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1804 lines
95 KiB
Text
1804 lines
95 KiB
Text
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==Phrack Inc.==
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Volume 0x0b, Issue 0x3a, Phile #0x05 of 0x0e
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|=----=[ Armouring the ELF: Binary encryption on the UNIX platform ]=----=|
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|=-----------------------------------------------------------------------=|
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|=-------=[ grugq <grugq@lokmail.net>, scut <scut@team-teso.net> ]=------=|
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--[ Contents
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- Introduction
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- Why encrypt?
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- What is binary encryption?
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- The threat
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- ELF format
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- ELF headers
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- ELF sections
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- ELF segments
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- ELF support and history
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- ELF loading
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- ELF loading - Linux
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- ELF Linux - auxiliary vectors
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- ELF mapping
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- Binary encryption theory
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- Runtime decryption techniques
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- ELF parasite approach
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- Packing/Userspace ELF loader
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- The future
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- References
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--[ Introduction
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The UNIX world has lagged far behind the Microsoft world (including both
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MS-DOS and MS Windows) in the twin realms of binary protection and reverse
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engineering.
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The variety and types of binary protection are a major area of difference.
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MS Windows PE binaries can be encrypted, packed, wrapped, and thoroughly
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obfuscated, and then decrypted, unpacked, unwrapped, and reconstructed.
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Conversely, the best that can be done to a UNIX ELF binary is stripping the
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debugging symbol table. There are no deconstructors, no wrappers, no
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encrypters, and only a single packer (UPX [12], aimed at decreasing disk
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space, not increasing protection) for the ELF. Clearly the UNIX ELF binary
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is naked compared to the powerful protections afforded the Windows PE binary
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format.
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The quantity and quality of reverse engineering tools are other key areas
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of significant gulf. The runtime environment of the PE binary, and indeed
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the very operating system it executes on, is at the mercy of the brilliant
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debugger SoftICE. Meanwhile the running ELF can only be examined one word
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at a time via the crippled system call ptrace(), imperfectly interfaced via
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adb and its brain dead cousin: gdb. The procfs, on those systems on which
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it is present, typically only provides the ability to examine a process
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rather than control it. Indeed, the UNIX world is an unrealised nightmare
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for the UNIX reverse engineer. Unrealised because up until now no one has
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bothered to protect an ELF binary.
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--[ Why encrypt?
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The prime motivator for protecting files on MS platforms has been to enforce
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copy protection in a failed attempt to ensure payment for shareware
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applications. As of now, there is no such motivation on the UNIX side, but
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there are other reasons to protect binaries.
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From the viewpoint of an attacker the reasons to protect binaries can be
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listed as:
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- hindering forensic analysis in case of detection
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- hindering copying of confidential data (possibly by other
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attackers or commercially motivated forensic investigators*)
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- adding functionality to the protected binary
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From the point of view of a defender, there are also good reasons to
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protect binaries. These can be enumerated as
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- adding a level of authorization checks
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- hindering analysis of customised intrusion detection tools (tools
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that an attacker might figure out how to evade, were they to
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discover their purpose)
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- adding functionality to the protected binary
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The need to protect binaries from analysis in the UNIX world has clearly
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surfaced.
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* Certain big five companies sell their collections of recovered exploits
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for an annual fee.
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--[ What is binary encryption?
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The reasons to protect a binary are clear, now we have to come up with a
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good design for the protection itself. When we talk of protecting binaries
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it is important to know what sort of protection we expect to achieve; we
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must define our requirements. The requirements for this implementation are
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as follows:
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- Only authorised individuals may execute the binary.
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- The on disk binary must be immune for all methods of static
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analysis which might reveal anything substantial about the
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purposes/methods of the binary.
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- The process image of the binary, something that unfortunately
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cannot be hidden, must obscure the purposes/methods of the
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binary.
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- The mechanism for protecting the binary must be production
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quality, being both robust and reliable.
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The best mechanism to fulfill all of these requirements is with some form of
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encryption. We know enough of what we want that we can now define the term
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"binary encryption" as the process of protecting a binary from reverse
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engineering and analysis, while keeping it intact and executeable to the
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underlying operating system. Thus, when we talk of binary encryption we refer
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to a robust security mechanism for protecting binaries.
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--[ The threat
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Today most of the so called "forensic analysts" have very few tools and
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knowledge at hand to counter anything more sophisticated than rm, strip and
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some uncautious attacker. This has been demostrated in the public analysis of
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the x2 binary [14]. Two seminal forensic investigators have been completely
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stumped by a relatively simple binary protection. It is worth mentioning
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that two private reverse engineers reversed the x2 binary to C source code
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in approximately one day.
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The Unix forensic investigater has an extremely limited range of tools at
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her disposal for analysis of a compromised machine. These tools tend to
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be targeted at debugging a misbehaving system, rather than analysing a
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compromised system. While locate, find, lsof and netstat are fine when
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attempting to keep a production system from falling over, when it comes to
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investigating a breakin, they fall short on usefulness. Even TCT is severly
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limited in its capabilities (although that is the subject of another
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paper).
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If the broad analysis of an entire system is so impaired, binary analysis
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is even more so. The forensic analyst is equiped with tools designed to
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debug binaries straight from the back end of an accomidating compiler, not
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the hostile binaries packaged by a crafty attacker. The list of tools is
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short, but for completeness presented here: strings, objdump, readelf,
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ltrace, strace, and gdb. These tools are all based on two flawed interfaces:
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libbfd and ptrace(). There are superior tools currently in development, but
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they are primarily intended for, and used by, Unix reverse engineers and
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other individuals with "alternative" motivations.
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Barring these private reverse engineering applications, no Unix tools exist
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to tackle sophisticated hostile code. This is because the basic Unix
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debugging hooks are very limited. The ubiquitus ptrace() can be easily
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subverted and confused, and while /proc interface is more feature rich, it is
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not uniform across platforms. Additionally the /proc debugging interface
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typically provides only information about the runtime environment of a
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process, not control over its exectuion. Even the most sophisticated procfs
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need not be of any help to the analyst, if the binary is sufficiently
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protected.
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That said, there has been some slight improvement in the quality of analysis
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tools. The powerful Windows only disassembler - IDA - now provides complete
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support for the ELF binary format. Indeed, with the latest release IDA can
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finally handle ELF binaries without a section header table (thanks Ilfak).
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These improvements in the available tools are meaningless however, unless
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there is an accompanying increase in knowledge and skill for the forensic
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analysers. Given that there are almost no skilled reverse engineers in
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forensic analysis (based on the published material one could easily conclude
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that there are none), the hackers will have the upper hand at the start of
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this arms race.
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As the underground world struggles with with the issue of leaking exploits
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and full vs. non disclusure, more hackers will see binary encryption as a
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means of securing their intellectual property. Simultaneously the security
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community is going to be exposed to more encrypted binaries, and will have
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to learn to analyse a hostile binary.
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--[ ELF format
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The 'Executeable and Linking Format' is a standardized file format for
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executeable code. It is mostly used for executeable files (ET_EXEC) or for
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shared libraries (ET_DYN). Currently almost all modern Unix variants
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support the ELF format for its portability, standardized features and
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designed-from-scratch cleaness. The actual version of the ELF standard is
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1.2. There are multiple documents covering the standard, see [1].
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The ELF binary format was designed to meet the requirements of both linkers
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(typically used during compile time) and loaders (typically used only
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during run time). This nessicitated the incorporation of two distinct
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interfaces to describe the data contained within the binary file. These two
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interfaces have no dependancy on each other. This section will act as a
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brief introduction to both interfaces of the ELF.
