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  • lvm mirroring space unavailable.

    - by Bryan Ward
    I am trying to migrate my data on lvm to two new disks, and setup mirroring between the two. I have successfully migrated all of the data to the first of the two disks, leaving the second one completely available as a mirror. I verified this using pvdisplay -m /dev/sd{g,h}1 --- Physical volume --- PV Name /dev/sdg1 VG Name vg PV Size 931.51 GiB / not usable 3.19 MiB Allocatable yes PE Size 4.00 MiB Total PE 238466 Free PE 82866 Allocated PE 155600 PV UUID v2nc3j-EFBR-QpuG-xgro-Rm59-fmu6-IB3QcR --- Physical Segments --- Physical extent 0 to 49999: Logical volume /dev/vg/videos Logical extents 0 to 49999 Physical extent 50000 to 99999: Logical volume /dev/vg/home Logical extents 0 to 49999 Physical extent 100000 to 129999: Logical volume /dev/vg/music Logical extents 0 to 29999 Physical extent 130000 to 155599: Logical volume /dev/vg/videos Logical extents 50000 to 75599 Physical extent 155600 to 238465: FREE --- Physical volume --- PV Name /dev/sdh1 VG Name vg PV Size 931.51 GiB / not usable 3.19 MiB Allocatable yes PE Size 4.00 MiB Total PE 238466 Free PE 238466 Allocated PE 0 PV UUID LuTrem-WcsZ-qw7l-2CDS-lLKI-wdq0-QEXhLf --- Physical Segments --- Physical extent 0 to 238465: FREE Then when I try to mirror the home logical volume for example, it says that I do not have sufficient space. I used lvconvert -m1 vg/home and the output was: Insufficient suitable allocatable extents for logical volume : 50000 more required Unable to allocate extents for mirror(s). This puzzling to me because it appears as if there is plenty of space on the second disk to mirror. Is there something I have done wrong here? Or is there a way to explicitly tell LVM where to put each leg of the mirror? I'm using lvm2.

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  • mount.nfs: access denied by server while mounting (Kerberos authentication)

    - by Nick
    There's plenty of references to this error on Goggle, and even a question here with the same title, but it seems that "access denied by server while mounting" is a catch-all error. I've tried suggestions that others have used to fix this problem, but they did not work in my case. I'm trying to set-up a Kerberos-based NFS file server with shared homes for a Linux network. I'm using Ubuntu 11.04 Servers and clients. When trying to mount a share using: mount 192.168.1.115:/export/home/ /media/tmp I get: mount.nfs: access denied by server while mounting 192.168.1.115:/export/home/ This is the same if I mount it from a client machine or from the server itself. On the server, in /var/log/syslog I get: Aug 25 06:22:37 nfs mountd[1580]: authenticated mount request from 192.168.1.115:835 for /export/home (/export/home) Aug 25 06:22:37 nfs mountd[1580]: authenticated unmount request from 192.168.1.115:766 for /export/home (/export/home) Which is odd, since it says it's authenticated the request, not denying it. /etc/exports: /export *(rw,fsid=0,crossmnt,insecure,async,no_subtree_check,sec=krb5p:krb5i:krb5) /export/home *(rw,insecure,async,no_subtree_check,sec=krb5p:krb5i:krb5) On client: me@dt1:/$ rpcinfo -p 192.168.1.115 program vers proto port 100000 2 tcp 111 portmapper 100024 1 udp 37320 status 100024 1 tcp 48460 status 100003 2 tcp 2049 nfs 100003 3 tcp 2049 nfs 100003 4 tcp 2049 nfs 100227 2 tcp 2049 100227 3 tcp 2049 100003 2 udp 2049 nfs 100003 3 udp 2049 nfs 100003 4 udp 2049 nfs 100227 2 udp 2049 100227 3 udp 2049 100021 1 udp 58625 nlockmgr 100021 3 udp 58625 nlockmgr 100021 4 udp 58625 nlockmgr 100021 1 tcp 49616 nlockmgr 100021 3 tcp 49616 nlockmgr 100021 4 tcp 49616 nlockmgr 100005 1 udp 45627 mountd 100005 1 tcp 60265 mountd 100005 2 udp 45627 mountd 100005 2 tcp 60265 mountd 100005 3 udp 45627 mountd 100005 3 tcp 60265 mountd Any suggestions I could try?

