ensure that the file system has not been radically altered.
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The ext2fs fsck still uses the bad blocks inode for bad block
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referencing, and so it allows any number of blocks to be allocated to the
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inode. Unfortunately, the TCT file system code does not recognise the bad
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blocks inode as within the scope of an investigation. The bad blocks inode
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bug is easy to spot, and should be trivial to correct. Scattered throughout
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the file system code of the TCT package (and the related toolkit TASK) is
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the following errorneous check:
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/*
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* Sanity check.
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*/
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if (inum < EXT2_ROOT_INO || inum > ext2fs->fs.s_inodes_count)
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error("invalid inode number: %lu", (ULONG) inum);
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The first inode that can allocate block resources on a ext2 file system
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is in fact the bad blocks inode (inode 1) -- *not* the root inode (inode
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2). Because of this mis-implementation of the ext2fs it is possible to
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store data on blocks allocated to the bad blocks inode and have it hidden
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from an analyst using TCT or TASK. To illustrate the severity of this
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attack the following examples demonstrate using the accompanying runefs
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toolkit to: create hidden storage space; copy data to and from this area,
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and show how this area remains secure from a forensic analyst.
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----[ 3.1 - Example: Creating hidden space
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# df -k /dev/hda6
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Filesystem 1k-blocks Used Available Use% Mounted on
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/dev/hda6 1011928 20 960504 1% /mnt
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# ./bin/mkrune -v /dev/hda6
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+++ bb_blk +++
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bb_blk->start = 33275
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bb_blk->end = 65535
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bb_blk->group = 1
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bb_blk->size = 32261
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+++
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rune size: 126M
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# df -k /dev/hda6
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Filesystem 1k-blocks Used Available Use% Mounted on
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/dev/hda6 1011928 129196 831328 14% /mnt
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# e2fsck -f /dev/hda6
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e2fsck 1.26 (3-Feb-2002)
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Pass 1: Checking inodes, blocks, and sizes
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Pass 2: Checking directory structure
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Pass 3: Checking directory connectivity
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Pass 4: Checking reference counts
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Pass 5: Checking group summary information
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/dev/hda6: 11/128768 files (0.0% non-contiguous), 36349/257032 blocks
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#
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This first example demonstrates the allocation of 126 megabytes of disk
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space for the hidden storage area, showing how this loss of available disk
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space is registered by the kernel. It is also evident that the hidden
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storage area does not break the specifications of the ext2 file system --
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fsck has no complaints.
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----[ 3.2 - Example: Using the hidden space
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# cat readme.tools | ./bin/runewr /dev/hda6
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# ./bin/runerd /dev/hda6 > f
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# diff f readme.tools
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#
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This second example shows how data can be inserted and extracted from
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the hidden storage space without any data loss. While this example does not
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comprehensively explore the uses of a hidden data storage area, it is
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sufficient to demonstrate how data can be introduced to and extracted from
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the runefs.
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----[ 3.3 - Example: TCT incorrect ext2fs implementation
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# ./icat /dev/hda6 1
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/icat: invalid inode number: 1
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#
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This last example illustrates how the forensic analyst is incapable of
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finding this storage area with the TCT tools. Clearly, there are many
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problems raised when the file system being examined has not been correctly
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implemented in the tools used.
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Interesting as these examples are, there are problems with this runefs.
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This implementation of runefs is crude and old (it was written in November
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2000), and it does not natively support encryption. The current version of
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runefs is a dynamicly resizeable file system which supports a full
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directory structure, is fully encrypted, and can grow up to four gigabytes
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in size (it is private, and not will be made available to the public).
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The final problem with this runefs in particular, and the private
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implementation as well, is that the bad blocks data hiding technique is now
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public knowledge (quite obviously). This highlights the problem with data
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hiding techniques, they become out dated. For this reason data hiding
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should always be used in conjunction with at least one other anti-forensics
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technology, such as encryption.
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There are more ways of securely storing data on the file system far
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from the prying eyes of the forensic analyst, and a research paper is due
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shortly that will detail many of them. However, this is the last this
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article will mention on data hiding, now the focus shifts to data
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destruction.
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--[ 4 - The Defiler's Toolkit
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The file system (supposedly) contains a record of file I/O activity on
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a computer and forensic analysts attempt to extract this record for
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examination. Aside from their forensic tools incorrectly reporting on the
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data, these tools are useless if the data is not there to be reported on.
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This section will present methodologies for thoroughly eradicating evidence
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on a file system. These methodologies have been implemented in The
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Defiler's Toolkit (TDT) which accompanies this article.
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The major vulnerablity with data aquisition is that the evidence being
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gathered must be there when the forensic analyst begins his investigation.
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Non-existant data, obviously, cannot be gathered, and without this crucial
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information the forensic analyst is incapable of progressing the
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investigation.
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File system sanitization is the anti-forensic strategy of removing this
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data (evidence), and doing so in such a way so as to leave no trace that
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evidence ever existed (i.e. leave no "evidence of erasure"). The Defiler's
|
|
Toolkit provides tools to remove data from the file system with surgical
|
|
precision. By selectively eradicating the data which might become evidence,
|
|
the anti-forensics agent is able to subvert the entire forensics process
|
|
before it is even begun.
|
|
|
|
Within a Unix file system all of the following places will contain
|
|
traces of the existence of a file -- they contain evidence:
|
|
|
|
* inodes
|
|
* directory entries
|
|
* data blocks
|
|
|
|
Unfortunately, most secure deletion tools will only remove evidence
|
|
from data blocks, leaving inodes and directory entries untouched. Included
|
|
with this article is an example implementation of an anti-forensic toolkit
|
|
which performs complete file system sanitization. The Defiler's Toolkit
|
|
provides two tools, necrofile and klismafile, which, combined, securely
|
|
eliminate all trace of a file's existance.
|
|
|
|
The Defiler's Toolkit consists of two complimentary tools, necrofile
|
|
and klismafile. Their design goals and implementation are described here.
