| ---[ Phrack Magazine Volume 8, Issue 52 January 26, 1998, article 17 of 20 | |
| -------------------------[ Protected mode programming and O/S development | |
| --------[ Mythrandir <jwthomp@cu-online.com> | |
| ----[ Forward | |
| About two months ago I decided to begin learning about developing an operating | |
| system from the ground up. I have been involved in trusted operating systems | |
| development for over two years now but have always done my work with | |
| pre-existing operating systems. Mucking with this driver model, deciphering | |
| that streams implementation, loving this, hating that. I decided it was time | |
| to begin fresh and start really thinking about how to approach the design | |
| of one, so that I would be happy with every part. At least if I wasn't, I | |
| would only be calling myself names. | |
| This article is the first tentative step in my development of an operating | |
| system. What is here is not really much of a kernel yet. The big focus of | |
| this article will be getting a system up and running in protected mode with a | |
| very minimal kernel. I stress minimal. I have been asked repeatedly what my | |
| design goals for this operating system are. The fact is the operating system | |
| itself was the goal for this part. There was simply to much that I didn't | |
| know about this stage of the development to go on designing something. It | |
| would be like asking a kindergarten fingerpainter what her final masterpiece | |
| was going to look like. | |
| However, now that I have this phase reasonably done, it is time to begin | |
| thinking about such issues as: a security subsystem, a driver subsystem, as | |
| well as developing a real task manager and a real memory manager. Hopefully, | |
| by the next phrack I will be able to not only answer what I want for these | |
| topics but have also implemented many of them. This will leave me with a much | |
| more solid kernel that can be built upon. | |
| So, why write this article? There are several reasons. First, writing down | |
| what you have done always help solidify your thoughts and understanding. | |
| Second, having to write an article imposes a deadline on me which forces me to | |
| get the job done. Finally, and most importantly I hope to give out enough | |
| knowledge that others who are interested in the subject can begin to do some | |
| work in it. | |
| One comment on the name. JeffOS is not going to be the final name for this OS. | |
| In fact several names have been suggested. However, I have no idea yet what I | |
| want to call it, mostly because it just isn't solidified enough for a name. | |
| When its all said and done, I do hope I can come up with something better than | |
| JeffOS. For now, getting a real working kernel is more important than a real | |
| working name. | |
| I hope that you find the following information interesting, and worth | |
| investigating further. | |
| Cheers, | |
| Jeff Thompson | |
| AKA Mythrandir | |
| PS: Some words on the Cryptography article. First a thank you for all of the | |
| letters that I received on the article. I am happy to find that many people | |
| found the article interesting. For several people it rekindled an old interest | |
| which is always great to hear. However, for several people I have unfortunate | |
| news as well. The next article in the series will have to be postponed for | |
| a few issues until I complete this operating system. As is with many people, | |
| I have been caught by a new bug (The OS bug) and have set myself up to be | |
| committed to the work for some time. I am of course still interested in | |
| discussing the topic with others and look forward to more email on the subject. | |
| The winners of the decryption contest were: | |
| 1st message: | |
| 1st) Chaos at chaos@vector.nevtron.si | |
| 2nd) Oxygen at oxygen@james.kalifornia.com | |
| Solution: | |
| The baron's army will attack at dawn. Ready the Templar knights and strike his | |
| castle while we hold him. | |
| 2nd message: | |
| 1st) Chaos | |
| Solution: | |
| MULTICAST PROTOCOLS HAVE BEEN DEVELOPED TO SUPPORT GROUP COMMUNICATIONS | |
| THESE PROTOCOLS USE A ONE TO MANY PARADIGM FOR TRANSMISSION TYPICALLY | |
| USING CLASS D INTERNET PROTOCOL ADDRESSES TO SPECIFY SPECIFIC MULTICAST GROUPS | |
| Also, there is one typo in my article. The book which was written without the | |
| letter 'e' was not The Great Gatsby, but rather Gadsby. Thanks to Andy | |
| Magnusson for pointing that out. | |
| Great job guys! | |
| ----[ Acknowledgements | |
| I owe a certain debt to two people who have been available to me during my | |