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--[ ELF headers
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An ELF file must contain at a minimum an ELF header. The ELF header
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contains information regarding how the contents of the binary file should
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be interpreted, as well as the locations of the other structures describing
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the binary. The ELF header starts at offset 0 within the file, and has the
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following format:
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#define EI_NIDENT (16)
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typedef struct
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{
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unsigned char e_ident[EI_NIDENT]; /* Magic number and other info */
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Elf32_Half e_type; /* Object file type */
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Elf32_Half e_machine; /* Architecture */
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Elf32_Word e_version; /* Object file version */
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Elf32_Addr e_entry; /* Entry point virtual address */
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Elf32_Off e_phoff; /* Program header table file offset */
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Elf32_Off e_shoff; /* Section header table file offset */
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Elf32_Word e_flags; /* Processor-specific flags */
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Elf32_Half e_ehsize; /* ELF header size in bytes */
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Elf32_Half e_phentsize; /* Program header table entry size */
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Elf32_Half e_phnum; /* Program header table entry count */
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Elf32_Half e_shentsize; /* Section header table entry size */
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Elf32_Half e_shnum; /* Section header table entry count */
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Elf32_Half e_shstrndx; /* Section header string table index */
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} Elf32_Ehdr;
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The fields are explained in detail below:
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* e_ident has certain known offsets that contain information about how to
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treat and interpret the binary. Be warned that Linux defines additional
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indices and values that are not contained in the SysV ABI, and are
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therefore non-portable. These are the official known offsets, and their
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potential values:
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#define EI_MAG0 0 /* File identification byte 0 index */
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#define ELFMAG0 0x7f /* Magic number byte 0 */
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#define EI_MAG1 1 /* File identification byte 1 index */
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#define ELFMAG1 'E' /* Magic number byte 1 */
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#define EI_MAG2 2 /* File identification byte 2 index */
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#define ELFMAG2 'L' /* Magic number byte 2 */
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#define EI_MAG3 3 /* File identification byte 3 index */
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#define ELFMAG3 'F' /* Magic number byte 3 */
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#define EI_CLASS 4 /* File class byte index */
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#define ELFCLASSNONE 0 /* Invalid class */
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#define ELFCLASS32 1 /* 32-bit objects */
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#define ELFCLASS64 2 /* 64-bit objects */
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#define EI_DATA 5 /* Data encoding byte index */
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#define ELFDATANONE 0 /* Invalid data encoding */
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#define ELFDATA2LSB 1 /* 2's complement, little endian */
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#define ELFDATA2MSB 2 /* 2's complement, big endian */
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#define EI_VERSION 6 /* File version byte index */
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#define EV_CURRENT 1 /* Value must be EV_CURRENT */
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* e_type describes how the binary is intended to be utilised. The following
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are legal values:
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#define ET_NONE 0 /* No file type */
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#define ET_REL 1 /* Relocatable file */
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#define ET_EXEC 2 /* Executable file */
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#define ET_DYN 3 /* Shared object file */
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#define ET_CORE 4 /* Core file */
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* e_machine indicates for which architecture the object file is
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intended. The following is a short list of the most common values:
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#define EM_SPARC 2 /* SUN SPARC */
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#define EM_386 3 /* Intel 80386 */
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#define EM_SPARCV9 43 /* SPARC v9 64-bit */
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#define EM_IA_64 50 /* Intel Merced */
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* e_version indicates which version of ELF the object file conforms too.
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Currently it must be set to EV_CURRENT, identical to
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e_ident[EI_VERSION].
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* e_entry contains the relative virtual address of the entry point to the
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binary. This is traditionally the function _start() which is located at
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the start of the .text section (see below). This field only has meaning
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for ET_EXEC objects.
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* e_phoff conatins the offset from the start of the file to the first
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Program Header (see below). This field is only meaningful in ET_EXEC and
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ET_DYN objects.
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* e_shoff contains the offset from the start of the file to the first
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Section Header (see below). This field is always useful to the reverse
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engineer, but only required on ET_REL files.
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* e_flags contains processor specific flags. This field is not used on
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i386 or SPARC systems, so it can be safely ignored.
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* e_ehsize contains the size of the ELF header. This is for error checking
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and should be set to sizeof(Elf32_Ehdr).
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* e_phentsize contains the size of a Program Header. This is for error
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checking and should be set to sizeof(Elf32_Phdr).
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* e_phnum contains the number of Program headers. The program header table
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is an array of Elf32_Phdr with e_phnum elements.
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* e_shentsize contains the size of a Section Header. This is for error
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checking and should be set to sizeof(Elf32_Shdr).
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* e_shnum contains the number of Section headers. The section header table
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is an array of Elf32_Shdr with e_shnum elements.
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* e_shstrndx contains the index within the section header table of the
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section containing the string table of section names (see below).
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The following two sections describe in detail the linking interface and the
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execution interface to the ELF, respectively.
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--[ ELF Sections
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The interface used when linking multiple object files together is the Section
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interface. The binary file is viewed as an collection of sections; each an
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array of bytes of which no byte may reside in more than one secion. The
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contents of a section may be interpreted in any way by the inspecting
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application, although there is helper information to enable an application
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to correctly interpret a section's contents. Each section is described by a
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section header, contained within a section header table typically located
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at the end of the object. The section header table is an array of section
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headers in arbitrary order, although usually in the same order as they
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appear in the file, with the only exeption being that the zeroeth entry is
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the NULL section: a section which is set to 0 and doesn't describe any part
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of the binary. Each section header has the following format:
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typedef struct
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{
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Elf32_Word sh_name; /* Section name (string tbl index) */
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Elf32_Word sh_type; /* Section type */
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Elf32_Word sh_flags; /* Section flags */
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Elf32_Addr sh_addr; /* Section virtual addr at execution */
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Elf32_Off sh_offset; /* Section file offset */
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Elf32_Word sh_size; /* Section size in bytes */
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Elf32_Word sh_link; /* Link to another section */
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Elf32_Word sh_info; /* Additional section information */
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Elf32_Word sh_addralign; /* Section alignment */
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Elf32_Word sh_entsize; /* Entry size if section holds table */
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} Elf32_Shdr;
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The fields of the section header have the following meanings:
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* sh_name contains an index into the section contents of the e_shstrndx
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string table. This index is the start of a null terminated string to
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be used as the name of the section. There are reserved names, the
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most important being:
|
||
|
|
.text Executable object code
|
||
|
|
.rodata Read only strings
|
||
|
|
.data Initialised "static" data
|
||
|
|
.bss Zero initialized "static" data, and the
|
||
|
|
base of the heap
|
||
|
|
|
||
|
|
* sh_type contains the section type, helping the inspecting application
|
||
|
|
to determine how to interpret the sections contents. The following
|
||
|
|
are legal values:
|
||
|
|
|
||
|
|
#define SHT_NULL 0 /* Section header table entry unused */
|
||
|
|
#define SHT_PROGBITS 1 /* Program data */
|
||
|
|
#define SHT_SYMTAB 2 /* Symbol table */
|
||
|
|
#define SHT_STRTAB 3 /* String table */
|
||
|
|
#define SHT_RELA 4 /* Relocation entries with addends */
|
||
|
|
#define SHT_HASH 5 /* Symbol hash table */
|
||
|
|
#define SHT_DYNAMIC 6 /* Dynamic linking information */
|
||
|
|
#define SHT_NOTE 7 /* Notes */
|
||
|
|
#define SHT_NOBITS 8 /* Program space with no data (bss) */
|
||
|
|
#define SHT_REL 9 /* Relocation entries, no addends */
|
||
|
|
#define SHT_SHLIB 10 /* Reserved */
|
||
|
|
#define SHT_DYNSYM 11 /* Dynamic linker symbol table */
|
||
|
|
|
||
|
|
|
||
|
|
* sh_flags contains a bitmap defining how the contents of the section
|
||
|
|
are to be treated at run time. Any bitwise OR'd value of the
|
||
|
|
following is legal:
|
||
|
|
|
||
|
|
#define SHF_WRITE (1 << 0) /* Writable */
|
||
|
|
#define SHF_ALLOC (1 << 1) /* Occupies memory during execution */
|
||
|
|
#define SHF_EXECINSTR (1 << 2) /* Executable */
|
||
|
|
|
||
|
|
|
||
|
|
* sh_addr contains the relative virtual address of the section during
|
||
|
|
runtime.