|
|
|
|
----[ 4.1 - Necrofile
|
|
|
|
Necrofile is a sophisicated dirty inode selection and eradication tool.
|
|
It can be used to list all dirty inodes meeting certain deletion time
|
|
criteria, and then scrub those inodes clean. These clean inodes provide no
|
|
evidence for the forensic analyst investigating the file system contained
|
|
on that disk.
|
|
|
|
Necrofile has some built in capabilities to securely delete all content
|
|
on the data blocks referenced by the dirty inode. However, this is not the
|
|
ideal use of the tool because of the race conditions which afflict all
|
|
tools handling file system resources without the blessing of the kernel.
|
|
|
|
When necrofile is invoked, it is supplied with a file system to search,
|
|
and a number of criteria be used to determine whether a given dirty inode
|
|
should be scrubbed clean. As necrofile iterates through the inode table, it
|
|
check the state of each inode, with dirty inodes being given extra
|
|
attention. All dirty inodes that meet the time criteria are written back
|
|
to the inode table as virgin inodes, and the iteration continues.
|
|
|
|
------[ 4.1.1 - Example: TCT locates deleted inodes
|
|
|
|
# ./ils /dev/hda6
|
|
class|host|device|start_time
|
|
ils|XXX|/dev/hda6|1026771982
|
|
st_ino|st_alloc|st_uid|st_gid|st_mtime|st_atime|st_ctime|st_dtime|st_mode|\
|
|
st_nlink|st_size|st_block0|st_block1
|
|
12|f|0|0|1026771841|1026771796|1026771958|1026771958|100644|0|86|545|0
|
|
13|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|546|0
|
|
14|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|547|0
|
|
15|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|548|0
|
|
16|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|549|0
|
|
17|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|550|0
|
|
18|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|551|0
|
|
19|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|552|0
|
|
20|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|553|0
|
|
21|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|554|0
|
|
22|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|555|0
|
|
23|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|556|0
|
|
24|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|557|0
|
|
25|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|558|0
|
|
26|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|559|0
|
|
27|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|560|0
|
|
28|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|561|0
|
|
29|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|562|0
|
|
30|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|563|0
|
|
31|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|564|0
|
|
32|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|565|0
|
|
33|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|566|0
|
|
34|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|567|0
|
|
35|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|568|0
|
|
36|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|569|0
|
|
37|f|0|0|1026771842|1026771796|1026771958|1026771958|100644|0|86|570|0
|
|
#
|
|
|
|
------[ 4.1.2 - Example: necrofile locates and eradicates deleted inodes
|
|
|
|
# ./necrofile -v -v -v -v /dev/hda6
|
|
Scrubbing device: /dev/hda6
|
|
12 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
13 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
14 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
15 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
16 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
17 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
18 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
19 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
20 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
21 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
22 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
23 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
24 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
25 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
26 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
27 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
28 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
29 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
30 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
31 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
32 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
33 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
34 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
35 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
36 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
37 = m: 0x3d334d4d a: 0x3d334d4d c: 0x3d334d4f d: 0x3d334d4f
|
|
|
|
#
|
|
|
|
------[ 4.1.3 - Example: TCT unable to locate non-existant data
|
|
|
|
# ./ils /dev/hda6
|
|
class|host|device|start_time
|
|
ils|XXX|/dev/hda6|1026772140
|
|
st_ino|st_alloc|st_uid|st_gid|st_mtime|st_atime|st_ctime|st_dtime|st_mode|\
|
|
st_nlink|st_size|st_block0|st_block1
|
|
#
|
|
|
|
Little explanation is necessary with these examples. The "ils" tool is
|
|
part of TCT and lists deleted inodes for potential recovery. The necrofile
|
|
tool is being run in its most verbose form, as it locates and overwrites
|
|
the same inodes found by ils. Necrofile is more effective, however, when
|
|
used to target inodes deleted during specific time slices, leaving all
|
|
other deleted inodes untouched. This tactic eliminates evidence of erasure,
|
|
i.e. indications that evidence has been removed. After the deleted inodes
|
|
have been converted into virgin inodes, ils is justifiably incapable of
|
|
finding them. After removing the inodes which contain valuable forensic
|
|
data, the other location which needs to be sanitized is the directory
|
|
entries.
|
|
|
|
----[ 4.2 - Klismafile
|
|
|
|
Klismafile provides a means of securely overwriting deleted directory
|
|
entries. When a file name/inode link is terminated, the content of the
|
|
directory entry is not overwritten; simply included in the slack space of
|
|
the preceeding entry. Klismafile will search a directory file for these
|
|
"deleted" entries, and overwrite them. Regular expressions can be used to
|
|
limit the number of directory entries removed.
|
|
|
|
When klismafile is invoked, it is provided with a directory file to
|
|
search, and can optionally recurse through all other directory files it
|
|
encounters. Klismafile will iterate through the directory entries, and
|
|
search for dirents which have been deleted. When it encounters a deleted
|
|
dirent, klismafile will compare the 'file_name' against any regular
|
|
expressions provided by the invoker (the default is '*'). If there is a
|
|
match, klismafile will overwrite the dirent with zeroes.
|
|
|
|
Klismafile is not a completely secure solution. A skilled forensic
|
|
analyst will note that the preceeding directory entry's rec_len field is
|
|
larger than it should be, and could infer than a tool such as klismafile
|
|
has artificially manipulated the directory file's contents. Currently,
|
|
there are no tools which perform this check, however that will no doubt
|
|
change soon.