| development work. Both have done quite a bit of work developing their own | |
| protected mode operating systems. I would like to thank Paul Swanson of the | |
| ACM@UIUC chapter for helping solve several bugs and for giving me general tips | |
| on issues I encountered. I would also like to thank Brian Swetland of | |
| Neoglyphics for giving me a glimpse of his operating system. He was also nice | |
| enough to allow me to steal some of his source code for my use. This source | |
| include the console io routines which saved me a great deal of time. Also, | |
| the i386 functions were given to me by Paul Swanson which has made a lot of | |
| the common protected mode instructions easily useable. | |
| Following new releases and information on this operating systems work, I am | |
| currently redoing my web site and will have it up by Feb 1, 1998. I will be | |
| including this entire article on that site along with all updates to the | |
| operating system as I work on it. One of the first things that I will be | |
| doing is rewriting all of the kernel. A large part of what is contained | |
| within these pages was a learning experience. Unfortunately, one consequence | |
| of trying to get this thing done was it becoming fairly messy and hackish. I | |
| would like to clean it up and begin to build upon it. Having a good code base | |
| will be invaluable to this. So please watch for the next, and future releases | |
| of this code and feel free to contact me with any feedback or questions. I | |
| will do my best to help. I won't be able to answer every question but I will | |
| certainly try. Also, please be patient as I have a very busy schedule outside | |
| of this project and am often times caught up by it. | |
| I can be reached at: | |
| jwthomp@cu-online.com | |
| and my web site is at: | |
| http://www.cu-online.com/~jwthomp/ (Up Feb 1, 1998) | |
| ----[ Introduction | |
| Throughout this document I assume a certain level of knowledge on the part of | |
| the reader. This knowledge includes c and assembly language programming, and | |
| x86 architecture. | |
| The development requirements for the GuildOS operating system are: | |
| An ELF compiler | |
| I used the gnu ELF compiler which comes with linux. It is possible to use | |
| other ELF cross compilers on other systems as well. | |
| a386 assembler | |
| This can be obtained from: | |
| Eric Isaacson | |
| 416 E. University Ave. | |
| Bloomington IN 47401-4739 | |
| 71333.3154@compuserve.com | |
| or call 1-812-335-1611 | |
| A86+D86+A386+D386 is $80 | |
| Printed manual $10 | |
| This is a really nice assembler. Buy a copy. I did. | |
| It is also possible to convert the boot loader assembly code to another | |
| assembler. | |
| A 486+ machine | |
| You must have a machine to test the OS on. | |
| Great books to read to gain an understanding of the various topics presented | |
| in the following pages are: | |
| Protected Mode Software Architecture by Tom Shanley from MindShare, Inc. | |
| ISBN 0-201-55447-X $29.95 US | |
| This book covers the protected mode architecture of the x86. It also explains | |
| the differences between real mode and protected mode programming. This book | |
| contains much of the information which is in the Intel Operating Systems | |
| Developers guide, but also explains things much more in depth. | |
| Developing Your Own 32-Bit Operating System by Richard A. Burgess from SAMS | |
| Publishing. ISBN 0-672-30655-7 | |
| This book covers the development of a complete 32-bit OS. The author also | |
| creates his own 32-bit assembler and compiler. Considerable portions of the | |
| code are written in asm, but there is still quite a bit in C. | |
| The entire Intel architecture series and their OS developers guides which are | |
| available from their web site for free. | |
| ----[ Chapter 1 - Booting into protected mode | |
| The first step in setting up an operating system on the x86 architecture is to | |
| switch the machine into protected mode. Protected mode allows you to use | |
| hardware protection schemes to provide operating system level security. | |
| The first component which I began working on was the first stage boot loader | |
| which is located in "JeffOS/loader/first/". | |
| The first stage boot loader is placed on the first sector of the floppy. Each | |
| sector is 512 bytes. This is not a lot of room to write all of the code | |
| required to boot into protected mode the way I would like to so I had to break | |
| the boot loader into two parts. Thus the first and second stage floppy loader. | |
| After the Power On Self-Test (POST) test this first sector is loaded up into | |
| memory location 0000:7C00. I designed the first stage of the floppy boot | |