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  • optimal folder structure for storing 100k files on a USB drive

    - by cherouvim
    I need to store 100k files (around 40GB) in a USB drive. Each file has a unique int id (e.g 45000). Option one is to put all files in a single folder: root/ root/1.pdf root/2.pdf root/3.pdf ... root/567.pdf root/568.pdf root/569.pdf ... root/10001.pdf root/10002.pdf root/10003.pdf ... root/99998.pdf root/99999.pdf root/100000.pdf Option two is to create a [1-9][0-9]* folder hierarchy based on that id: root/ root/1/file.pdf root/2/file.pdf root/3/file.pdf ... root/5/6/7/file.pdf root/5/6/8/file.pdf root/5/6/9/file.pdf ... root/1/0/0/0/1/file.pdf root/1/0/0/0/2/file.pdf root/1/0/0/0/3/file.pdf ... root/9/9/9/9/8/file.pdf root/9/9/9/9/9/file.pdf root/1/0/0/0/0/0/file.pdf Which option will scale better? I can understand that the second option will require tons of folders but each folder will at most contain 10 folders and 1 file. Maintenance will not be an issue since everything will be controlled by an application. Note that this is a USB drive on linux and based on the above I'd also like to know whether I should go with FAT32 or NTFS.

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  • What is the best hosting option for Flash web-widget?

    - by par
    Our Flash web-widget has got highly popular. It is downloaded around 100,000 times per day. And that is the problem. Our server bandwidth is too narrow to deliver the widget to the clients fast. The widget is loaded very slow. Probably 20 times slower than before (at peak times). Probably I have choosen not the right hoster for my task - delivering 1 MB Flash widget to 100,000 users per day. What is the best hosting solution in my case? I'm not good at server administration so forgive me if I sound naive. The details are the following. Our hoster options: -Dedicated server, Ubuntu -10 Mbit Connection -monthly bandwidth limit: 2000 GB Widget size is 1 MB. The widget consists of the main SWF and a number of loaded SWF and data files. This is a part of Apache Status report taken right now ---- Server uptime: 1 hour 2 minutes 38 seconds Total accesses: 74865 - Total Traffic: 5.8 GB CPU Usage: u28 s7.78 cu0 cs0 - .952% CPU load 19.9 requests/sec - 1.6 MB/second - 81.1 kB/request 200 requests currently being processed, 0 idle workers WWWWWWWWWWWWWWWWWWWWWWWWCWWWWWWWWWWWWWWWWWWWWWWWWWWCWWWWWWWCWWWW WWWWWCWWWWWWWWWWWWWWCWWWWWWWWWWWWCWWWWWWWWCWWCWWWWWWWWWWWWWWWWWW WWWWWWWWWWWWWWWWCWWWWWWWWWWWWWWWWWWWWWWWWWWWCWCWWWWWWWWWWWWWWWCW WWWWWWWW........................................................ ----

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  • pdns-recursor allocates resources to non-existing queries

    - by azzid
    I've got a lab-server running pdns-recursor. I set it up to experiment with rate limiting, so it has been resolving requests openly from the whole internet for weeks. My idea was that sooner or later it would get abused, giving me a real user case to experiment with. To keep track of the usage I set up nagios to monitor the number of concurrent-queries to the server. Today I got notice from nagios that my specified limit had been reached. I logged in to start trimming away the malicious questions I was expecting, however, when I started looking at it I couldn't see the expected traffic. What I found is that even though I have over 20 concurrent-queries registered by the server I see no requests in the logs. The following command describes the situation well: $ sudo rec_control get concurrent-queries; sudo rec_control top-remotes 22 Over last 0 queries: How can there be 22 concurrent-queries when the server has 0 queries registered? EDIT: Figured it out! To get top-remotes working I needed to set ################################# # remotes-ringbuffer-entries maximum number of packets to store statistics for # remotes-ringbuffer-entries=100000 It defaults to 0 storing no information to base top-remotes statistics on.