|
|
|
|
------[ 4.2.1 - Example: fls listing deleted directory entries
|
|
|
|
# ./fls -d /dev/hda6 2
|
|
? * 0: a
|
|
? * 0: b
|
|
? * 0: c
|
|
? * 0: d
|
|
? * 0: e
|
|
? * 0: f
|
|
? * 0: g
|
|
? * 0: h
|
|
? * 0: i
|
|
? * 0: j
|
|
? * 0: k
|
|
? * 0: l
|
|
? * 0: m
|
|
? * 0: n
|
|
? * 0: o
|
|
? * 0: p
|
|
? * 0: q
|
|
? * 0: r
|
|
? * 0: s
|
|
? * 0: t
|
|
? * 0: u
|
|
? * 0: v
|
|
? * 0: w
|
|
? * 0: x
|
|
? * 0: y
|
|
? * 0: z
|
|
#
|
|
|
|
------[ 4.2.2 - Example: Klismafile cleaning deleted directory entries
|
|
|
|
# ./klismafile -v /mnt
|
|
Scrubbing device: /dev/hda6
|
|
cleansing /
|
|
-> a
|
|
-> b
|
|
-> c
|
|
-> d
|
|
-> e
|
|
-> f
|
|
-> g
|
|
-> h
|
|
-> i
|
|
-> j
|
|
-> k
|
|
-> l
|
|
-> m
|
|
-> n
|
|
-> o
|
|
-> p
|
|
-> q
|
|
-> r
|
|
-> s
|
|
-> t
|
|
-> u
|
|
-> v
|
|
-> w
|
|
-> x
|
|
-> y
|
|
-> z
|
|
Total files found: 29
|
|
Directories checked: 1
|
|
Dirents removed : 26
|
|
#
|
|
|
|
------[ 4.2.3 - Example: fls unable to find non-existant data
|
|
|
|
# ./fls -d /dev/hda6 2
|
|
#
|
|
|
|
These examples speak for themselves. The 'fls' utility is part of the
|
|
TCT-UTILS package, and is intended to examine directory files. In this
|
|
case, it is listing all deleted directory entries in the root directory of
|
|
the file system. Klismafile is then run in verbose mode, listing and
|
|
overwriting each directory entry it encounters. After klismafile, fls is
|
|
incapable of noting that anything is amiss within the directory file.
|
|
|
|
Note: The linux 2.4 kernel caches directories in kernel memory, rather
|
|
than immediately updating the file system on disk. Because of this, the
|
|
directory file that klismafile examines and attempts to clean might not be
|
|
current, or the changes made might get overwritten by the kernel. Usually,
|
|
performing disk activity in another directory will flush the cache,
|
|
allowing kilsmafile to work optimally.
|
|
|
|
The Defiler's Toolkit has been written as a proof of concept utility to
|
|
demonstrate the inherent flaws with all current digital forensic
|
|
methodologies and techniques. The toolkit successfully accomplishes the
|
|
goals for which it was designed; proving that forensic analysis after an
|
|
intrusion is highly suspect without significant prior preparation of the
|
|
targeted computers.
|
|
|
|
|
|
--[ 5 - Conclusion
|
|
|
|
Digital forensic tools are buggy, error prone and inherently flawed.
|
|
Despite these short comings they are being relied on more and more
|
|
frequently to investigate computer break-ins. Given that this
|
|
fundamentally broken software plays such a key role in incident response,
|
|
it is somewhat surprising that no-one has documented anti-forensic
|
|
techniques, nor sort to develop counter-measures (anti-anti-forensics).
|
|
Some suggestions regarding anti-anti-forensics methodology are presented
|
|
here, to provide the security community a foothold in the struggle against
|
|
anti-forensics.
|
|
|
|
The Defilers Toolkit directly modifies the file system to eliminate
|
|
evidence inserted by the operating system during run time. The way to
|
|
defeat the defiler's toolkit is to not rely on the local file system as the
|
|
only record of disk operations. For instance, make a duplicate record of
|
|
the file system modifications and store this record in a secure place. The
|
|
simplest solution would be to have all inode updates be written to a log
|
|
file located on a seperate box. A trivial addition to the kernel vfs
|
|
layer, and a syslog server would be more than adequate for a first
|
|
generation anti-anti-fornesics tool.
|
|
|
|
The only means of effectively counteracting an anti-forensics attack
|
|
is to prepare for such an eventuality prior to an incident. However,
|
|
without the tools to make such preparation effective, the computing public
|
|
is left vulnerable to attackers whose anonymity is assured. This article is
|
|
intended as a goad to prod the security industry into developing effective
|
|
tools. Hopefully the next generation of digital forensic investigating
|
|
tookits will give the defenders something reliable with which to
|
|
effectively combat the attackers.
|
|
|
|
|
|
--[ 6 - Greets
|
|
|
|
Shout outs to my homies!
|
|
East Side: stealth, scut, silvio, skyper, smiler, halvar, acpizer, gera
|
|
West Side: blaadd, pug, srk, phuggins, fooboo, will, joe
|
|
Up Town: mammon_, a_p, _dose
|
|
Down Town: Grendel, PhD.
|
|
|
|
|
|
--[ 7 - References:
|
|
|
|
[1] Dan Farmer, Wietse Venema "TCT"
|
|
www.fish.com/security
|
|
[2] Brian Carrier "TCTUTILS"
|
|
www.cerias.purdue.edu/homes/carrier/forensics
|
|
[3] Brian Carrier "TASK"
|
|
www.cerias.purdue.edu/homes/carrier/forensics
|
|
[4] Theodore T'so "e2fsprogs"
|
|
e2fsprogs.sourceforge.net
|
|
|
|
|
|
--[ 8 - APPENDIX A
|
|
|
|
----[ 8.1 - Ext2fs
|
|
|
|
In the honored phrack tradition of commented header files, here is a
|
|
guide to the second extended file system.
|
|
|
|
The second extended file system (ext2fs) is the standard file system on
|
|
the Linux OS. This paper will provide an introduction to the file system.
|
|
Reading this document is no substitute for reading the src, both in the
|
|
kernel and in the ext2fs library.
|
|
|
|
What follows is a bottom up description of the ext2 file system;
|
|
starting with blocks and inodes and concluding, ultimately, with
|
|
directories.
|
|
|
|
. o O ( B L O C K S ) O o .