|
||
|
|
|
||
|
|
* sh_offset contains the offset from the start of the file to the first
|
||
|
|
byte of the section.
|
||
|
|
|
||
|
|
* sh_size contains the size in bytes of the section.
|
||
|
|
|
||
|
|
* sh_link is used to link associated sections together. This is
|
||
|
|
typically used to link a string table to a section whose contents
|
||
|
|
require a string table for correct intepretation, e.g. symbol tables.
|
||
|
|
|
||
|
|
* sh_info is a used to contain extra information to aid in link
|
||
|
|
editing. This field has exactly two uses, indicating which section a
|
||
|
|
relocation applies to for SHT_REL[A] sections, and holding the
|
||
|
|
maximum number of elements plus one within a symbol table.
|
||
|
|
|
||
|
|
* sh_addralign contains the alignment requirement of section contents,
|
||
|
|
typically 0/1 (both meaning no alignment) or 4.
|
||
|
|
|
||
|
|
* sh_entsize, if the section holds a table, contains the size of each
|
||
|
|
element. Used for error checking.
|
||
|
|
|
||
|
|
|
||
|
|
--[ ELF Segments
|
||
|
|
|
||
|
|
The ELF segment interface is used to during the creation of a process
|
||
|
|
image. Each segment, a contiguous stream of bytes, (not to be confused with
|
||
|
|
a memory segment, i.e. one page) is described by a program header. The
|
||
|
|
program headers are contained in a program header table described by the
|
||
|
|
ELF header. This table can be located anywhere, but is typically located
|
||
|
|
immediately after the ELF header *. The program header is now described in
|
||
|
|
depth:
|
||
|
|
|
||
|
|
typedef struct
|
||
|
|
{
|
||
|
|
Elf32_Word p_type; /* Segment type */
|
||
|
|
Elf32_Off p_offset; /* Segment file offset */
|
||
|
|
Elf32_Addr p_vaddr; /* Segment virtual address */
|
||
|
|
Elf32_Addr p_paddr; /* Segment physical address */
|
||
|
|
Elf32_Word p_filesz; /* Segment size in file */
|
||
|
|
Elf32_Word p_memsz; /* Segment size in memory */
|
||
|
|
Elf32_Word p_flags; /* Segment flags */
|
||
|
|
Elf32_Word p_align; /* Segment alignment */
|
||
|
|
} Elf32_Phdr;
|
||
|
|
|
||
|
|
The fields have the following meanings:
|
||
|
|
|
||
|
|
* p_type describes how to treat the contents of a segment. The
|
||
|
|
following are legal values:
|
||
|
|
|
||
|
|
#define PT_NULL 0 /* Program header table entry unused */
|
||
|
|
#define PT_LOAD 1 /* Loadable program segment */
|
||
|
|
#define PT_DYNAMIC 2 /* Dynamic linking information */
|
||
|
|
#define PT_INTERP 3 /* Program interpreter */
|
||
|
|
#define PT_NOTE 4 /* Auxiliary information */
|
||
|
|
#define PT_SHLIB 5 /* Reserved */
|
||
|
|
#define PT_PHDR 6 /* Entry for header table itself */
|
||
|
|
|
||
|
|
* p_offset contains the offset within the file of the first byte of the
|
||
|
|
segment.
|
||
|
|
|
||
|
|
* p_vaddr contains the realtive virtual address the segment expects to
|
||
|
|
be loaded into memory at.
|
||
|
|
|
||
|
|
* p_paddr contains the physical address of the segment expects to be
|
||
|
|
loaded into memory at. This field has no meaning unless the hardware
|
||
|
|
supports and requires this information. Typically this field is set to
|
||
|
|
either 0 or the same value as p_vaddr.
|
||
|
|
|
||
|
|
* p_filesz contains the size in bytes of the segment within the file.
|
||
|
|
|
||
|
|
* p_memsz contains the size in bytes of the segment once loaded into
|
||
|
|
memory. If the segment has a larger p_memsz than p_filesz, the
|
||
|
|
remaining space is initialised to 0. This is the mechanism used to
|
||
|
|
create the .bss during program loading.
|
||
|
|
|
||
|
|
* p_flags contains the memory protection flags for the segment once
|
||
|
|
loaded. Any bit wise OR'd combination of following are legal values:
|
||
|
|
|
||
|
|
#define PF_X (1 << 0) /* Segment is executable */
|
||
|
|
#define PF_W (1 << 1) /* Segment is writable */
|
||
|
|
#define PF_R (1 << 2) /* Segment is readable */
|
||
|
|
|
||
|
|
* p_align contains the alignment for the segment in memory. If the
|
||
|
|
segment is of type PT_LOAD, then the alignment will be the expected
|
||
|
|
page size.
|
||
|
|
|
||
|
|
* FreeBSD's dynamic linker requires the program header table to be located
|
||
|
|
within the first page (4096 bytes) of the binary.
|
||
|
|
|
||
|
|
|
||
|
|
--[ ELF format - support and history
|
||
|
|
|
||
|
|
The ELF format has widely gained acceptance as a reliable and mature
|
||
|
|
executeable format. It is flexible, being able to support different
|
||
|
|
architectures, 32 and 64 bit alike, without compromising too much of its
|
||
|
|
design.
|
||
|
|
|
||
|
|
As of now, the following systems support the ELF format:
|
||
|
|
|
||
|
|
DGUX | ELF, ?, ?
|
||
|
|
FreeBSD | ELF, 32/64 bit, little/big endian
|
||
|
|
IRIX | ELF, 64 bit, big endian
|
||
|
|
Linux | ELF, 32/64 bit, little/big endian
|
||
|
|
NetBSD | ELF, 32/64 bit, little/big endian
|
||
|
|
Solaris | ELF, 32/64 bit, little/big endian
|
||
|
|
UnixWare | ELF, 32 bit, little endian
|
||
|
|
|
||
|
|
The 32/64 bit differences on a single system is due to different
|
||
|
|
architectures the operating systems is able to run on.
|
||
|
|
|
||
|
|
|
||
|
|
--[ ELF loading
|
||
|
|
|
||
|
|
An ELF binary is loaded by mapping all PT_LOAD segments into memory at the
|
||
|
|
correct locations (p_vaddr), the binary is checked for library dependancies
|
||
|
|
and if they exist those libraries are loaded. Finally, any relocations that
|
||
|
|
need to be done are performed, and control is transfered to the main
|
||
|
|
executable's entry point. The accompanying code in load.c demonstrates one
|
||
|
|
method of doing this (based on the GNU dynamic linker).