| loader to load up all of the files into memory to be executed. The first | |
| instruction in the boot loader jumps to the boot code. However, between the | |
| jump and the boot code are some data structures. | |
| The first section is the disk parameters. I'm not currently using any of this | |
| information but will in future versions. The next set of structures contain | |
| information on the other data files on the floppy disk. Each structure looks | |
| like this in assembly: | |
| APCX DW 0000h ; Specifies CX value for INT 13h BIOS routine | |
| APDX DW 0000h ; DX | |
| APES DW 0000h ; ES | |
| APBX DW 0000h ; BX | |
| APSZ DB 0h ; Specifies number of sectors to read in | |
| APSZ2 DB 0h ; Unused | |
| There are four copies of this structure (APxx, BPxx, CPxx, DPxx). | |
| The INT 13h BIOS call has the following arguments: | |
| ch: Cylinder number to start reading from. | |
| cl: Sector number to start at. | |
| dh: Head number of drive to read from (00h or 01h for 1.44M floppy disk drives) | |
| dl: Drive number (00h for Disk A) | |
| es: Segment to store the read in sectors at. | |
| bx: Offset into the segment to read the sectors into. | |
| ah: Number of sectors to read in. | |
| al: Function number for INT 13h. (02h is to read in from the disk) | |
| I use the APxx to load the second stage boot loader. BPxx is being used | |
| to load the first stage kernel loader. CPxx is used to load a simple user | |
| program. Finally, DPxx is used to load the kernel in. | |
| Following the loader structures are two unused bytes which are used to store | |
| temporary data. SIZE is used but SIZE2 is not currently used. | |
| The boot code follows these structures. This boot code relocates itself into | |
| another section of memory (9000:0000 or 90000h linear). Once relocated, it | |
| loads all of the files into memory and then jumps into the beginning of the | |
| second stage boot loader. | |
| The first part of the second stage boot loader contains a macro which is used | |
| to easily define a Global Descriptor Table (GDT) entry. In protected mode the | |
| GDT is used to store information on selectors. A selector in protected mode | |
| is referred to by a number stored in any of the segment registers. A selector | |
| has the following format: | |
| Bits Use | |
| 15 - 3 Descriptor Table Index | |
| 2 Table Indicator | |
| 1 - 0 The Requestor Privilege Level | |
| The Descriptor Table Index or (DT) is an index into the GDT. The first entry | |
| in the GDT is 00h, the second is 08h, then 10h, etc.. The reason that the | |
| entries progress in this manner is because the 3 least significant bits are | |
| used for other information. So to find the index into the GDT you do a | |
| segment & 0xfff8 (DT = Selector & 0xfff8). | |
| The Table Indicator selects whether you are using a GDT or a Local Descriptor | |
| Table (LDT). I have not yet had a reason to use LDT's so I will leave this | |
| information to your own research for now. | |
| Finally, the Requestor Privilege Level is used to tell the processor what | |
| level of access you would like to have to the selector. | |
| 0 = OS | |
| 1 = OS (but less privileged than 0) | |
| 2 = OS (but less privileged than 1) | |
| 3 = User level | |
| Typically levels 0 and 3 are the only ones used in modern operating systems. | |
| The GDT entries which describe various types of segments have the following | |
| form: | |
| 63 - 56 Upper Byte of Base Address | |
| 55 Granularity Bit | |
| 54 Default Bit | |
| 53 0 | |
| 52 Available for Use (free bit) | |
| 51 - 48 Upper Digit of Limit | |
| 47 Segment Present Bit | |
| 46 - 45 Descriptor Privilege Level | |
| 44 System Bit | |
| 43 Data/Code Bit | |
| 42 Conforming Bit | |
| 41 Readable bit | |
| 40 Accessed bit | |
| 39 - 32 Third Byte of Base Address | |
| 31 - 24 Second Byte of Base Address | |
| 23 - 16 First Byte of Base Address | |
| 15 - 8 Second Byte of Limit | |
| 7 - 0 First Byte of Limit | |
| The base address is the starting location of the segment descriptor (for code | |
| or data segments). The limit is the number of bytes or 4k pages. Whether it | |
| is bytes or 4k pages depends on the setting of the granularity but. If the | |
| granularity bit is set to 0 then the limit specifies the length in bytes. If | |
| it is set to 1 then the limit specifies the length of the segment in 4k pages. | |
| The default bit specifies whether the code segment is 32bit or 16bit. If it is | |
| set to 0 then it is 16bit. If it is set to 1 then it is 32bit. | |
| The present bit is set to one if the segment is currently in memory. This is | |
| used for virtual paging. | |