|
|
|
|
The basic component of the file system is the data block, used to store
|
|
file content. Typically, the smallest addressable unit on a hard disk is a
|
|
sector (512 bytes), but this is too small for decent I/O rates. To increase
|
|
performance multiple sectors are clustered together and treated as one
|
|
unit: the data block. The typical block size on an ext2fs system is 4096
|
|
bytes; however, it can be 2048 bytes or even as small as 1024 (8, 4 and 2
|
|
sectors, respectively).
|
|
|
|
. o O ( I N O D E S ) O o .
|
|
|
|
The second core part of the file system, the inode, is the heart of
|
|
the Unix file system. It contains the meta-data about each file including:
|
|
pointers to the data blocks, file permissions, size, owner, group and other
|
|
vital peices of information.
|
|
|
|
The format of an ext2 inode is as follows:
|
|
|
|
---------------------------------------------------------------------------
|
|
struct ext2_inode {
|
|
__u16 i_mode; /* File mode */
|
|
__u16 i_uid; /* Owner Uid */
|
|
__u32 i_size; /* Size in bytes */
|
|
__u32 i_atime; /* Access time */
|
|
__u32 i_ctime; /* Creation time */
|
|
__u32 i_mtime; /* Modification time */
|
|
__u32 i_dtime; /* Deletion Time */
|
|
__u16 i_gid; /* Group Id */
|
|
__u16 i_links_count; /* Links count */
|
|
__u32 i_blocks; /* Blocks count */
|
|
__u32 i_flags; /* File flags */
|
|
union {
|
|
struct {
|
|
__u32 l_i_reserved1;
|
|
} linux1;
|
|
struct {
|
|
__u32 h_i_translator;
|
|
} hurd1;
|
|
struct {
|
|
__u32 m_i_reserved1;
|
|
} masix1;
|
|
} osd1; /* OS dependent 1 */
|
|
__u32 i_block[EXT2_N_BLOCKS];/* Pointers to blocks */
|
|
__u32 i_version; /* File version (for NFS) */
|
|
__u32 i_file_acl; /* File ACL */
|
|
__u32 i_dir_acl; /* Directory ACL */
|
|
__u32 i_faddr; /* Fragment address */
|
|
union {
|
|
struct {
|
|
__u8 l_i_frag; /* Fragment number */
|
|
__u8 l_i_fsize; /* Fragment size */
|
|
__u16 i_pad1;
|
|
__u32 l_i_reserved2[2];
|
|
} linux2;
|
|
struct {
|
|
__u8 h_i_frag; /* Fragment number */
|
|
__u8 h_i_fsize; /* Fragment size */
|
|
__u16 h_i_mode_high;
|
|
__u16 h_i_uid_high;
|
|
__u16 h_i_gid_high;
|
|
__u32 h_i_author;
|
|
} hurd2;
|
|
struct {
|
|
__u8 m_i_frag; /* Fragment number */
|
|
__u8 m_i_fsize; /* Fragment size */
|
|
__u16 m_pad1;
|
|
__u32 m_i_reserved2[2];
|
|
} masix2;
|
|
} osd2; /* OS dependent 2 */
|
|
};
|
|
---------------------------------------------------------------------------
|
|
|
|
The two unions exist because the ext2fs is intended to be used on
|
|
several operating systems that provide slightly differing features in their
|
|
implementations. Aside from exceptional cases, the only elements of the
|
|
unions that matter are the Linux structs: linux1 and linux2. These can
|
|
simply be treated as padding as their contents are ignored in current
|
|
implementations of ext2fs. The usage of the rest of the inode's values are
|
|
described below.
|
|
|
|
* i_mode The mode of the file, this is the usual octal permissions
|
|
that Unix users should be familiar with.
|
|
|
|
* i_uid The UID of the owner of the file.
|
|
|
|
* i_size The size of the file, in bytes. Clearly the maximum size is
|
|
4G, as size is an unsigned 32bit integer. Support for 64bit
|
|
file sizes had been hacked in with the following define
|
|
supplying the high 32bits:
|
|
#define i_size_high i_dir_acl
|
|
|
|
* i_atime The last time the file was accessed. All times are stored
|
|
in usual Unix manner: seconds since the epoch.
|
|
|
|
* i_ctime The creation time of the file.
|
|
|
|
* i_mtime The last time the file was modified.
|
|
|
|
* i_dtime The deletion time of the file. If the file is still live
|
|
then the time will be 0x00000000.
|
|
|
|
* i_gid The GID of the file.
|
|
|
|
* i_links_count The number of times that the file is referenced in the high
|
|
level file system. That is, each hard link to the file
|
|
increments this count. When the last link to the file is
|
|
removed from the FS, and the links count reaches 0, the
|
|
file is deleted. The blocks referenced by the inode are
|
|
marked as free in the bitmap.
|
|
|
|
* i_blocks The number of blocks referenced by the inode. This is count
|
|
doesn't include the indirect blocks, only blocks that
|
|
contain actual file content.
|
|
|
|
* i_flags The extended attributes of the ext2fs are accomplished with
|
|
this value. The valid flags are any combination of the
|
|
following:
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_SECRM_FL 0x00000001 /* Secure deletion */
|
|
#define EXT2_UNRM_FL 0x00000002 /* Undelete */
|
|
#define EXT2_COMPR_FL 0x00000004 /* Compress file */
|
|
#define EXT2_SYNC_FL 0x00000008 /* Synchronous updates */
|
|
#define EXT2_IMMUTABLE_FL 0x00000010 /* Immutable file */
|
|
#define EXT2_APPEND_FL 0x00000020 /* append only */
|
|
#define EXT2_NODUMP_FL 0x00000040 /* do not dump file */
|
|
#define EXT2_NOATIME_FL 0x00000080 /* do not update atime */
|
|
/* Reserved for compression usage... */
|
|
#define EXT2_DIRTY_FL 0x00000100
|
|
#define EXT2_COMPRBLK_FL 0x00000200 /* compressed clusters */
|
|
#define EXT2_NOCOMP_FL 0x00000400 /* Don't compress */
|
|
#define EXT2_ECOMPR_FL 0x00000800 /* Compression error */
|
|
/* End compression flags --- maybe not all used */
|
|
#define EXT2_BTREE_FL 0x00001000 /* btree format dir */
|
|
#define EXT2_RESERVED_FL 0x80000000 /* reserved for ext2 lib */
|
|
---------------------------------------------------------------------------
|
|
|
|
* i_block[] The block pointers. There are 15 array elements, the first
|
|
12 elements are direct blocks pointers; their blocks
|
|
contain actual file content. The 13th element points to a
|
|
block that acts as an extension of the array. This block is
|
|
an indirect block, and the pointers it contains point to
|
|
additional direct blocks. The 14th element points to a block
|
|
containing an array of block pointers to indirect blocks.
|
|
This element is the doubly indirect block. The last element
|
|
is the trebly indirect block. This block contains pointers
|
|
to doubly indirect blocks.