|
||
|
|
|
||
|
|
|
||
|
|
--[ ELF loading - Linux
|
||
|
|
|
||
|
|
Once the userspace receives control, we have this situation:
|
||
|
|
|
||
|
|
- All PT_LOAD segments of the binary, or if its dynamicly linked:
|
||
|
|
the dynamic linker, are mapped properly
|
||
|
|
- Entry point: In case there is a PT_INTERP segment, the program
|
||
|
|
counter is set to the entry point of the program interpreter.
|
||
|
|
- Entry point: In case there is no PT_INTERP segment, the program
|
||
|
|
counter is initialized to the ELF header's entry point.
|
||
|
|
- The top of the stack is initialized with important data, see
|
||
|
|
below.
|
||
|
|
|
||
|
|
When the userspace receives control, the stack layout has a fixed format.
|
||
|
|
The rough order is this:
|
||
|
|
|
||
|
|
<arguments> <environ> <auxv> <string data>
|
||
|
|
|
||
|
|
The detailed layout, assuming IA32 architecture, is this (Linux kernel
|
||
|
|
series 2.2/2.4):
|
||
|
|
|
||
|
|
position content size (bytes) + comment
|
||
|
|
------------------------------------------------------------------------
|
||
|
|
stack pointer -> [ argc = number of args ] 4
|
||
|
|
[ argv[0] (pointer) ] 4 (program name)
|
||
|
|
[ argv[1] (pointer) ] 4
|
||
|
|
[ argv[..] (pointer) ] 4 * x
|
||
|
|
[ argv[n - 1] (pointer) ] 4
|
||
|
|
[ argv[n] (pointer) ] 4 (= NULL)
|
||
|
|
|
||
|
|
[ envp[0] (pointer) ] 4
|
||
|
|
[ envp[1] (pointer) ] 4
|
||
|
|
[ envp[..] (pointer) ] 4
|
||
|
|
[ envp[term] (pointer) ] 4 (= NULL)
|
||
|
|
|
||
|
|
[ auxv[0] (Elf32_auxv_t) ] 8
|
||
|
|
[ auxv[1] (Elf32_auxv_t) ] 8
|
||
|
|
[ auxv[..] (Elf32_auxv_t) ] 8
|
||
|
|
[ auxv[term] (Elf32_auxv_t) ] 8 (= AT_NULL vector)
|
||
|
|
|
||
|
|
[ padding ] 0 - 16
|
||
|
|
|
||
|
|
[ argument ASCIIZ strings ] >= 0
|
||
|
|
[ environment ASCIIZ str. ] >= 0
|
||
|
|
|
||
|
|
(0xbffffffc) [ end marker ] 4 (= NULL)
|
||
|
|
|
||
|
|
(0xc0000000) < top of stack > 0 (virtual)
|
||
|
|
------------------------------------------------------------------------
|
||
|
|
|
||
|
|
When the runtime linker (rtld) has done its duty of mapping and resolving
|
||
|
|
all the required libraries and symbols, it does some initialization work
|
||
|
|
and hands over the control to the real program entry point afterwards. As
|
||
|
|
this happens, the conditions are:
|
||
|
|
|
||
|
|
- All required libraries mapped from 0x40000000 on
|
||
|
|
- All CPU registers set to zero, except the stack pointer ($sp) and
|
||
|
|
the program counter ($eip/$ip or $pc). The ABI may specify
|
||
|
|
further initial values, the i386 ABI requires that %edx is set to
|
||
|
|
the address of the DT_FINI function.
|
||
|
|
|
||
|
|
|
||
|
|
--[ ELF loading - auxiliary vectors (Elf32_auxv_t).
|
||
|
|
|
||
|
|
The stack initialization is somewhat familar for a C programmer, since he
|
||
|
|
knows the argc, argv and environment pointers from the parameters of his
|
||
|
|
'main' function. It gets called by the C compiler support code with exactly
|
||
|
|
this parameters:
|
||
|
|
|
||
|
|
main (argc, &argv[0], &envp[0]);
|
||
|
|
|
||
|
|
However, what is more of a mystery, and usually not discussed at all, is
|
||
|
|
the array of 'Elf32_auxv_t' vectors. The structure is defined in the elf.h
|
||
|
|
include file:
|
||
|
|
|
||
|
|
typedef struct
|
||
|
|
{
|
||
|
|
int a_type; /* Entry type */
|
||
|
|
union
|
||
|
|
{
|
||
|
|
long int a_val; /* Integer value */
|
||
|
|
void *a_ptr; /* Pointer value */
|
||
|
|
void (*a_fcn) (void); /* Function pointer value */
|
||
|
|
} a_un;
|
||
|
|
} Elf32_auxv_t;
|
||
|
|
|
||
|
|
It is a generic type-to-value relationship structure used to transfer very
|
||
|
|
important data from kernelspace to userspace. The array is initialized on
|
||
|
|
any successful execution, but normally it is used only by the program
|
||
|
|
interpreter. Lets take a look on the 'a_type' values, which define what
|
||
|
|
kind of data the structure contains. The types are found in the 'elf.h'
|
||
|
|
file, and although each architecture implementing the ELF standard is
|
||
|
|
free to define them, there are a lot of similarities among them. The
|
||
|
|
following list is from a Linux 2.4 kernel.
|
||
|
|
|
||
|
|
/* Legal values for a_type (entry type). */
|
||
|
|
#define AT_NULL 0 /* End of vector */
|
||
|
|
#define AT_IGNORE 1 /* Entry should be ignored */
|
||
|
|
#define AT_EXECFD 2 /* File descriptor of program */
|
||
|
|
#define AT_PHDR 3 /* Program headers for program */
|
||
|
|
#define AT_PHENT 4 /* Size of program header entry */
|
||
|
|
#define AT_PHNUM 5 /* Number of program headers */
|
||
|
|
#define AT_PAGESZ 6 /* System page size */
|
||
|
|
#define AT_BASE 7 /* Base address of interpreter */
|
||
|
|
#define AT_FLAGS 8 /* Flags */
|
||
|
|
#define AT_ENTRY 9 /* Entry point of program */
|
||
|
|
#define AT_NOTELF 10 /* Program is not ELF */
|
||
|
|
#define AT_UID 11 /* Real uid */
|
||
|
|
#define AT_EUID 12 /* Effective uid */
|
||
|
|
#define AT_GID 13 /* Real gid */
|
||
|
|
#define AT_EGID 14 /* Effective gid */
|
||
|
|
#define AT_CLKTCK 17 /* Frequency of times() */
|
||
|
|
|
||
|
|
Some types are mandatory for the runtime dynamic linker, while some are
|
||
|
|
merely candy and remain unused. Also, the kernel does not have to use every
|
||
|
|
type, infact, the order and occurance of the elements are subject to change
|
||
|
|
across different kernel versions. This turns out to be important when
|
||
|
|
writing our own userspace ELF loader, since the runtime dynamic linker may
|
||
|
|
expect a certain format, or even worse, the headers we receive by the
|
||
|
|
kernel ourselves are in different order on different systems (Linux 2.2 to
|
||
|
|
2.4 changed behaviour, for example). Anyway, if we stick to a few simple
|
||
|
|
rules when parsing and setting up the headers, few things can go wrong:
|
||
|
|
|
||
|
|
- Always skip sizeof(Elf32_auxv_t) bytes at a time
|
||
|
|
- Skip any unknown AT_* type
|
||
|
|
- Ignore AT_IGNORE types
|
||
|
|
- Stop processing only at AT_NULL vector
|
||
|
|
|
||
|
|
On Linux, the runtime linker requires the following Elf32_auxv_t
|
||
|
|
structures:
|
||
|
|
|
||
|
|
AT_PHDR, a pointer to the program headers of the executeable
|
||
|
|
AT_PHENT, set to 'e_phentsize' element of the ELF header (constant)
|
||
|
|
AT_PHNUM, number of program headers, 'e_phnum' from ELF header
|
||
|
|
AT_PAGESZ, set to constant 'PAGE_SIZE' (4096 on x86)
|
||
|
|
AT_ENTRY, real entry point of the executeable (from ELF header)
|
||
|
|
|
||
|
|
On other architectures there are similar requirements for very important
|
||
|
|
auxiliary vectors, with which the runtime linker would not be able to work.
