In this post we will walk you through a more sophisticated method of exploiting CVE-2019-12750. This is a local privilege escalation vulnerability that affects Symantec Endpoint Protection. The method of exploitation described in this post works, at the time of writing, on all versions of Windows. Read more
A little while ago, I discovered a vulnerability, CVE-2017-18019, affecting a kernel driver of multiple K7 Computing security products, as well as the products of Defenx, both for Windows. Both were affected because they were using the same anti virus engine, and both are now patched.
The proof of concept was based on an invalid kernel pointer dereference, which led to a blue screen of death. That research and the subsequent coordinated disclosure process were, at the time, sponsored and handled by SecuriTeam. It turns out that the proof of concept could be exploited further, and turned into local privilege escalation. So, with the permission of SecuriTeam, I decided to create a write-up of that local privilege escalation development process.
This article targets the following 64-bit Windows versions: Windows 7 SP1 – Windows 10 v1809.
A Medium integrity level is required in order to exploit this vulnerability in the way that is demonstrated through this article. In order to exploit this from a Low integrity level, you will have to do extra work in order to leak some kernel pointers. This can be done either though other IOCTLs handlers of the target driver itself, or through other Windows driver kernel memory leak bugs.
The root cause of this issue is that the author of the following function trusts a pointer to read data from, originating from a user-supplied input buffer, as long as it references an address inside the kernel address space.
The vulnerable function fetches a pointer from the IOCTL’s input buffer and checks if it is greater or equal to nt!MmHighestUserAddress (0x00007ffffffeffff in x64). If that’s true, then the function will proceed by dereferencing that pointer and evaluating the first byte located at that memory address.
Clearly, the purpose (even though the implementation is buggy) of this check is to verify that the pointer address from where further information will be read resides in kernel memory of which, from the developer’s perspective, its virtual address and contents are not supposed to be known and controlled by the user. This, of course, is not entirely true because kernel object addresses may be leaked, and also they may reference directly or indirectly user-supplied data.
The following screenshot shows (in grouped nodes) what we described above.
We can easily crash the host by supplying an arbitrary kernel pointer that references a non-allocated memory page.
The following image shows the output from Windbg the moment the memory access violation occurs.
What we know at this point is that we have a denial of service bug that can be triggered by any user in order to crash the host. So, we analysed this function further in order to find out if there is something more that we can do with it.
The following graph-view screenshot continues directly from what is shown in Figure 1.
Assuming that RCX points to a valid kernel address where the first byte is 0x4B, so that the previous check succeeds (cmp byte ptr [rcx], 4Bh), we arrive at the second part of the vulnerable function as shown above.
Here we notice further byte value checks, and specifically the second byte of the buffer referenced by RCX should be 0xFF in order to access the final part of our analysis.
A couple of pointer dereferences later, we see that the function is treating the last one as a function pointer. We also notice that the first and second parameters passed to RCX and RDX respectively can also be controlled.
To be more specific, the first parameter is taken from the buffer referenced by the arbitrary kernel pointer that we control, and the second one is pointing inside our user-input buffer that is defined through the call to DeviceIoControl function.
Setting things up
At this point, we have all the information we need in order to proceed with the exploitation of the vulnerability. To do that, we must know the address of a kernel object and also control its contents, to a certain extent. As we discussed, the initial pointer from where the rest of data is read leading to a function pointer called, must reference an address inside the kernel address space. This is also the developer’s assumption around the safety of that decision.
In a previous article we talked about Private Namespaces and the ability to insert user-defined data in the body of the associated kernel object. We will be using this type of objects in order to exploit the vulnerability, as they can be used reliably in this case as well.
In order to exploit this vulnerability, we will be using two kernel objects of the aforementioned type. The first object will be used for controlling the subsequent pointer dereferences that allow us to call an arbitrary function pointer, while the second object will be used in order to control the initial kernel pointer check that must reference a known kernel object in memory (first object).
Exploitation in Windows 7 SP1 x64
In the absence of exploitation mitigation such as SMEP (Supervisor Mode Execution Protection), taking advantage of this vulnerability is quite straight forward. We can execute our payload function in userland without taking any additional steps, such as temporarily disable SMEP. We just need to control the instruction pointer and that would be enough.
To start with, we will create a Private Namespace object using a random boundary name and we will use NtQuerySystemInformation function to leak its address.
Then, we will create another object of the same type with a crafted boundary name.
The first and second bytes must be 0x4B and 0xFF respectively (see Figures 1 and 3) to satisfy the byte value checks. Also, in the offset 0x0A (Figure 4 – first pointer dereference) of the crafted boundary name, we will be inserting the address of the first object + the distance in bytes (0x1a0) between that address and the location of the boundary name in that object + an arbitrary offset (0x1A) that contains a value that can be translated to a userland pointer, which satisfies the proof of concept for this version of Windows. Note that we take into account that at the result of the previous calculation, the value 0x0C will be added in order to reach the userland pointer value (Figure 4 – second pointer dereference).