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_NDIR_BLOCKS 12
|
|
#define EXT2_IND_BLOCK EXT2_NDIR_BLOCKS
|
|
#define EXT2_DIND_BLOCK (EXT2_IND_BLOCK + 1)
|
|
#define EXT2_TIND_BLOCK (EXT2_DIND_BLOCK + 1)
|
|
#define EXT2_N_BLOCKS (EXT2_TIND_BLOCK + 1)
|
|
---------------------------------------------------------------------------
|
|
|
|
* i_version The file version. Doesn't appear to be used.
|
|
|
|
* i_file_acl A pointer to an ACL list. This is not used on ext2, as
|
|
there are no ACLs implemented for this version of the file
|
|
system.
|
|
|
|
* i_dir_acl A pointer to an ACL list. This is not used on ext2 as an
|
|
ACL pointer, but rather as the value: [ i_size_high ]. This
|
|
is an additional 32bits of file size, allowing the file size
|
|
to be treated as a 64bit unsigned intetger. This is not
|
|
generally used on ext2fs.
|
|
|
|
* i_faddr The fragment address. Fragments are not used on the ext2fs;
|
|
therefore, this value is always 0.
|
|
|
|
Certain inodes have special significance within the file system.
|
|
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_BAD_INO 1 /* Bad blocks inode */
|
|
#define EXT2_ROOT_INO 2 /* Root inode */
|
|
#define EXT2_ACL_IDX_INO 3 /* ACL inode */
|
|
#define EXT2_ACL_DATA_INO 4 /* ACL inode */
|
|
#define EXT2_BOOT_LOADER_INO 5 /* Boot loader inode */
|
|
#define EXT2_UNDEL_DIR_INO 6 /* Undelete directory inode */
|
|
---------------------------------------------------------------------------
|
|
|
|
The bad blocks inode contains block pointers to data blocks that occupy
|
|
bad sectors of the hard disk. The root inode is the root directory that
|
|
contains the head of the file system tree. The other inodes are not
|
|
typically used on production systems. The first inode used for user files
|
|
is inode 11. This inode is the directory "lost+found", created by the tool
|
|
mkfs.
|
|
|
|
. o O ( S U P E R B L O C K ) O o .
|
|
|
|
The super block is the most basic means that the kernel has of
|
|
determining the status of the file system. It indicates the number of
|
|
inodes, blocks, and groups, in addition to various other pieces of
|
|
information. The elements within the super block structure change more
|
|
rapidly than the inode or group data. This is because libext2fs adds
|
|
features to the ext2fs which might not be implemented in the kernel. The
|
|
format we examine is from e2fsprogs-1.19.
|
|
|
|
The super block is 1024 bytes in size, and offset 1024 bytes from the
|
|
start of the partition.
|
|
|
|
The format of the super block is as follows:
|
|
---------------------------------------------------------------------------
|
|
struct ext2fs_sb {
|
|
__u32 s_inodes_count; /* Inodes count */
|
|
__u32 s_blocks_count; /* Blocks count */
|
|
__u32 s_r_blocks_count; /* Reserved blocks count */
|
|
__u32 s_free_blocks_count; /* Free blocks count */
|
|
__u32 s_free_inodes_count; /* Free inodes count */
|
|
__u32 s_first_data_block; /* First Data Block */
|
|
__u32 s_log_block_size; /* Block size */
|
|
__s32 s_log_frag_size; /* Fragment size */
|
|
__u32 s_blocks_per_group; /* # Blocks per group */
|
|
__u32 s_frags_per_group; /* # Fragments per group */
|
|
__u32 s_inodes_per_group; /* # Inodes per group */
|
|
__u32 s_mtime; /* Mount time */
|
|
__u32 s_wtime; /* Write time */
|
|
__u16 s_mnt_count; /* Mount count */
|
|
__s16 s_max_mnt_count; /* Maximal mount count */
|
|
__u16 s_magic; /* Magic signature */
|
|
__u16 s_state; /* File system state */
|
|
__u16 s_errors; /* Behaviour when detecting errors */
|
|
__u16 s_minor_rev_level; /* minor revision level */
|
|
__u32 s_lastcheck; /* time of last check */
|
|
__u32 s_checkinterval; /* max. time between checks */
|
|
__u32 s_creator_os; /* OS */
|
|
__u32 s_rev_level; /* Revision level */
|
|
__u16 s_def_resuid; /* Default uid for reserved blocks */
|
|
__u16 s_def_resgid; /* Default gid for reserved blocks */
|
|
/*
|
|
* These fields are for EXT2_DYNAMIC_REV superblocks only.
|
|
*
|
|
* Note: the difference between the compatible feature set and
|
|
* the incompatible feature set is that if there is a bit set
|
|
* in the incompatible feature set that the kernel doesn't
|
|
* know about, it should refuse to mount the filesystem.
|
|
*
|
|
* e2fsck's requirements are more strict; if it doesn't know
|
|
* about a feature in either the compatible or incompatible
|
|
* feature set, it must abort and not try to meddle with
|
|
* things it doesn't understand...