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  • C Number to Text problem with ones and tens..

    - by Joegabb
    #include<stdio.h> #include<conio.h> main() { int ones,tens,ventoteen, myloop = 0; long num2,cents2,centeens,cents1,thousands,hundreds; double num; do{ printf("Enter a number: "); scanf("%lf",&num); if(num<=10000 || num>=0) { if (num==0) { printf("\t\tZero"); } num=(num*100); num2= (long)num; thousands=num2/100000; num2=num2%100000; hundreds=num2/10000; num2=num2%10000; if ((num2>=1100) || (num2<=1900)) { tens=0; ones=0; ventoteen=num2%1000; } else { tens=num2/1000; num2=num2%1000; ones=num2/100; num2=num2%100; } if((num2>=11) && (num2<=19)) { cents1=0; cents2=0; centeens=num2%10; } else { cents1=num2/10; num2=num2%10; cents2=num2/1; } if (thousands == 1) printf("One thousand "); else if (thousands == 2) printf("Two thousand "); else if (thousands == 3) printf("Three Thousand "); else if (thousands == 4) printf("Four thousand "); else if (thousands == 5) printf("Five Thousand "); else if (thousands == 6) printf("Six thousand "); else if (thousands == 7) printf("Seven Thousand "); else if (thousands == 8) printf("Eight thousand "); else if (thousands == 9) printf("Nine Thousand "); else {} if (hundreds == 1) printf("one hundred "); else if (hundreds == 2) printf("two hundred "); else if (hundreds == 3) printf("three hundred "); else if (hundreds == 4) printf("four hundred "); else if (hundreds == 5) printf("five hundred "); else if (hundreds == 6) printf("six hundred "); else if (hundreds == 7) printf("seven hundred "); else if (hundreds == 8) printf("eight hundred "); else if (hundreds == 9) printf("nine hundred "); else {} switch(ventoteen) { case 1: printf("eleven ");break; case 2: printf("twelve ");break; case 3: printf("thirteen ");break; case 4: printf("fourteen ");break; case 5: printf("fifteen ");break; case 6: printf("sixteen ");break; case 7: printf("seventeen ");break; case 8: printf("eighteen ");break; case 9: printf("nineteen ");break; } switch(tens) { case 1: printf("ten ");break; case 2: printf("twenty ");break; case 3: printf("thirty ");break; case 4: printf("forty ");break; case 5: printf("fifty ");break; case 6: printf("sixty ");break; case 7: printf("seventy ");break; case 8: printf("eighty ");break; case 9: printf("ninety ");break; } switch(ones) { case 1: printf("one ");break; case 2: printf("two ");break; case 3: printf("three ");break; case 4: printf("four ");break; case 5: printf("five ");break; case 6: printf("six ");break; case 7: printf("seven ");break; case 8: printf("eight ");break; case 9: printf("nine ");break; } switch(cents1) { case 1: printf("and ten centavos ");break; case 2: printf("and twenty centavos ");break; case 3: printf("and thirty centavos ");break; case 4: printf("and fourty centavos ");break; case 5: printf("and fifty centavos ");break; case 6: printf("and sixty centavos ");break; case 7: printf("and seventy centavos ");break; case 8: printf("and eighty centavos ");break; case 9: printf("and ninety centavos ");break; } switch(centeens) { case 1: printf("and eleven centavos ");break; case 2: printf("and twelve centavos ");break; case 3: printf("and thirteen centavos ");break; case 4: printf("and fourteen centavos ");break; case 5: printf("and fifteen centavos ");break; case 6: printf("and sixteen centavos ");break; case 7: printf("and seventeen centavos ");break; case 8: printf("and eighteen centavos ");break; case 9: printf("and nineteen centavos ");break; } switch(cents2) { case 1: printf("and one centavos ");break; case 2: printf("and two centavos ");break; case 3: printf("and three centavos ");break; case 4: printf("and four centavos ");break; case 5: printf("and five centavos ");break; case 6: printf("and six centavos ");break; case 7: printf("and seven centavos ");break; case 8: printf("and eight centavos ");break; case 9: printf("and nine centavos ");break; } } getch(); }while(myloop == 0); return 0; } my code is working fine but the problem is when i input 1 - 90 nothing appears but when i input 100 the output would be fine and that is "One Hundred" and so as 1000 the output would be "One Thousand". thanks for the help..