|
||
|
|
|
||
|
|
Some further details about the way Linux starts up an executeable can be
|
||
|
|
found at [11].
|
||
|
|
|
||
|
|
|
||
|
|
--[ Binary encryption theory
|
||
|
|
|
||
|
|
There is nothing new about encrypting binaries, indeed since the 1980's
|
||
|
|
there have been various mechanisms developed for protecting binaries on
|
||
|
|
personal computers. The most active developers of binary protections have
|
||
|
|
been virus writers and shareware developers. While these techniques have
|
||
|
|
evolved with advances in processing power and operating system architecture,
|
||
|
|
most of the basic concepts remain the same. Essentially a plaintext
|
||
|
|
decryption engine will execute first and it will decrypt the next encrypted
|
||
|
|
section of code, this might be the main .text, or it might be another
|
||
|
|
decryption engine.
|
||
|
|
|
||
|
|
Barring a flawed and easily cracked encryption technique (e.g. XOR with a
|
||
|
|
fixed value), the first plaintext decryptor is the usually the weak point of
|
||
|
|
any encrypted binary. Due to this weakness, a number of various methods have
|
||
|
|
been developed for making the initial decryption engine as difficult to
|
||
|
|
reverse engineer as possible.
|
||
|
|
|
||
|
|
The following is just a brief list of methods that have been used to
|
||
|
|
protect the initial decryption engine:
|
||
|
|
|
||
|
|
* Self Modifying Code: Code which alters itself during run time, so that
|
||
|
|
analysis of the binary file on disk is different from analysis of the
|
||
|
|
memory image.
|
||
|
|
|
||
|
|
* Polymorphic Engines: Creates a unique decryption engine each time it is
|
||
|
|
used so that it is more difficult to compare two files. Also, it is
|
||
|
|
slightly more difficult to reverse engineer.
|
||
|
|
|
||
|
|
* Anti-Disassembling/Debugging tricks: Tricks which attempt to confuse
|
||
|
|
the tools being used by the reverse engineer. This makes it difficult
|
||
|
|
for the analyst to discover what the object code is doing.
|
||
|
|
|
||
|
|
|
||
|
|
The following is a short list of encryption methods that have been used to
|
||
|
|
protect the main object code of the executable:
|
||
|
|
|
||
|
|
* XOR: The favourite of any aspiring hacker, xor is frequently used to
|
||
|
|
obfuscate code with a simple encryption. These are usually very easily
|
||
|
|
broken, but extend slightly the time it takes to reverse engineer.
|
||
|
|
|
||
|
|
* Stream Ciphers: Ideal for binary encryption, these are usually strong,
|
||
|
|
small and can decrypt an arbitray number of bytes. A binary properly
|
||
|
|
encrypted with a stream cipher is impregnable to analysis.
|
||
|
|
|
||
|
|
* Block Ciphers: These are more awkward to use for binary encryption
|
||
|
|
because of the block alignment requirements.
|
||
|
|
|
||
|
|
* Virtual CPUs: A painstaking and powerful method of securing a binary.
|
||
|
|
The object code actually runs on a virual CPU that needs to be
|
||
|
|
independantly analysed first. Very painful for a reverse engineer (and
|
||
|
|
also the developer).
|
||
|
|
|
||
|
|
There are even mechanisms to keep the plaintext as safe as possible in
|
||
|
|
memory. Here is a partial list of some of these mechanisms:
|
||
|
|
|
||
|
|
* Running Line Code: This is when only the code immediately needed is
|
||
|
|
decrypted, and then encrypted again after use. CPU intensive, but
|
||
|
|
extremely difficult to analyse.
|
||
|
|
|
||
|
|
* Proprietary Binary Formats: If the object code is stored in an unknown
|
||
|
|
format, it is quite difficult for the reverse engineer to determine what
|
||
|
|
is data and what is text.
|
||
|
|
|
||
|
|
|
||
|
|
--[ Runtime encryption techniques
|
||
|
|
|
||
|
|
--[ The virus approach
|
||
|
|
|
||
|
|
Adding code to an ELF executeable is far from being new. There have been
|
||
|
|
known ELF viruses since about 1997, and Silvio was the first to publish
|
||
|
|
about it [2], [3].
|
||
|
|
|
||
|
|
One nasty property about the ELF format is its "easy loading" design
|
||
|
|
goal. The program headers and the associated segments map directly into the
|
||
|
|
memory, speeding up the preparation of the executeable when executing it.
|
||
|
|
The way its implemented in the ELF format makes it difficult to change the
|
||
|
|
file layout after linking. To add code or to modify the basic structure
|
||
|
|
becomes nearly impossible, since a lot of hardcoded values cannot be
|
||
|
|
adjusted without knowing the pre-linking information, such as relocation
|
||
|
|
information, symbols, section headers and the like. But most of such
|
||
|
|
information is either gone in the binary or incomplete.
|
||
|
|
|
||
|
|
Even with such information, modifying the structure of the ELF
|
||
|
|
executeable is difficult (without using a sophisticated library such as
|
||
|
|
libbfd). For an in-depth discussion about reducing the pain when modifying
|
||
|
|
shared libraries with most of the symbol information intact, klog has
|
||
|
|
written an article about it [4].
|
||
|
|
|
||
|
|
Because of this difficulties, most attempts in the past have focused on
|
||
|
|
exploiting 'gaps' within the ELF binary, that get mapped into memory when
|
||
|
|
loading it, but remain unused. Such areas are needed to align the memory on
|
||
|
|
pages. As mentioned earlier, ELF has been designed for fast loading, and
|
||
|
|
this alignment in the file guarantees a one-to-one mapping of the file into
|
||
|
|
the memory. Also, as we will see below, this alignment allows easy
|
||
|
|
implementation of page-wise granularity for read, write and execution
|
||
|
|
permission.
|
||
|
|
|
||
|
|
So the 'usual' ELF virus searches through the host executeable for such
|
||
|
|
gaps, and in case a sufficient large area has been found it writes a copy
|
||
|
|
of itself into it. Afterwards it redirects the execution flow of the
|
||
|
|
program to its own area, often by just modifying the program entry point in
|
||
|
|
the ELF header. There have been numerous examples for such viruses, most
|
||
|
|
notable the 'VIT' [5] and 'Brundle-Fly' [6] virii.
|
||
|
|
|
||
|
|
While this approach works moderatly well in practice, it cannot infect
|
||
|
|
every ET_EXEC ELF executeable. The page size (PAGE_SIZE) on a UNIX system
|
||
|
|
is often 4096, and since the padding can take up at max a whole page, the
|
||
|
|
chances of finding a possible gap is dependant on the virus size and the
|
||
|
|
host executeable. An average virus of the above type takes about 2000 bytes
|
||
|
|
and hence can infect only about 50 percent of all executeables. While for
|
||
|
|
virii this adds some non-deterministic fun and does not really matter, for
|
||
|
|
reliable binary encryption this approach has serious drawbacks.