|
|
*/
|
|
__u32 s_first_ino; /* First non-reserved inode */
|
|
__u16 s_inode_size; /* size of inode structure */
|
|
__u16 s_block_group_nr; /* block group # of this superblock */
|
|
__u32 s_feature_compat; /* compatible feature set */
|
|
__u32 s_feature_incompat; /* incompatible feature set */
|
|
__u32 s_feature_ro_compat; /* readonly-compatible feature set */
|
|
__u8 s_uuid[16]; /* 128-bit uuid for volume */
|
|
char s_volume_name[16]; /* volume name */
|
|
char s_last_mounted[64]; /* directory where last mounted */
|
|
__u32 s_algorithm_usage_bitmap; /* For compression */
|
|
/*
|
|
* Performance hints. Directory preallocation should only
|
|
* happen if the EXT2_FEATURE_COMPAT_DIR_PREALLOC flag is on.
|
|
*/
|
|
__u8 s_prealloc_blocks; /* Nr of blocks to try to preallocate*/
|
|
__u8 s_prealloc_dir_blocks; /* Nr to preallocate for dirs */
|
|
__u16 s_padding1;
|
|
/*
|
|
* Journaling support.
|
|
*/
|
|
__u8 s_journal_uuid[16]; /* uuid of journal superblock */
|
|
__u32 s_journal_inum; /* inode number of journal file */
|
|
__u32 s_journal_dev; /* device number of journal file */
|
|
__u32 s_last_orphan; /* start of list of inodes to delete */
|
|
|
|
__u32 s_reserved[197]; /* Padding to the end of the block */
|
|
};
|
|
---------------------------------------------------------------------------
|
|
|
|
* s_inodes_count The total number of inodes within the file system.
|
|
|
|
* s_blocks_count The total number of blocks within the file system.
|
|
|
|
* s_r_blocks_count The number of blocks reserved for the super user.
|
|
If the FS becomes too full, these last reserved
|
|
blocks will prevent users from making the FS
|
|
unusable.
|
|
|
|
* s_free_blocks_count The number of unused blocks. This value is
|
|
constantly updated as blocks are freed or
|
|
allocated.
|
|
|
|
* s_free_inodes_count The number of unused inodes. This value is
|
|
constantly updates as inodes are freed or allocated.
|
|
|
|
* s_first_data_block A pointer to the first data block, after all the
|
|
blocks used to store inode tables, bitmaps and
|
|
groups. This value is either 0, or the correct
|
|
value.
|
|
|
|
* s_log_block_size The size of a block. This value is stored as a
|
|
shift value. The number to be shifted is 1024;
|
|
therefore, to retrive the actual block size use:
|
|
bs = 1024 << sb.s_log_block_size;
|
|
|
|
* s_log_frag_size The size of a fragment. This value is stored as a
|
|
shift value. Fragments are not used on the ext2fs;
|
|
therefore, this value is ignored.
|
|
|
|
* s_blocks_per_group The number of blocks in a group.
|
|
|
|
* s_frags_per_group The number of fragments in a group.
|
|
|
|
* s_inodes_per_group The number of inodes in a group.
|
|
|
|
* s_mtime The last time the file system was mounted. All time
|
|
values are stored as seconds since the epoch.
|
|
|
|
* s_wtime The last time the file system was written.
|
|
|
|
* s_mnt_count The number of times the file system has been
|
|
mounted.
|
|
|
|
* s_max_mnt_count The maximum number of times the file system can be
|
|
mounted before it needs to be fsck'd. The default
|
|
value is 20.
|
|
|
|
* s_magic The magic number of the file system: 0xEF53.
|
|
|
|
* s_state The state of the file system: either clean, or
|
|
dirty. The flags are as follows:
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_VALID_FS 0x0001 /* Unmounted cleanly */
|
|
#define EXT2_ERROR_FS 0x0002 /* Errors detected */
|
|
---------------------------------------------------------------------------
|
|
|
|
* s_errors The response to take when an error is encountered.
|
|
The following are valid values:
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_ERRORS_CONTINUE 1 /* Continue execution */
|
|
#define EXT2_ERRORS_RO 2 /* Remount fs read-only */
|
|
#define EXT2_ERRORS_PANIC 3 /* Panic */
|
|
#define EXT2_ERRORS_DEFAULT EXT2_ERRORS_CONTINUE
|
|
---------------------------------------------------------------------------
|
|
|
|
* s_minor_rev_level The minor number of the ext2fs revision. This value
|
|
can be safely ignored.
|
|
|
|
* s_lastcheck The last time the file system was fsck'd, stored in
|
|
typical Unix sec's since epoch format.
|
|
|
|
* s_checkinterval The maximum amount of time that can elapse between
|
|
fsckings. The file system needs to fscked if either
|
|
this value is exceeded, or s_max_mnt_count.
|
|
|
|
* s_creator_os The OS that created this file system. Valid values
|
|
are as follows:
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_OS_LINUX 0
|
|
#define EXT2_OS_HURD 1
|
|
#define EXT2_OS_MASIX 2
|
|
#define EXT2_OS_FREEBSD 3
|
|
#define EXT2_OS_LITES 4
|
|
---------------------------------------------------------------------------
|
|
|
|
* s_rev_level The revision of the file system. The only
|
|
difference in values deals with inode sizes. The
|
|
current version uses a fixed inode size of 128
|
|
bytes. The following are valid values:
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_GOOD_OLD_REV 0 /* The good old (original) format */
|
|
#define EXT2_DYNAMIC_REV 1 /* V2 format w/ dynamic inode sizes */
|
|
#define EXT2_CURRENT_REV EXT2_GOOD_OLD_REV
|
|
---------------------------------------------------------------------------
|
|
|
|
* s_def_resuid Default UID for reserved blocks. The default is 0.
|
|
|
|
* s_def_resgid Default GID for reserved blocks. The default is 0.
|
|
|
|
* s_first_ino The first non reserved inode. Inodes < 10 are
|
|
reserved, so the first valid inode number is 11.
|
|
This inode is almost always the file "lost+found".