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  • Table Variables: an empirical approach.

    - by Phil Factor
    It isn’t entirely a pleasant experience to publish an article only to have it described on Twitter as ‘Horrible’, and to have it criticized on the MVP forum. When this happened to me in the aftermath of publishing my article on Temporary tables recently, I was taken aback, because these critics were experts whose views I respect. What was my crime? It was, I think, to suggest that, despite the obvious quirks, it was best to use Table Variables as a first choice, and to use local Temporary Tables if you hit problems due to these quirks, or if you were doing complex joins using a large number of rows. What are these quirks? Well, table variables have advantages if they are used sensibly, but this requires some awareness by the developer about the potential hazards and how to avoid them. You can be hit by a badly-performing join involving a table variable. Table Variables are a compromise, and this compromise doesn’t always work out well. Explicit indexes aren’t allowed on Table Variables, so one cannot use covering indexes or non-unique indexes. The query optimizer has to make assumptions about the data rather than using column distribution statistics when a table variable is involved in a join, because there aren’t any column-based distribution statistics on a table variable. It assumes a reasonably even distribution of data, and is likely to have little idea of the number of rows in the table variables that are involved in queries. However complex the heuristics that are used might be in determining the best way of executing a SQL query, and they most certainly are, the Query Optimizer is likely to fail occasionally with table variables, under certain circumstances, and produce a Query Execution Plan that is frightful. The experienced developer or DBA will be on the lookout for this sort of problem. In this blog, I’ll be expanding on some of the tests I used when writing my article to illustrate the quirks, and include a subsequent example supplied by Kevin Boles. A simplified example. We’ll start out by illustrating a simple example that shows some of these characteristics. We’ll create two tables filled with random numbers and then see how many matches we get between the two tables. We’ll forget indexes altogether for this example, and use heaps. We’ll try the same Join with two table variables, two table variables with OPTION (RECOMPILE) in the JOIN clause, and with two temporary tables. It is all a bit jerky because of the granularity of the timing that isn’t actually happening at the millisecond level (I used DATETIME). However, you’ll see that the table variable is outperforming the local temporary table up to 10,000 rows. Actually, even without a use of the OPTION (RECOMPILE) hint, it is doing well. What happens when your table size increases? The table variable is, from around 30,000 rows, locked into a very bad execution plan unless you use OPTION (RECOMPILE) to provide the Query Analyser with a decent estimation of the size of the table. However, if it has the OPTION (RECOMPILE), then it is smokin’. Well, up to 120,000 rows, at least. It is performing better than a Temporary table, and in a good linear fashion. What about mixed table joins, where you are joining a temporary table to a table variable? You’d probably expect that the query analyzer would throw up its hands and produce a bad execution plan as if it were a table variable. After all, it knows nothing about the statistics in one of the tables so how could it do any better? Well, it behaves as if it were doing a recompile. And an explicit recompile adds no value at all. (we just go up to 45000 rows since we know the bigger picture now)   Now, if you were new to this, you might be tempted to start drawing conclusions. Beware! We’re dealing with a very complex beast: the Query Optimizer. It can come up with surprises What if we change the query very slightly to insert the results into a Table Variable? We change nothing else and just measure the execution time of the statement as before. Suddenly, the table variable isn’t looking so much better, even taking into account the time involved in doing the table insert. OK, if you haven’t used OPTION (RECOMPILE) then you’re toast. Otherwise, there isn’t much in it between the Table variable and the temporary table. The table variable is faster up to 8000 rows and then not much in it up to 100,000 rows. Past the 8000 row mark, we’ve lost the advantage of the table variable’s speed. Any general rule you may be formulating has just gone for a walk. What we can conclude from this experiment is that if you join two table variables, and can’t use constraints, you’re going to need that Option (RECOMPILE) hint. Count Dracula and the Horror Join. These tables of integers provide a rather unreal example, so let’s try a rather different example, and get stuck into some implicit indexing, by using constraints. What unusual words are contained in the book ‘Dracula’ by Bram Stoker? Here we get a table of all the common words in the English language (60,387 of them) and put them in a table. We put them in a Table Variable with the word as a primary key, a Table Variable Heap and a Table Variable with a primary key. We then take all the distinct words used in the