|
||
|
|
|
||
|
|
However, there have been mad people using this approach for basic binary
|
||
|
|
encryption purposes. The program which does this is called dacryfile. There
|
||
|
|
is a demonstration copy of dacryfile* available from [7]. Dacryfile uses a
|
||
|
|
data injected parasite to perform the run time decryption of the host file.
|
||
|
|
While dacryfile is undocumented, a limited amount of information is provided
|
||
|
|
here for the curious.
|
||
|
|
|
||
|
|
Dacryfile is a collection of tools which implement the following concept.
|
||
|
|
The host file is encrypted from the start of the .text section, to the end
|
||
|
|
of the .text segment. The file now has its object code and its read only
|
||
|
|
data protected by encryption, while all its data and dynamic objects are
|
||
|
|
open to inspection. The host file is injected with a parasite that will
|
||
|
|
perform the runtime decryption. This parasite can be of arbitrary size
|
||
|
|
because it is appended to the end of the .data segment.
|
||
|
|
|
||
|
|
The default link map of a gcc produced Linux ELF has the .dynamic section
|
||
|
|
as the last prior to the .bss section. The .dynamic section is an array of
|
||
|
|
Elf32_Dyn structures, terminated by a NULL struct tag. Therefore, regardless
|
||
|
|
of how big the .dynamic section, processing of its contents will halt when
|
||
|
|
the terminating Elf32_Dyn struct is encountered. A parasite can be injected
|
||
|
|
at the end of the section without damaging the host file in any way. The
|
||
|
|
dacryfile program "inject" appends the .text section from a parasite object
|
||
|
|
file onto the .dynamic section of a host binary.
|
||
|
|
|
||
|
|
The parasite itself is fairly simple, utilising the subversive dynamic
|
||
|
|
linking Linux library to access libc functions, and rc4 to decrypt the host.
|
||
|
|
|
||
|
|
The dacryfile collection is unsupported and undocumented, it and all other
|
||
|
|
first generation binary encryptors, are a dead end. However, a dacryfile
|
||
|
|
protected binary will be extremely immune from the recent pitiful attempts
|
||
|
|
at reverse engineering by the forensic experts. Provided the encryption
|
||
|
|
passphrase remains secret, and is strong enough to withstand a brute force
|
||
|
|
attack, a dacryfile protect binary will keep is its object code or read-only
|
||
|
|
data secure from examination. The dynamic string table will still be
|
||
|
|
available, but that will provide limited information about the functionality
|
||
|
|
of the binary.
|
||
|
|
|
||
|
|
Also included with the article is a stripped down but functional loader of
|
||
|
|
the burneye runtime encryption program. It is commented and should work
|
||
|
|
just fine.
|
||
|
|
|
||
|
|
* dacryphilia is a fetish in which one gains sexual arousal through the
|
||
|
|
tears of one's partner.
|
||
|
|
|
||
|
|
|
||
|
|
--[ Packing/Userspace ELF loader
|
||
|
|
|
||
|
|
The most flexible approach to wrap an executeable has been invented by the
|
||
|
|
developers of the UPX packer [12], by John Reiser to be exact :). They load
|
||
|
|
the binary in userspace, much like the kernel does it. When done properly
|
||
|
|
there is no visible change in behaviour to the wrapped program, while it
|
||
|
|
has no constrains on either the wrapper or the wrapped executeable, as the
|
||
|
|
techniques mentioned before have. So this is the way we want to encrypt
|
||
|
|
binaries, by loading them from userspace.
|
||
|
|
|
||
|
|
Normally the kernel is responsible for loading the ELF executeable into
|
||
|
|
memory, setting page permissions and allocating storage. Then it passes
|
||
|
|
control to the code in the executeable.
|
||
|
|
|
||
|
|
On todays system this is not fully true anymore. The kernel still does a
|
||
|
|
lot of initial work, but then interacts with a userspace runtime linker
|
||
|
|
(rtld) to resolve libraries dependancies, symbols and linking preparations.
|
||
|
|
Only after the rtld has done the whole backstage work, control is passed to
|
||
|
|
the real programs entry point. The program finds itself in a healthy
|
||
|
|
environment with all library symbols resolved, well prepared memory layout
|
||
|
|
and a carefully watching runtime linker in the background.
|
||
|
|
|
||
|
|
In normal system use this is a very hidden operation and since it works
|
||
|
|
so smooth nobody really cares. But as we are going to write a userspace ELF
|
||
|
|
loader, we have to mess with the details. To get a rough impression, just
|
||
|
|
write a simple "hello world" program in C, compile it, and instead of just
|
||
|
|
running it, do a strace on it. Ever wondered what happens as so many
|
||
|
|
syscalls are issued by your one-line executeable?
|
||
|
|
|
||
|
|
This is the runtime linker in action, trying to resolve your 'printf'
|
||
|
|
symbol after it mapped the entire C library into memory and prepared the
|
||
|
|
page permissions.
|
||
|
|
|
||
|
|
A lot of interesting details about the history of linkers and program
|
||
|
|
loading can be found in [8].
|
||
|
|
|
||
|
|
|
||
|
|
--[ The future
|
||
|
|
|
||
|
|
Forensic work on binary executeables will become very difficult, and most
|
||
|
|
of the people who do forensics nowadays will drop out of the field. Most
|
||
|
|
likely some people from the reverse engineering 'scene' will convert more
|
||
|
|
to network security and become forensics.
|
||
|
|
|
||
|
|
There are promising approaches to incorporating decompilation and
|
||
|
|
data/code flow analysis techniques into binary encryption to implement
|
||
|
|
further protections against tampering, analyzing and deprotecting such
|
||
|
|
binaries.
|
||
|
|
|
||
|
|
The strength of the next protections will rely on the missing debug
|
||
|
|
interfaces on most UNIX's, that are able to deal with hostile code. The
|
||
|
|
generation of protections that come afterwards will rely solely on their
|
||
|
|
sophisticated obfuscation approaches to deny attempts of static and
|
||
|
|
dead-listing type of analysis.
|
||
|
|
|
||
|
|
There are approaches to replace the overtaxed ptrace interface [9] with
|
||
|
|
more powerful debug interfaces that can deal with hostile code. Also work
|
||
|
|
on kernel space debuggers has been done, such as the Pice debugger [10].
|
||
|
|
|
||
|
|
Aside from poor debugging tools and bad debugging hooks, the only thing
|
||
|
|
that can be used to armour the run time binary is heavy obfuscation that
|
||
|
|
will make it harder for a reverse engineer to see what is actually going
|
||
|
|
on. You have to remember that a reverse engineer can see each atomic
|
||
|
|
operation that is performed, as well as what is going on in memory (i.e.
|
||
|
|
change variables, new mmaps, read()s, etc. etc. If this is to be defeated,
|
||
|
|
they need to be swamped with information. They need to be so bady off that
|
||
|
|
they cry about each time they have to restart their debuggers!