| The descriptor privilege level is similar to the RPL. The DPL simply states at | |
| what protection level the segment exists at. The values are the same as for | |
| the RPL. | |
| The system bit is used to specify whether the segment contains a system segment. | |
| It is set to 0 if it is a system(OS) segment. | |
| The data/code bit is used to specify whether the segment is to be used as a | |
| code segment or as a data segment. A code segment is used to execute code | |
| from and is not writable. A data segment is used for stacks and program | |
| data. It's format is slightly different from the code segment depicted above. | |
| The readable bit is used to specify whether information can be read from the | |
| segment or whether it is execute only. | |
| The next part of the second stage floppy boot loader contains the code which | |
| is used to enable the A20 address line. This address line allows you to | |
| access beyond the 1MB limit that was imposed on normal DOS real mode | |
| operation. For a discussion of this address line I recommend looking at the | |
| Intel architecture books. | |
| Once enabled the GDT that exists as data at the end of the assembly file is | |
| loaded into the GDT register. This must be done before the switch into | |
| protected mode. Other wise any memory accesses will not have a valid selector | |
| described for them and will cause a fault (I learned this from experience). | |
| Once this is completed the move is made to protected mode by setting the | |
| protected mode bit in the CR0 register to 1. | |
| Following the code which enables protected mode, there is data which represents | |
| a far call into the next portion of the second stage boot loader. This causes | |
| a new selector to be used for CS as opposed to an undefined one. | |
| The code that is jumped into simply sets up the various selectors for the data | |
| segments. | |
| There is then some simple debugging code which prints to the screen. This was | |
| used for myself and can be removed. | |
| The stack segment is then set up along with the stack pointer. I placed the | |
| stack at 90000h. | |
| Finally I push the value for the stack onto the stack (to be retrieved by the | |
| kernel) and then call linear address 100080h which contains the first stage | |
| loader for the kernel. | |
| ----[ Chapter 2 - The first stage kernel boot loader | |
| The first stage kernel boot loader is located in \boot. | |
| First some notes on what is happening with the first stage boot loader. The | |
| boot loader is compiled to ELF at a set TEXT address so that I can jump into | |
| the code and have it execute for me. In the makefile I specify the text | |
| address to be 10080. The first 80h bytes are used as the ELF header. I | |
| completely ignore this information and jump directly into linear memory | |
| address 10080h. It is my understanding that newer versions of the ELF compiler | |
| have a slightly different header length and may cause this number to need to be | |
| modified. This can be determined by using a dissasembler (i.e. DEBUG in DOS) | |
| to determine where the text segment is beginning. | |
| The two files of importance to the boot loader are main.c and mem.c. | |
| main.c contains the function `void _start(unsigned long blh);`. This function | |
| must be the first function linked in. So main.c must be the first file which | |
| is linked and _start() must be the first function in it. This guarantees that | |
| start will be at 10080h. The parameter blh is the value which was pushed in | |
| by the second stage boot loader. This originally had meaning, but no longer | |
| does. | |
| The first thing that _start does is to call kinit_MemMgmt which is the | |
| initialization routine for memory. | |
| The first thing that kinit_MemMgmt does is set nMemMax to 0xfffff. This is | |
| the maximum number of bytes on the system. This value is 1MB. kinit_MemMgmt | |
| then calls kmemcount which attempts to calculate the amount of free memory on | |
| the system. Currently this routine does not work properly and assumes that | |
| there is 2MB of free memory on the system. This is sufficient for now but | |
| needs to be fixed in the future. | |
| kinit_MemMgmt then calls kinit_page which sets of the page tables for the | |
| kernel. | |
| Paging is the mechanism used to define what memory a task is able to access. | |
| This is done by creating a "virtual" memory space which the task accesses. | |
| Whenever an access to memory occurs the processor looks into the page tables | |
| to determine what "real" physical memory is pointed to by this memory location. | |