book ‘Dracula’ (7,558 of them). We then create a table variable and insert into it all those uncommon words that are in ‘Dracula’. i.e. all the words in Dracula that aren’t matched in the list of common words. To do this we use a left outer join, where the right-hand value is null. The results show a huge variation, between the sublime and the gorblimey. If both tables contain a Primary Key on the columns we join on, and both are Table Variables, it took 33 Ms. If one table contains a Primary Key, and the other is a heap, and both are Table Variables, it took 46 Ms. If both Table Variables use a unique constraint, then the query takes 36 Ms. If neither table contains a Primary Key and both are Table Variables, it took 116383 Ms. Yes, nearly two minutes!! If both tables contain a Primary Key, one is a Table Variables and the other is a temporary table, it took 113 Ms. If one table contains a Primary Key, and both are Temporary Tables, it took 56 Ms.If both tables are temporary tables and both have primary keys, it took 46 Ms. Here we see table variables which are joined on their primary key again enjoying a  slight performance advantage over temporary tables. Where both tables are table variables and both are heaps, the query suddenly takes nearly two minutes! So what if you have two heaps and you use option Recompile? If you take the rogue query and add the hint, then suddenly, the query drops its time down to 76 Ms. If you add unique indexes, then you've done even better, down to half that time. Here are the text execution plans.So where have we got to? Without drilling down into the minutiae of the execution plans we can begin to create a hypothesis. If you are using table variables, and your tables are relatively small, they are faster than temporary tables, but as the number of rows increases you need to do one of two things: either you need to have a primary key on the column you are using to join on, or else you need to use option (RECOMPILE) If you try to execute a query that is a join, and both tables are table variable heaps, you are asking for trouble, well- slow queries, unless you give the table hint once the number of rows has risen past a point (30,000 in our first example, but this varies considerably according to context). Kevin’s Skew In describing the table-size, I used the term ‘relatively small’. Kevin Boles produced an interesting case where a single-row table variable produces a very poor execution plan when joined to a very, very skewed table. In the original, pasted into my article as a comment, a column consisted of 100000 rows in which the key column was one number (1) . To this was added eight rows with sequential numbers up to 9. When this was joined to a single-tow Table Variable with a key of 2 it produced a bad plan. This problem is unlikely to occur in real usage, and the Query Optimiser team probably never set up a test for it. Actually, the skew can be slightly less extreme than Kevin made it. The following test showed that once the table had 54 sequential rows in the table, then it adopted exactly the same execution plan as for the temporary table and then all was well. Undeniably, real data does occasionally cause problems to the performance of joins in Table Variables due to the extreme skew of the distribution. We've all experienced Perfectly Poisonous Table Variables in real live data. As in Kevin’s example, indexes merely make matters worse, and the OPTION (RECOMPILE) trick does nothing to help. In this case, there is no option but to use a temporary table. However, one has to note that once the slight de-skew had taken place, then the plans were identical across a huge range. Conclusions Where you need to hold intermediate results as part of a process, Table Variables offer a good alternative to temporary tables when used wisely. They can perform faster than a temporary table when the number of rows is not great. For some processing with huge tables, they can perform well when only a clustered index is required, and when the nature of the processing makes an index seek very effective. Table Variables are scoped to the batch or procedure and are unlikely to hang about in the TempDB when they are no longer required. They require no explicit cleanup. Where the number of rows in the table is moderate, you can even use them in joins as ‘Heaps’, unindexed. Beware, however, since, as the number of rows increase, joins on Table Variable heaps can easily become saddled by very poor execution plans, and this must be cured either by adding constraints (UNIQUE or PRIMARY KEY) or by adding the OPTION (RECOMPILE) hint if this is impossible. Occasionally, the way that the data is distributed prevents the efficient use of Table Variables, and this will require using a temporary table instead. Tables Variables require some awareness by the developer about the potential hazards and how to avoid them. If you are not prepared to do any performance monitoring of your code or fine-tuning, and just want to pummel out stuff that ‘just runs’ without considering namby-pamby stuff such as indexes, then stick to Temporary tables. If you are likely to slosh about large numbers of rows in temporary tables without considering the niceties of processing just what is required and no more, then temporary tables provide a safer and less fragile means-to-an-end for you.