|
|
|
|
* s_inode_size The size of an inode. The size is 128 bytes for
|
|
current ext2fs implementations.
|
|
|
|
* s_block_group_nr The block group that this super block is stored in.
|
|
|
|
* s_feature_compat Flags of features that this ext2fs supports. Valid
|
|
features are the following:
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_FEATURE_COMPAT_DIR_PREALLOC 0x0001
|
|
---------------------------------------------------------------------------
|
|
|
|
* s_feature_incompat Flags of features that this ext2fs doesnt' support.
|
|
Valid incompatabilities are the following:
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_FEATURE_INCOMPAT_COMPRESSION 0x0001
|
|
#define EXT2_FEATURE_INCOMPAT_FILETYPE 0x0002
|
|
---------------------------------------------------------------------------
|
|
|
|
* s_feature_ro_compat Flags of features that this ext2fs supports as read
|
|
only. Valid features are as follows:
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_FEATURE_RO_COMPAT_SPARSE_SUPER 0x0001
|
|
#define EXT2_FEATURE_RO_COMPAT_LARGE_FILE 0x0002
|
|
#define EXT2_FEATURE_RO_COMPAT_BTREE_DIR 0x0004
|
|
---------------------------------------------------------------------------
|
|
|
|
* s_uuid The unique ID of this ext2fs.
|
|
|
|
* s_volume_name The name of the volume. (I don't know what this is
|
|
used for, but it sertainly isn't important).
|
|
|
|
* s_last_mounted The directory on which this file system was last
|
|
mounted.
|
|
|
|
* s_algorithm_usage_bitmap (I don't know how this is used. No
|
|
interest in FS compression.)
|
|
|
|
* s_prealloc_blocks The number of blocks to try to preallocate for a
|
|
file.
|
|
|
|
* s_prealloc_dir_blocks The number of block to try to preallocate for a
|
|
directory file.
|
|
|
|
* s_padding1 padding.
|
|
|
|
* s_journal_* (I don't have journalling support on my FS,
|
|
therefore I do not know how these values are used.)
|
|
* s_reserverd[] This is padding to fill the super block out to 1024
|
|
bytes.
|
|
|
|
|
|
. o O ( G R O U P S ) O o .
|
|
|
|
Ext2fs groups are used to organise clusters of blocks and inodes.
|
|
Groups each contain a bitmap of free inodes, and one of free blocks.
|
|
Additionally each group has a copy of the super block to help prevent
|
|
against catastrophic data loss. Group descriptors are stored on the blocks
|
|
immediately after the super block, following them are bitmaps and inode
|
|
tables, and following that data blocks.
|
|
|
|
The format of a group descriptor is as follows:
|
|
-----------------------------------------------------------------------------
|
|
struct ext2_group_desc
|
|
{
|
|
__u32 bg_block_bitmap; /* Blocks bitmap block */
|
|
__u32 bg_inode_bitmap; /* Inodes bitmap block */
|
|
__u32 bg_inode_table; /* Inodes table block */
|
|
__u16 bg_free_blocks_count; /* Free blocks count */
|
|
__u16 bg_free_inodes_count; /* Free inodes count */
|
|
__u16 bg_used_dirs_count; /* Directories count */
|
|
__u16 bg_pad;
|
|
__u32 bg_reserved[3];
|
|
};
|
|
-----------------------------------------------------------------------------
|
|
|
|
* bg_block_bitmap A block pointer to the block bitmap. The bits in
|
|
the bitmap are set to indicate free/in-use.
|
|
|
|
* bg_inode_bitmap A block pointer to the inode bitmap. The bits in
|
|
the bitmap are set to indicate free/in-use.
|
|
|
|
* bg_inode_table A block pointer to the start of the inode table.
|
|
|
|
* bg_free_blocks_count The number of blocks within the group that are
|
|
available for use.
|
|
|
|
* bg_free_inodes_count The number of inodes within the group that are
|
|
available for use.
|
|
|
|
* bg_used_dirs_count The number of inodes from this group used for
|
|
directory files.
|
|
|
|
* bg_pad padding.
|
|
* pg_reserved[] padding.
|
|
|
|
|
|
|
|
. o O ( D I R E C T O R I E S ) O o .
|
|
|
|
Directories are used to organize files at the Operating system level.
|
|
The contents of a directory file is an array of directory entry structures.
|
|
Each contains the name of a file within the directory, and the inode of
|
|
that file.
|
|
|
|
The format of ext2 directory entries is as follows:
|
|
---------------------------------------------------------------------------
|
|
struct ext2_dir_entry_2 {
|
|
__u32 inode; /* Inode number */
|
|
__u16 rec_len; /* Directory entry length */
|
|
__u8 name_len; /* Name length */
|
|
__u8 file_type;
|
|
char name[EXT2_NAME_LEN]; /* File name */
|
|
};
|
|
---------------------------------------------------------------------------
|
|
|
|
* inode The inode number of the file within the directory. If a
|
|
file has been deleted, the inode number is set to 0.
|
|
|
|
* rec_len The size of the directory entry. As the length of the name
|
|
can be anything up to 255 byte, this allows for more
|
|
efficient use of space within the directory file.
|
|
|
|
* name_len The length of the file's name. This can be up to 255 bytes.
|
|
|
|
* file_type The type of file, i.e. symlink, device, etc. etc. The
|
|
following are valid values:
|
|
---------------------------------------------------------------------------
|
|
#define EXT2_FT_UNKNOWN 0
|
|
#define EXT2_FT_REG_FILE 1
|
|
#define EXT2_FT_DIR 2
|
|
#define EXT2_FT_CHRDEV 3
|
|
#define EXT2_FT_BLKDEV 4
|
|
#define EXT2_FT_FIFO 5
|
|
#define EXT2_FT_SOCK 6
|
|
#define EXT2_FT_SYMLINK 7
|
|
---------------------------------------------------------------------------
|
|
|
|
This concludes the walk through of the physical layout of the ext2 file
|
|
system. Further information is available from
|
|
http://e2fsprogs.sourceforge.net.