| For example, the kernel could designate that each task will get 32k (8 pages) | |
| of memory to use for the stack. Without using paged memory each of these | |
| memory locations would occur at a different address. However, by using paging | |
| you can map each of these physical memory allocations to a paged address | |
| which allows each of these allocations to appear to occur at the same location. | |
| The page tables are broken up in the following manner. First is the page | |
| directory. It is composed of 1024 entries which have the following properties: | |
| 31 - 12 Page Table Base Address | |
| 11 - 9 Unused (Free bits) | |
| 8 0 | |
| 7 Page Size Bit | |
| 6 0 | |
| 5 Accessed Bit | |
| 4 Page Cache Disable Bit | |
| 3 Page Write Through Bit | |
| 2 User/Supervisor Bit | |
| 1 Read/Write Bit | |
| 0 Page Present Bit | |
| The Page Table Base address is an index to the page table which contains | |
| information about this memory location. When a memory location is accessed | |
| the most significant 10 bits are used to reference one of the 1024 entries in | |
| the page directory. This entry will point to a page table which has a physical | |
| memory address equal to the Page Table Base Address. This table is then | |
| referenced to one of its 1024 entries by the 21 - 12 bits of the memory | |
| address. | |
| The Page Size Bit tells whether each page is equal to (Bit = 0) 4kb or | |
| (Bit = 1) 4MB. | |
| The accessed bit is used to show whether the page has ever been accessed. Once | |
| set to 1, the OS must reset it to 0. This is used for virtual paging. | |
| The Page Cache Disable Bit and Page Write Bit are not currently used by me, so | |
| I will leave its definition as an exercise to the reader (enjoy). | |
| The User/Supervisor Bit specifies whether access to the page table is | |
| restricted to access by tasks with privilege level 0,1,2 or 3. If the bit is | |
| set to 0 then only tasks with level 0, 1, or 2 can access this page table. If | |
| the bit is set to 1, then tasks with level 0, 1, 2, or 3 can access this page | |
| table. | |
| The Read/Write bit is used to specify whether a user level task can write to | |
| this page table. If it is set to 0 then it is read only to "User" tasks. If | |
| it is set to 1 then it is read/writable by all tasks. | |
| Finally, the Present Bit is used to specify whether the page table is present | |
| in memory. If this is set to 1 then it is. | |
| Once the page directory is referenced, the offset into the page table is | |
| selected. Using the next 10 bits of the memory reference. Each page table | |
| has 1024 entries with each entry having the following structure: | |
| 31 - 12 Page Base Address | |
| 11 - 9 Unused (Free bits) | |
| 8 - 7 0 | |
| 6 Dirty Bit | |
| 5 Accessed Bit | |
| 4 Page Cache Disable Bit | |
| 3 Page Write Through Bit | |
| 2 User/Supervisor Bit | |
| 1 Read/Write Bit | |
| 0 Page Present Bit | |
| The Page Base Address points to the upper 20 bits in physical memory where | |
| the memory access points to. The lower 12 bits are taken from the original | |
| linear memory access. | |
| The Dirty, Accessed, Page Cache, and Page Write Through Bits are all used for | |
| virtual memory and other areas which I have not yet been concerned yet. So | |
| they are relegated to the reader (for now). | |
| The remaining three bits behave just as in the page directory except that | |
| they apply to the physical memory page as opposed to a page table. All | |
| kernel pages are set to have Supervisor, Read/Write, and Page Present bits | |
| set. User pages do not have the supervisor bits set. | |
| The code in kinit_page creates the page directory in the first of the three | |
| physical pages that it set aside. The next page is used to create a low (user) | |
| memory area of 4MB (One page table of 1024 entries points to 1024 4kb pages, | |
| Thus 4MB). The third page is used to point to high (OS) memory. | |
| The kinit_page function sets all of the low page memory equal to physical | |
| memory. This means that there is a one to one correlation for the first 4MB | |
| of memory to paged memory. kinit_page then maps in ten pages starting at | |
| 70000h linear into 0x80000000. Entry number 0 of the page directory is then | |
| set to point to the low page table. Entry number 512 is set to point to the | |
| high page table. | |
| Finally the kinit_page function places the address of the page directory | |
| into the cr3 register. This tells the processor where to look for the page | |
| tables. Finally, cr0 has its paging bit turned on which informs the processor | |
| that memory accesses should go through the page table rather than just being | |