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  • Merge sort versus quick sort performance

    - by Giorgio
    I have implemented merge sort and quick sort using C (GCC 4.4.3 on Ubuntu 10.04 running on a 4 GB RAM laptop with an Intel DUO CPU at 2GHz) and I wanted to compare the performance of the two algorithms. The prototypes of the sorting functions are: void merge_sort(const char **lines, int start, int end); void quick_sort(const char **lines, int start, int end); i.e. both take an array of pointers to strings and sort the elements with index i : start <= i <= end. I have produced some files containing random strings with length on average 4.5 characters. The test files range from 100 lines to 10000000 lines. I was a bit surprised by the results because, even though I know that merge sort has complexity O(n log(n)) while quick sort is O(n^2), I have often read that on average quick sort should be as fast as merge sort. However, my results are the following. Up to 10000 strings, both algorithms perform equally well. For 10000 strings, both require about 0.007 seconds. For 100000 strings, merge sort is slightly faster with 0.095 s against 0.121 s. For 1000000 strings merge sort takes 1.287 s against 5.233 s of quick sort. For 5000000 strings merge sort takes 7.582 s against 118.240 s of quick sort. For 10000000 strings merge sort takes 16.305 s against 1202.918 s of quick sort. So my question is: are my results as expected, meaning that quick sort is comparable in speed to merge sort for small inputs but, as the size of the input data grows, the fact that its complexity is quadratic will become evident? Here is a sketch of what I did. In the merge sort implementation, the partitioning consists in calling merge sort recursively, i.e. merge_sort(lines, start, (start + end) / 2); merge_sort(lines, 1 + (start + end) / 2, end); Merging of the two sorted sub-array is performed by reading the data from the array lines and writing it to a global temporary array of pointers (this global array is allocate only once). After each merge the pointers are copied back to the original array. So the strings are stored once but I need twice as much memory for the pointers. For quick sort, the partition function chooses the last element of the array to sort as the pivot and scans the previous elements in one loop. After it has produced a partition of the type start ... {elements <= pivot} ... pivotIndex ... {elements > pivot} ... end it calls itself recursively: quick_sort(lines, start, pivotIndex - 1); quick_sort(lines, pivotIndex + 1, end); Note that this quick sort implementation sorts the array in-place and does not require additional memory, therefore it is more memory efficient than the merge sort implementation. So my question is: is there a better way to implement quick sort that is worthwhile trying out? If I improve the quick sort implementation and perform more tests on different data sets (computing the average of the running times on different data sets) can I expect a better performance of quick sort wrt merge sort? EDIT Thank you for your answers. My implementation is in-place and is based on the pseudo-code I have found on wikipedia in Section In-place version: function partition(array, 'left', 'right', 'pivotIndex') where I choose the last element in the range to be sorted as a pivot, i.e. pivotIndex := right. I have checked the code over and over again and it seems correct to me. In order to rule out the case that I am using the wrong implementation I have uploaded the source code on github (in case you would like to take a look at it). Your answers seem to suggest that I am using the wrong test data. I will look into it and try out different test data sets. I will report as soon as I have some results.