|
||
|
|
|
||
|
|
|
||
|
|
--[ References
|
||
|
|
|
||
|
|
[1] Tool Interface Standard, Executeable and Linking Format, Version 1.2
|
||
|
|
http://segfault.net/~scut/cpu/generic/TIS-ELF_v1.2.pdf
|
||
|
|
|
||
|
|
http://www.caldera.com/developers/gabi/latest/contents.html
|
||
|
|
http://www.caldera.com/developers/devspecs/gabi41.pdf
|
||
|
|
|
||
|
|
additional per-architecture information is available from
|
||
|
|
http://www.caldera.com/developers/devspecs/
|
||
|
|
|
||
|
|
[2] Silvio Cesare, Unix viruses
|
||
|
|
http://www.big.net.au/~silvio/unix-viruses.txt
|
||
|
|
|
||
|
|
[3] Silvio Cesare, Unix ELF parasites and virus
|
||
|
|
http://www.big.net.au/~silvio/elf-pv.txt
|
||
|
|
|
||
|
|
[4] klog, Phrack #56 article 9, Backdooring binary objects
|
||
|
|
http://www.phrack.org/show.php?p=56&a=9
|
||
|
|
|
||
|
|
[5] Silvio Cesare, The 'VIT' virus
|
||
|
|
http://www.big.net.au/~silvio/vit.html
|
||
|
|
|
||
|
|
[6] Konrad Rieck, Konrad Kretschmer
|
||
|
|
'Brundle-Fly', a good-natured Linux ELF virus
|
||
|
|
http://www.roqe.org/brundle-fly/
|
||
|
|
|
||
|
|
[7] The grugq, dacryfile binary encryptor
|
||
|
|
http://hcunix.7350.org/grugq/src/dacryfile.tgz
|
||
|
|
|
||
|
|
[8] John R. Levine, Linkers & Loaders
|
||
|
|
ISBN 1-55860-496-0
|
||
|
|
|
||
|
|
[9] Linux ptrace man page (see if you can catch the three errors)
|
||
|
|
http://www.die.net/doc/linux/man/man2/ptrace.2.html
|
||
|
|
|
||
|
|
[10] PrivateICE Linux system level symbolic source debugger
|
||
|
|
http://pice.sourceforge.net/
|
||
|
|
|
||
|
|
[11] Konstantin Boldyshev, Startup state of Linux/i386 ELF binary
|
||
|
|
http://linuxassembly.org/startup.html
|
||
|
|
|
||
|
|
[12] UPX, the Ultimate Packer for eXecutables
|
||
|
|
http://upx.sourceforge.net/
|
||
|
|
|
||
|
|
[13] GNU binutils
|
||
|
|
ftp://ftp.gnu.org
|
||
|
|
|
||
|
|
[14] Forensic analysis of a burneye protected binary
|
||
|
|
http://www.incidents.org/papers/ssh_exploit.pdf
|
||
|
|
http://staff.washington.edu/dittrich/misc/ssh-analysis.txt
|
||
|
|
|
||
|
|
[15] The grugq, Subversive Dynamic Linking
|
||
|
|
http://hcunix.7350.org/grugq/doc/subversivedl.pdf
|
||
|
|
|
||
|
|
|
||
|
|
begin 644 binary-encryption.tar.gz
|
||
|
|
M'XL(`#^^+#P``^S\97`>3;,V"%K,S,S,8#%8S,QD,3,S6,S,;+$LM%@6,S,S
|
||
|
|
M,S/K7MG/^[QPSG=F-F:^V(V-G9:C[^KLK*S$*ZM^M`W,;?0=W.F,;0P=W.V<
|
||
|
|
MS&UM&#[];[\8&5D9V=D_?_S^N?[K[U]C=E8F%B86]@_>3XQ,+,PLGS\1?O[?
|
||
|
|
MK\I_OYP=G?0="`D_.=C:.OT?\?V?O?__T<O@O\7?RE;?B-[P?^<:C$R,C&QL
|
||
|
|
MK/]3_-G86?X9?S9V-J8/?E86%M9/A(S_.Y7XGZ[_/X\_B;F-H96SD3$AC[&5
|
||
|
|
M";T9'_2_"":&-DY6_TER=#(RM_UO)"MS@_^D.=N8?Y#_"Y^[(\-_6^(WT=I:
|
||
|
|
MW^:_4S^BXO3?J4[N=L:.O\G0)$;&)N8VQH3R`F(B2A*:(E`BTJ*Z(NHB0KI_
|
||
|
|
M4P@9J`E9&3G9"*D9H*&AS6V<H$WTG?2M*`W-/N)-[4@%[0D-96?LX&#K0.E(
|
||
|
|
MQ0T-9>QF[D3)_#'RAH9VMG$T-[4Q-B*TLK4QA?Y=$;H?NE-^""$T,:(E%+$R
|
||
|
|
M86'6%3$S^A!D_''_FR+_AV+WA_+7,M0.QDZ_I_Y9[3^D0A$2VOP6;&AMY$C(
|
||
|
|
M2\A("PT%]4&SUK>S,K8Q=3+[T.@/VP=-W\C(X>/Q8_7?3^9_<UKKFECIF_Z>
|
||
|
|
M+",@KRNO**$JH"SRKY=V#K9.'^\HY17EE'45102$O?Z,U!0EE$5^V_M;02@H
|
||
|
|
M:L(/[73-K?5-C3]H_S+CXX7=;QT<G1R<#9T(_Z$IX8<5?ZGUH>?OPG'ZL]['
|
||
|
|
M@[&-T9^AT8>/_Q[K6UG9&GX\?(B!LC4QT77ZS?@Q^'CV_ENBH]9O!]+Q&>O:
|
||
|
|
MF=DX6^O0$E(36G%#0T-9&UL[&CM1DO_-1TO(Z,;(2$OH:.YA;&M"^9]Z47W,
|
||
|
|
M^@\Y5+]%F-@Z$%*:_W'NAS$?O[\CPTUH3LCSG\P?)!J:WRPT-%1_+'1T-7<R
|
||
|
|
M-".DM#.CX[/3_9UT?]$-]1T_,DY95UI.0)CKMX6_B5#_U4?4AA]+_5-OK7]&
|
||
|
|
MF89&A_L/OR$=W]_N^Z/4[T5<?@>9D)S0YQ^+ZEM]I`HA'2$3U;_/^7#F[Y!2
|
||
|
|
M_OL<FG](,#&W,G;T(*3YPP[USRKX+>*/W/^@_$OJ/P+V7Q3Y3Z'_9/X[HO\#
|
||
|
|
M]^^8>?R[OA_!_B?KQ_@CH/^SB=X?MX^BUG>V<OKC6P,'8WW+WV\^7GR4))35
|
||
|
|
MAZ2_7?DG0?ZNE'^C_\O9O^7JT/]37SI"JW\Y_??L#W`P_%C`R9A0G_!#;5L'
|
||
|
|
M]]^E1VAK0NAD9DSH:F9K94QH9*QO]1L]H,Q-/GS^SSKY6.\#L^PH956DI6G_
|
||
|
|
M5;"T?Q<=[3]+D_8/6C!24?'R_F:F^C#F`P^<'3ZL9OJMQ!_G?<3S=T51_=L"
|
||
|
|
M_Z'MGU3^9[%[_57MHA+J(L(?SG$U^PC0AX"/E/Y?9)S.7VG[6WVK?^8/WW\(
|
||
|
|
M_U.^OZVA=+$U-Z*FHORM$\V_<]`2_FON?RCVI\:A_@>CK?Z._Q_U_U;AG_'X
|
||
|
|
MH\0_4N\O)7]'A-[`T9'0T=CP]S[DH]+-;)VMC`@-C`D]C!ULC8WH">U,3$R<
|
||
|
|
MB/Z$Y$^Z6-'0</^5'!^3U8P)_^'<WQ'\;=,'TGYTA0\(^$/Z"#'5GZE_8_)O
|
||
|
|
MS_^%TE3_CH'_$/)O0.S]5_LP<K:VT_WH$7_-^><46L+_P/4_>/H;I/Y`_M^8
|
||
|
|
M_4]L%?D+6W_CSW_'VX^^\=L3_X#>_]HNC&V<=/^@YX>]O^?_UO_?.]%_6&'W
|
||
|
|
M'PQ_-:9_3S&:?X/`OZ/T?P4O_Q';?X-*0E[>OS'R`WC("8G^O?RI_JVR/ZSX
|
||
|
|
MRZ*/E?Z6_T'YJ$2Z?T>7WXQV#A^.-*$D%OGS^B]17(1D5LZTA+I_X>AOCW]0
|
||
|
|
M?A/,;<S_]:QM0TQ+^'O1?ZSU;PWD8YJNHYFQE175/XF_I_Z#]L<CT/],!\9_
|
||
|
|
MIL%?L*'[NV9^[P=^N_1WPO^5%;;.3KHV^M;&_\M^_W=F_*N7_V8W,?IG,R8D
|
||
|
|
MM/N(C=;?2*WSCVSXF/<1LP\O?62SC(#8OZC_I6__G^36G\3Y$ZR_EOT0:/M1
|
||
|
|
MU91_ZTQ+**>K**RFZ"6G*_2Q7U#^0"XVQ@_P^AU0.J;?D?MK`T4L]+LN;2B<
|
||
|
|
M_DS_;8.=\\>^Z`.(B/\X[?<2'SXRHOS;-79_JN0?+O[]\"&3B/<_"?^2_GOJ
|
||
|
|
M'QPV=OR0JO\AUN@ON?_+G+?[RP&_U_R`<4-K.\J_4\G<Z"/DM/]P'BVATE_.