| direct physical memory accesses. | |
| After this the _start function is returned into and k_start() has been set to | |
| 0x80000080 which points to the _start() function in the main kernel. | |
| _start in the boot code calls this function which starts the real kernel off. | |
| ----[ Chapter 3 - The Kernel | |
| The kernel is where all of the fun begins. Unfortunately, this is the place | |
| that needs the most work. However, there is enough here to demonstrate the | |
| beginnings of what needs to be done to build a viable kernel for your own work. | |
| The kernel boot loader created the kernel page table and then jumped into the | |
| kernel at _start(); _start() then sets up the console, clears it, and displays | |
| the message "Main kernel loaded.". Once this is done it runs the memory | |
| manager initialization routine 'kinit_page()'. | |
| The memory manager initialization routine begins by initializing a structure | |
| called the PMAT. The PMAT is a giant bit field (2048 bytes), where each bit | |
| represents one page of physical memory. If a bit is set to 1, the | |
| corresponding page of memory is considered allocated. If the bit is set to 0 | |
| then it is considered unallocated. Once this array is initialized the memory | |
| management code sets aside the chunks of physical memory which are already in | |
| use. This include the system BUS memory areas, as well as the location of the | |
| kernel itself in physical memory. Once this is completed the memory manager | |
| returns to the _start() function so that it can proceed with kernel | |
| initialization. | |
| The _start() function then calls a temporary function which I am using now to | |
| allocate memory which is use by the user program loading in by the first | |
| stage floppy loader. This will go away after I add the loading of processes | |
| off of disk during run time. This function sets aside the physical memory | |
| which is located at 20000h linear. | |
| Now that the basic memory system is set up the _start() function calls the | |
| kinit_task() function. kinit_task() sets up the kernel task so that it can | |
| run as a task rather than as a the only process on the system. | |
| kinit_task() is really a shell function which calls two other functions: | |
| kinit_gdt() and kinit_ktask(); kinit_gdt() initializes a new kernel GDT which | |
| is to be used by the kernel rather than the previous temporary one which was | |
| set up by the second stage floppy boot loader. Once the new location for the | |
| gdt is mapped into memory several selectors are added to it. Kernel Code and | |
| Data selectors are added. Also, User Code and Data selectors are added. Once | |
| these selectors are put into place, the new gdt is placed in the gdt register | |
| on the processor so that it can be used. | |
| kinit_task() now calls the kinit_ktask() function. This task creates a task | |
| which the kernel code will be executed as. The first thing this function does | |
| is to clear out the kernels task list. This list contains a list of tasks | |
| on the system. Next a 4k page is allocated for the kernel task segment. The | |
| current executing task is then set to the kernel task. Next the task segment | |
| is added to the GDT. This task segment has the following structure and is | |
| filled out for the kernel with the following values by me. In fact all tasks | |
| will start out with these settings. | |
| struct TSS { | |
| ushort link; // set to 0 | |
| ushort unused0; | |
| ulong esp0; // set to the end of the task segment page | |
| ushort ss0; // set to SEL_KDATA (Kernel Data segment) | |
| ushort unused1; | |
| ulong esp1; // set to 0 | |
| ushort ss1; // set to 0 | |
| ushort unused2; | |
| ulong esp2; // set to 0 | |
| ushort ss2; // set to 0 | |
| ushort unused3; | |
| ulong cr3; // set to the physical address of this tasks page | |
| // tables | |
| ulong eip; // set to the entry point to this tasks code | |
| ulong eflags; // set to 0x4202 | |
| ulong eax, ecx, edx, ebx, esp, ebp, esi, edi; // set to garbage values | |
| ushort es; // set to SEL_KDATA (Kernel data segment) | |
| ushort unused4; | |
| ushort cs; // set to SEL_KCODE (Kernel code segment) | |
| ushort unused5; | |
| ushort ss; // set to SEL_KDATA | |
| ushort unused6; | |
| ushort ds; // set to SEL_KDATA | |
| ushort unused7; | |
| ushort fs; // set to SEL_KDATA | |
| ushort unused8; | |
| ushort gs; // set to SEL_KDATA | |
| ushort unused9; | |
| ushort ldt; // set to 0 | |
| ushort unused10; | |
| ushort debugtrap; // set to 0 | |
| ushort iomapbase; // set to 0 | |
| }; | |
| The link field is used by the processor when an interrupt is called. The | |