|
|
|
|
|
|
----[ 8.2 - runefs.tar.gz (uuencoded)
|
|
|
|
begin 600 runefs.tar.gz
|
|
M'XL(`$LK.3T``^P\87?C-G+Y2O\*W.9=(OELKZ7UVKENDU=9IKWJVI(KR;M)
|
|
M>WT\2H0L=BE2)2E[?9?VMW=F`)`@"5)RLIM>7T\O64N8P<Q@,!C,#$#&FY`O
|
|
MDI=??<G/\?')\=GKU_"7/N6_XOO9Z\[)JY/3S@E\[W2.3T^_8J^_J%3RLTE2
|
|
M-V;LJSB*TB:\;?#_HY]8S/^-^Y$O_(!_$1['G>/CTY.3VOD_S>;_^.STY!3P
|
|
MNZ^[9U^QXR\B3>GS_WS^O][;<X/@'_:L?VJQN<=6']$@V#??L!58!`,0:RL8
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`
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end
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----[ 8.3 - tdt.tar.gz (uuencoded)
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MM*'(J=L2+6LW:+2K12>M%983P!>\)>-%,K*H+SJ*=&9U4JH1L*(($RUN4[JF
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M3C=TD7]D1W?.*:@#)ONM$RNH::&QEOA<+J!@7L1Z@1OGV@3$SC2UJ>?%Q$X(
|
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M!/=4'6,K^:7SBP.'GZYBK3YL^=-$\Y;8O#T]:9^@P0>-M<H/=.W'N3:>8KK,
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M"JOP75-HF<VUB8R-@4+1-#QE.+U+)L+:IMX:*"\ON,26^&O"=B?JJY3B.1'9
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M.ULM3/8Y^IZH=!24B:"(LR@-1F<072#R-*0A<%LD@&0(&M*]A&+8AI&1+6(2
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M)MM_M[;N]?]W\F3RZLZ9YQV']2#77&`QSCB<@ZR+!)ZAA:*M7O3T/HLXO'`,
|
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M>*;`\,\'J+&M3DY*JIAL"%+*)Y.J1F/6Q14UL\/)-A6?;V+U;CB^^J"^6^^K
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|
M1\3-/'H&/X"4H4?=QGQ"?OC/BGA3+Q(G6V<O)2"N^.\QR0+TF<H<I?N6]_-U
|
|
M?<EYQC&4>,0./P,;'J,@-M$MJ#"`RQ.^5+D5K+[L)6(KIBH-E?,0"JB!_UP?
|
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MJ_6K<KK*V*UR+(#JZ6)>Z*M3%J.F2UVYI7YDAC99R@2RC.:EPY^/VIV7^T>O
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|
M@:=+.TS!,HGHR+&3;W6EZ0CK6GZ35J254WY+&662U8T;K''_B?VZID#"#B`9
|
|
MS2G]!>835*:#L]T(.4[.;.!+*@!IH)SC_2:Z8FXQV]O9?=M2UUK@T6BX)'8H
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M_9V8%'=`,YQGLPK=U)%6P-TIP#/<RVP32SUI=:KGSIKN1H7;RW#:FX:PT#OA
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|
M["*FR!GP1U>[G*S!CRO';J%KO1E]4L`?.>M>SDI8Y1T&S'FT\8AMMOVB)`F5
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MD`"I1A*$3B]8[).)O,[$TK-ZATS%A+S$W<=.5%2QM]/?&>P,Q[.KTR+;1!^>
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MO.0QUY&&NTYXX4>]1SM:".[PZ]`LM">B[`$L]6&IZ&0G[*7]N,./^GZ3O+RR
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M6L1P]I2;W<[`;X?N&WD=H\SEW1IR<XD;&X9^<Y/YKD4SEFIAO+2%1.&97WBV
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|
MM/"57WA9)T[]HJ<Y[;I!G<WR\<,KTUZB=;;^E*088Y3#X#I"$;U.L,L1!YVT
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|
MW%W6<7?5=[1UX*_'CUDKXLT5;8ON!YDLM6RVLHET%I6$PXP]BDQ@CP<\W?8C
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|
MO^0>&>[QXB_/XEJ1^^GTDG/\;CHG`I)/0M-<2D/T4<%LBZ4[=M.:S]<7;^J(
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|
M]..%]NI.ZR&Y0_8X]106*3\%Y/]O'?`K\:RR_V\UMHC_W]R"JT`=\5\;M<9]
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M_-<[>?[G:YZ`_D_I]6),#'KT<Q93A(B/T9S+?4W#V<4#^!^PJ6R*=MY'TTJT
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|
M#`AR6F<PK*#PMVY/P9T6%9FC\".!>D(B(V/M(TSX9(RW#@&?2I=/PU&M_6\6
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|
M_,=:?=.9?Z+_V\W[^#]W\K#Q[HO)]'I&1E,<>D")P@6%.H7V]X<=%.R\/CP]
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MZ[1/3EZ_@GN\51+GY>/]LVXE0`+!`_?2TXHZ+Q?PEM8=33'AO*Q.'=T%%CUV
|
|
MRE;4N$R7NK$N3RE4Q6AMYQ,$3B1QMTC?#;*,JV1`$4]"RV!1E_*4%O@.`F&D
|
|
MYDFC8*Q$I/0(;I75:E4K'(@G364A/\C\6W:M-?79$1%TYDK"44M'-2*9VTU(
|
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|
|
M/?[+G3S:_J?S]O3HQ\[KHS,@!H80NXF:G&OI=)&XA:(QN#`./[\:SP7'GD0L
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M2.1O#T2>[4RXRIK%D-^P7E%,=U..14EAHM+J5R2'G@PP517^&E8\$DH$V!<;
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;9]9R2:D_/O<$]/ZY?^Z?O];S?S5<AR(`\```
|
|
`
|
|
end
|
|
|
|
|=[ EOF ]=---------------------------------------------------------------=|
|