Greetings everyone, and welcome to part two of the Binary Mangling series. In our last installment, we took a look at the basics of what an ELF binary is, how it’s laid out, and the bare minimum needed to execute some raw machine code. We also did a little bit of mangling, by hand optimizing our binary in a hex editor to put things where they aren’t supposed to go.
In this installment, we are going much, much deeper, to challenge the kernel with a clown car of barely valid bytes to test the limits of the ELF format itself.
The third part should be coming out at around the same time as this, with a practical example of binary golf, the art of executing a binary in as few moves as possible.
That Shrinking Feeling
Personally, I have wanted to figure out what the absolute smallest ELF64 binary I could manage to create was for a while now.
By normal means, using the GNU assembler and linker, you can create pretty small binaries that have the basic data structures needed to dictate how the executable is parsed by the OS.
In the previous write up, we showed the two necessary structures required to execute your code: The ELF header and the program header. For more info on these, please refer to part one.
In my initial investigation, I created a 120 byte ELF64 that included the exit syscall in part of the ELF header, meaning the binary was exactly the size of the ELF and Program Headers. After playing around a bit more, I discovered that you can actually end the ELF header early, at 0x3A instead of 0x40, meaning you could save a whole 6 bytes by moving the program header up into the ELF header.
I explored the possibility of overlaying the program and ELF headers, but due to the 8 byte addresses of ELF64, I couldn’t figure out a proper way to do it. I tried again months later and was almost there, but still no dice. After a bunch of messed up nasm files, and some botched hex editing sessions, @_veekun came through and found the proper alignment (big big shoutout).
Here is a breakdown of how we are going about this.
So the basic principles of overlaying these two header structures relies on some very precise pieces to be in place.
It’s probably best explained with this nasm file.
Let’s go through this line by line
Line 1 says BITS64, which tells nasm that this is 64 bit.
Line 3 tells NASM where the binary should be loaded into memory. Usually this is at 0x40000, but this specific address will be useful later on.
Line 8 is the first 4 bytes of the ELF Header that are required to identify the file as an ELF binary.
Line 9 contains the _start label, which is the entry point of our program. It’s located at offset 0x4 within the binary. From here until line 12 is our actual program. Note the 5 nops at the end, these are just place holders to show the amount of code we can actually fit in this location.
Line 21 is where the ELF header continues until…
Line 28 where the program header begins in the middle of the e_entry data of the ELF header.
This is where things get interesting.
The p_type data structure denotes the type of segment, here a 1, which is a LOAD segment, meaning it will be loaded into memory for further usage (the ORG address on line 3 plays a key role in where we want to be loaded.)
This structure, containing a value of 1, actually completes the second half of the e_entry data structure, making the full value 04 00 00 00 01 00 00 00. This gives the proper entry address of 0x100000004, which is 4 bytes after the location that the binary is loaded into memory, or 0x4. This is precisely where our _start label is.
The next structures that overlap are e_phoff (which is where the program headers are located), and p_flags, which are the flags that determine the sections permissions. In this case the flags are 0x1C which is 00011100 in binary. The ABI only pays attention to the lowest three bits, meaning this is marked “read”, and it’s value can be shared with the ELF header to designate that 0x1C is the address where the program headers start (which is in the middle of the ELF header.)
The rest of the structure continues and overlaps each other with largely dummy values until the end.
Keeping these data sizes in mind and how they overlap will be useful in the next write up. For now, here’s a small annotated part of elf.h that shows how this is eventually laid out.
So now we have our basic structure set up, let’s go through what happens when you run this.
First, let’s compile and run exit.asm like so:
nasm -f bin -o exit exit.asm
chmod +x exit
If all goes according to plan, you should see a 0 as the output from the last command.
When we run our ELF file, the kernel looks for the data structures we just went over in order to determine what to do with this particular binary. We want to load it into memory (at our specific address defined in p_vaddr) and execute at the entry point we defined at e_entry. Since the ELF and program headers overlap, the kernel jumps around our header and eventually loads our binary and figures out how to execute our code.
Our program is quite simple:
All we are doing here is moving value of 0x3C into the lowest 8 bits of the RAX register, putting a value of zero in the RDI register, and calling the kernel. 0x3C is the syscall number for exit, which just exits a process. Xoring RDI with itself creates a 0, which is our EXIT STATUS code, 0 meaning SUCCESS.
So it’s running just fine, despite being completely mangled, but what happens when we try and analyze this code?
It appears that objdump has no idea what to do with it, and readelf gives some very bizarre values as well. Other debuggers display some interesting results. You should play around !
So now we’ve successfully create an 84 byte ELF binary, the next step is seeing what else we can pack in this header, and do some more binary golfing. The next write up will describe applying these same techniques to create a VPS nuking one liner containing an 84 byte binary. It will also provide a more in depth look at specific data structures that can be reused to hold code, and how to jump around between them. Thanks for reading!
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