| processor places a pointer to the task segment which was running prior to the | |
| interrupt. This is useful for determining access rights based on the calling | |
| process. | |
| The espx and ssx parameters are used to store a pointer to a stack which will | |
| be used when a task with a lower privilege level tries to access a high level | |
| privilege area. | |
| The cr3 parameter is used to store a pointer to the physical address of this | |
| tasks page table. Whenever this task is switched to, the processor will load | |
| the value stored in cr3 into the cr3 register. This means that each task can | |
| have a unique set of page tables and mappings. | |
| The eax, ebx, etc.. registers are all set to a garbage value as they are | |
| uninitialized and will only gain values once they are used. When the processor | |
| switches to this task these parameters will be loaded into their respective | |
| processor registers. | |
| The cs, es, ss, ds, fs, and gs parameters are all set to meaningful values | |
| which will be loaded into their respective processor registers when this | |
| task is switched to. | |
| As I am not using a local descriptor I set this parameter to 0 along with the | |
| debugtrap and iomapbase parameters. | |
| As I have mentioned every time a task is switched to the processor will load | |
| all of the parameters from the task segment into their respective registers. | |
| Likewise, when a task is switched out of, all of the registers will be stored | |
| in their respective parameters. This allows tasks to be suspended and to | |
| restart with the state they left off at. | |
| Switching tasks will be discussed later when the point in the kernel where this | |
| takes place at is reached. | |
| Once this task state segment is created it is necessary to create an entry in | |
| the GDT which points to this task segment. The format of this 64 bit entry is | |
| as follows: | |
| 63 - 56 Fourth Byte of Base Address | |
| 55 Granularity Bit | |
| 54 - 53 0 | |
| 52 Available for use (free bit) | |
| 51 - 48 Upper Nibble of Size | |
| 47 Present in Memory Bit | |
| 46 - 45 Descriptor Privilege Level | |
| 44 System Built | |
| 43 16/32 Bit | |
| 42 0 | |
| 41 Busy Bit | |
| 40 1 | |
| 39 - 32 Third Byte of Base Address | |
| 31 - 24 Second Byte of Base Address | |
| 23 - 16 First Byte of Base Address | |
| 15 - 8 Second Byte of Segment Size | |
| 7 - 0 First Byte of Segment Size | |
| As you have probably noticed, this structure is very similar to the code | |
| segment descriptor. The differences are the 16/32 bit, and the Busy Bit. | |
| The 16/32 Bit specifies whether the task state segment is 16 bit or 32 bit. | |
| We will only be using the 32 Bit task segment (Bit = 1). The 16 bit task state | |
| segment was used for the 286 and was replaced by a 32 bit task state segment on | |
| the 386+ processors. | |
| The busy bit specifies whether the task is currently busy. | |
| Once the kernel task is allocated, a new kernel stack is allocated and made | |
| active. This allows the stack to be in a known and mapped in location which | |
| uses the memory manager of the kernel. | |
| The user tasks is then created in a similar fashion as the kernel task. In | |
| this current implementation the user task is located at 0x20000. Its stack | |
| is located at 0x2107c. Currently, this user task operates with OS level | |
| privilege. I encountered some problems when changing its selectors to user | |
| entries in the GDT. As soon as I fix this problem I will post a fix on my web | |
| site. After the user task is created it is added to the task queue to be | |
| switched to once the scheduler starts. | |
| Now that the kernel task and a user task (though running with kernel privilege | |
| level) have been created it is necessary to set up the interrupt tables. This | |
| is done by a call to the kinit_idt() function. | |
| kinit_idt() starts by setting all of the interrupts to point to a null | |
| interrupt function. This means that for most interrupts a simple return | |
| occurs. However, interrupt handlers for the timer as well as for one system | |
| call. Also, interrupts are set up to handle the various exceptions. Once | |
| this table is filled out the interrupt descriptor table (IDT) is loaded into | |
| the idt register. The interrupts are then enabled to allow them to be called. | |
| The timer interrupt handler is a simple function which calls a task switch | |
| every time the hardware timer fires. | |
| The system call (interrupt 22h) is called, the handler will print out on the | |
| console the string which is pointed to be the eax register. | |