Let’s have a closer look at how these two objects are ‘inter-connected’.
Finally, we can see the function pointer being called, in order to execute our payload at address 0x1010000.
Exploitation in Windows 8.1 – 10 v1809 x64
In more recent Windows versions, exploiting a kernel driver bug is more challenging due to exploitation mitigations that have been added. In this case, we take control over the execution flow by calling an arbitrary function. However, due to the SMEP we are not able to directly execute code that resides in the user address space from kernel mode, so we will have to take another approach.
A common solution is to attempt to temporarily disable SMEP by clearing the 20th bit in CR4 register of a specific processor and lock our threads execution to only run on that one, so that we can execute our payload in userland as before. However, we would have to restore CR4 in order to avoid KPP (Kernel Patch Protection/PatchGuard) killing the host.
Another way, which we will be using in this write-up, is to take advantage of the execution flow control in order to turn it into a “write-what-where” primitive, which will enable us to modify arbitrary data in kernel memory. Once that is achieved, there are, again, two common ways of taking advantage of this in order to elevate our privileges.
The first method is to overwrite with a NULL value the SD (Security Descriptor) pointer in the object header of an elevated process running as SYSTEM. This will allow a non-privileged process to inject and execute malicious code in the same security context. However, this method will only work up to Windows 10 v1511 (Build 10586), as described in this article.
Another way to take advantage of a “write-what-where” primitive is to enable privileges in the primary token of a non-privileged process in order to enable it to again inject and execute code in the security context of a process running as SYSTEM. This method still works fine, but it requires a minor modification from Windows 10 v1709 (Build 15063) onwards, as described here. What we are about to describe here can also be used in Windows 7.
Going back to what we have described so far, we have noted that we are also able to control the first two parameters (see Figure 4) passed in RCX and RDX respectively, once our arbitrary function is called. We are going to take advantage of this capability in a moment.
In this case, we first need to leak the address of the primary token of our process, where will be enabling additional privileges. We will be using that address as the target of our exploitation primitive. As in Windows 7, NtQuerySystemInformation can be used for the same purpose from the standard ‘Medium Integrity’ of a user process in order to leak the kernel object and function addresses that we will be using.
We will then create our first Private Namespace object with a custom boundary name, where the first 8 bytes will be set to the kernel address that we will be using as our ‘gadget’ to modify arbitrary kernel data. So, instead of executing a payload in userland, we will be redirecting the execution to kernel function, nt!RtlCopyLuid that will enable us to modify arbitrary kernel data.
Since we control both the RCX and RDX registers, we can use this function to complete our “write-what-where” primitive.
We will be needing, again, a second Private Namespace object with a custom boundary name which at offset 0x0A of the name data (Figure 8 – first pointer dereference) must contain the address of the first object + the distance in bytes (0x1a0) between that address and the location of the boundary name in that object. Remember that at the first 8 bytes of the boundary name of the first Private Namespace object, we have inserted the address of nt!RtlCopyLuid. Note that as before, we must take into account that at the result of the previous calculation, the value 0x0C will be added in order to reach our arbitrary kernel function pointer value, loaded at the R10 register (Figure 8 – second pointer dereference).
So, this is how it should look:
*(ULONG_PTR*)(boundaryName + 0x0A) = customPrivNameSpaceAddress + boundaryNameOffsetInDireObject - 0x0C;
Then, we need to take control of the first two parameters.
The first parameter loaded in RCX is read again from our custom boundary name, at offset 2 (the first two bytes of our custom boundary name must be 0x4B,0xFF). So, we will be setting there the address of our process’ token object + the offset (0x40) to reach the nt!_SEP_TOKEN_PRIVILEGES structure member.
It should look as follows:
*(ULONG_PTR*)(boundaryName + 0x02) = tokenAddress + 0x40;
Finally, we can also control RDX since the value of R12 is copied over, which points at the address of our userland input buffer + 0x10 (see Figure 1 – 6th node). This is where we read the data from, to write into an arbitrary kernel address. In this case we will overwrite the ‘Enabled’ and ‘Present’ privileges members of the aforementioned structure (Figure 10).
It should look like this:
*(unsigned __int64*)(inputBuf + 0x10) = _ULLONG_MAX;
So, our exploit will have to reach the vulnerable function twice in order to complete the attack.
The image above shows how the two objects are ‘interconnected’ in order to complete our “write-what-where” primitive to finalize the exploit.
This was an interesting bug to examine and exploit, as it shows once more that no input data should ever be blindly trusted. From the developer’s perspective, trusting a kernel pointer to read data from, presumably out of user’s control, was a ‘safe’ decision to take. However, it turned out to become a serious vulnerability in multiple products of two different vendors that use the same SDK.