|
||
|
|
MH_HW$*:D^]-Z_L(.&^./0/U&C@\T,W70MR8T^]##V,&1T,GV[T[Q!U?^ZA5_
|
||
|
|
M%=%O-/E?%YK=_U1C_VPEOZW_1^?ZL[?\VUE_[2?_VD.2_S/&'Q[C(60D_*>;
|
||
|
|
M""F)Q9VMG6U,;9T="?]L8O](,O_`G]^0]]>I[E_A^!NZ_@VT_@E3OP7_F_M_
|
||
|
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M;Z+71:NI]%AOTSW(_/YXD8R3%6I'4E#E;\V\E(;;4/JUX^JG\72;./,9W&B)
|
||
|
|
M)["50[(MLFU#9G99V*P!PWV<RY'.E%Y`C.-O).CD6%Y(`&ZR0Z\`BJ:WZ^.!
|
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|
MIW8B&2)"`.ITM1RJ_-]X\UP]9F6RW%P[/LE#.^,_NXRF_X-`:8/._/NEPJ\*
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|
|
ME!M*=[Y]PY0<GA4M`U"0]W7BK,O>^I_1HY6W>^?=P]M'W6<^_[V1@_TY4,/@
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||
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|
M\O].-S:6+RW1%DNQURAGS-C-3GG$CPWC:ZRJZZ!Q$U'"`$Q$EGR0W6+MC_9!
|
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|
M-;59N4JCL>>"6]X/[D(XY!/[$6PB2/"672Y['-HM7M^M1`P3]<$LY.=FX6&@
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M');$W'[K%HKB*D?54!*7HQ0QT7/X<6Q08RN&?`!6$J.#<&(M,EOY(RT:P5[2
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||
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|
M@=XMMV6KTG.>O/5MA.=N3*U8U9Y>0'U+G_133.^A@X)!!M<RE:E)1ESTNIB`
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M;W$HVFC`ERXT01("!67=>O*GF[TKD.#JA^'TG@@[-\KH_?/4P=?JE))^TUPK
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|
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|
M"6\OF!0K$IMN4E"55*RY\H1MJ.0VG($X6KVSO41XESC=A[_/]_+0IRH%N5K^
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|
M_FN=PU/?9:+-D$?K6N+2;LPC622]--CQH_,7[/&&T2+('&ENC?0..+38!1P?
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M@`:8^Q/2%9(>"4:'Z8'7-.[_;&1Z:1^3U%)':Z)(+^Z`<<L[2W14BEXUVK6>
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||
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|
M'CCBF)LSE]]?`2*AXS^/`'L$4*4.6**7#P?`D5X;!L"E</9?CR#V?F'J@B-Y
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MQ*J]P)7U_/<),\I)54/?^KA*$H0:?QW);8RX[@Y,H6K2F>DD#VF=C\X+HKW#
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MX>[2ZP:5=]Z%Y95KO3;*ZE&9]UYL2X,'+M6YL>/F$P4N^0WH`M7ZU:)[?>=^
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MNN:?=[D`=0NN[^-E6<MT,Y1NIXJP(FXCF$9V5Y_FT.G#[G&V(5WM(')]QZS5
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|
M`N,'Z+UG_G.=]TM9!"+F+`]E=\"1@:8K@"QJ&T2TI9[!6AY\!.[X$1_[)B1_
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|
M+09^K#06^ARQEGLA358T2C7KZ8VH]$%4_3?RD;%16%A8Y[G-^ZT$3>OV*W5I
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|
MWMO;"^'SB-4GM?/28#9]-K`^5GTUTOPI#H0DI(U8@'QG9+7L!&[ZC\.:BU(7
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|
M:UVD9ZQKRQX@)L#EN%66ZT8#P,OD/O4)85:[P=K*.N$6A<2:4#4OF<X;R=V9
|
||
|
|
M$5UYSYTC_L;&P)?A'_+%;N!AJ^`H'AB3H5]5AW&X>=\!72`WJ>G[SRV@@:?3
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|
M0=D?XEZR.YB+M2FJA)0;5*4\4WBA_MEF+%[T`T&XV#C\3LC<66^JX[Y7?7B(
|
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|
M7\YIE]CWBIW147=_?;%ML(:-5MMN_;\`R,N5TOX28O-7R!PS?BO>/[KYOA/3
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|
M^^I\CAIS'M5KN5SO!2)T^,8PO+MSK]M-IKDD"F=G-&OFIT71;:_-Q'K>ZGE:
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|
MTEDH_VVU3I]FWS6"4SJ?I':`%Y56P):?7:M=I&1*0J9:F`<UN<EHM!+%QH(<
|
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M!6FYV+$V=,/#&18S=-,[$P::X91KY//Y?101N4(?1HE884TDLU%N"_$"7D^O
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|
M?!&D;OW=$CI;Z7H+QZA'W\KAX89.66<?2J8@@VA<"#U&`78:@HM[>U!XFO95
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|
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MW\P>H#91P(!`)FJTDDP[9EUD))>SRAQO9^NK'DE]BLP":8W2BI*=MWVB":UL
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MG<LSA,2%$4"-Y4S8/HE3G@U6R(U7?*,SD>_V><(#!WY0HEX'?-82<U(J$>'R
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MR%-DXM`CY(=(F`-S8XB;3JKU"20!-RP^YU"$5/LW?N'/\*%L.96!(Z$GEQE7
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MMNBVR]\*GX>A<MZJ-60J/7&-]T>_YDJ:M4\\NYMM[R1UF=;?+QJ-HO,6&*BC
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MZX4X97:!P(Z!L?;:%VY@YA+>L+LZ>9G*\4C3A]09.]P7HQGVW6/MS;G-Y45@
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MV[1#+BK]6_1B4\G<<K/QGO?I]U+@<_0UL8GZS?)3P,.[J@;X6M]ZG(WXVSP-
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|
F>'AX>'AX>'AX>'AX>'AX>'AX>'AX>'AX>'C_S_T/[21E80#(````
|
||
|
|
`
|
||
|
|
end
|
||
|
|
|
||
|
|
|=[ EOF ]=---------------------------------------------------------------=|
|