| The exception handling routine will dump the task registers and then hang the | |
| system. The jump.S file in JeffOS/kernel/ contains the assembly wrappers which | |
| are called when an interrupt occurs. These wrapper functions then call the C | |
| handler functions. | |
| Now that the IDT is set up and interrupts are occurring task switches can occur. | |
| These occur when the swtch() function is called in the task.c file. The | |
| swtch() function locates the next task in its queue and does a call to the | |
| selector address of the new task. This causes the processor to look up the | |
| selector and switch to the new task. | |
| You now have a very simple multi-tasking kernel. | |
| ----[ Chapter 4 - User level libraries | |
| The user level libraries are fairly simplistic. | |
| There are two files in this directory. The first is the crt0.c file. | |
| This file contains one function which is the _start() function. This function | |
| makes a call to main which will be defined in user code. This stub function | |
| must always be linked in first as it will be jumped into by the kernel to | |
| begin running the process. | |
| The second file is the syscall.c file. This file contains one system call | |
| function which is simply an interrupt 22. This interrupt calls the console | |
| system call. eax is passed in as a pointer to a string which is printed to | |
| the system console. | |
| Both of these source files are compiled to objects and are used during the | |
| linking phase of any user code. | |
| ----[ Chapter 5 - User code | |
| The user code is stored in one file called test.c. This file is located in | |
| the /user/ directory. All this code does is call the console system call | |
| function provided by the library, wait a short amount of time, and call it | |
| again in a non-terminating loop (good thing, as I don't handle task | |
| termination yet). | |
| The important thing to note is that when linking this user process is set to | |
| have a text segment of 20000h linear. Also the crt0.o and syscall.o files are | |
| linked in as well. crt0.o is linked in first to insure that its _start() | |
| function is at 20080h so it will be jumped into by the kernel. In truth, | |
| _start() is the real main as opposed to the main() everyone is used to dealing | |
| with. | |
| This code is the task which is created and run alongside the kernel, as | |
| described in chapter 3. | |
| ----[ Chapter 6 - Creating a disk image out of the binaries | |
| Once you have compiled all of the binaries and placed them into the build | |
| directory you will need to create two more files before continuing. These | |
| files are called STUFF.BIN and STUFF2.BIN. These files are simply containers | |
| of empty space to cause alignment of other binaries. The floppy loader | |
| expects the user program to be 1k in size. If the user program is not exactly | |
| this size then STUFF2.BIN needs to be created and be of such a size that when | |
| added to USER.BIN the size is 1024 bytes. Also, the floppy boot loader | |
| expects the kernel boot loader to be 3.5k (3584 bytes) in size. STUFF.BIN | |
| needs to be made of such length that when added to the size of the BOOT.BIN | |
| (kernel boot loader) file the size will be 3584 bytes. In the future I will | |
| try to automate this process, but for now this is simply how it must be done. | |
| Once this is complete the shell program 'go' must be run. This will place all | |
| of the binary files into one file called 'os.bin'. This file can then be | |
| written to disk by one of the following two methods. | |
| If you want to do it from linux you can do the following command: | |
| dd if=os.bin of=/dev/fd0 (places os.bin directly onto the floppy disk) | |
| or from DOS you can obtain the rawrite command and run it and follow its | |
| directions. | |
| ----[ Conclusion | |
| The kernel contained within is far from complete. However, it is a first step | |
| towards creating a real protected mode operating system. It is also enough to | |
| begin working with, or to refer to during you own work on a protected mode | |
| operating system. Doing this work is simply both one of the most rewarding | |
| things you will ever do, and one of the most frustrating. Many a night has | |
| been spent at the local tavern telling war stories about this stuff. But in | |
| the end, it has all been great fun. | |
| I wish you all the best of luck! | |
| Jeff Thompson | |
| jwthomp@cu-online.com | |
| http://www.cu-online.com/~jwthomp/ | |
| <++> JeffOS.tgz.uue | |
| begin 600 JeffOS.tgz | |
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| %]0`@`P`Q | |
| ` | |
| end | |
| <--> | |
| ----[ EOF | |