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  • Finding the maximum value/date across columns

    - by AtulThakor
    While working on some code recently I discovered a neat little trick to find the maximum value across several columns….. So the starting point was finding the maximum date across several related tables and storing the maximum value against an aggregated record. Here's the sample setup code: USE TEMPDB IF OBJECT_ID('CUSTOMER') IS NOT NULL BEGIN DROP TABLE CUSTOMER END IF OBJECT_ID('ADDRESS') IS NOT NULL BEGIN DROP TABLE ADDRESS END IF OBJECT_ID('ORDERS') IS NOT NULL BEGIN DROP TABLE ORDERS END SELECT 1 AS CUSTOMERID, 'FREDDY KRUEGER' AS NAME, GETDATE() - 10 AS DATEUPDATED INTO CUSTOMER SELECT 100000 AS ADDRESSID, 1 AS CUSTOMERID, '1428 ELM STREET' AS ADDRESS, GETDATE() -5 AS DATEUPDATED INTO ADDRESS SELECT 123456 AS ORDERID, 1 AS CUSTOMERID, GETDATE() + 1 AS DATEUPDATED INTO ORDERS .csharpcode, .csharpcode pre { font-size: small; color: black; font-family: consolas, "Courier New", courier, monospace; background-color: #ffffff; /*white-space: pre;*/ } .csharpcode pre { margin: 0em; } .csharpcode .rem { color: #008000; } .csharpcode .kwrd { color: #0000ff; } .csharpcode .str { color: #006080; } .csharpcode .op { color: #0000c0; } .csharpcode .preproc { color: #cc6633; } .csharpcode .asp { background-color: #ffff00; } .csharpcode .html { color: #800000; } .csharpcode .attr { color: #ff0000; } .csharpcode .alt { background-color: #f4f4f4; width: 100%; margin: 0em; } .csharpcode .lnum { color: #606060; }   Now the code used a function to determine the maximum date, this performed poorly. After considering pivoting the data I opted for a case statement, this seemed reasonable until I discovered other areas which needed to determine the maximum date between 5 or more tables which didn't scale well. The final solution involved using the value clause within a sub query as followed. SELECT C.CUSTOMERID, A.ADDRESSID, (SELECT MAX(DT) FROM (Values(C.DATEUPDATED),(A.DATEUPDATED),(O.DATEUPDATED)) AS VALUE(DT)) FROM CUSTOMER C INNER JOIN ADDRESS A ON C.CUSTOMERID = A.CUSTOMERID INNER JOIN ORDERS O ON O.CUSTOMERID = C.CUSTOMERID .csharpcode, .csharpcode pre { font-size: small; color: black; font-family: consolas, "Courier New", courier, monospace; background-color: #ffffff; /*white-space: pre;*/ } .csharpcode pre { margin: 0em; } .csharpcode .rem { color: #008000; } .csharpcode .kwrd { color: #0000ff; } .csharpcode .str { color: #006080; } .csharpcode .op { color: #0000c0; } .csharpcode .preproc { color: #cc6633; } .csharpcode .asp { background-color: #ffff00; } .csharpcode .html { color: #800000; } .csharpcode .attr { color: #ff0000; } .csharpcode .alt { background-color: #f4f4f4; width: 100%; margin: 0em; } .csharpcode .lnum { color: #606060; } As you can see the solution scales well and can take advantage of many of the aggregate functions!

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  • How to raycast select a scaled OBB?

    - by user3254944
    I have the OBB picking code to select an OBB with code inspired from Real time Rendering 3 and opengl-tutorial.org. I can successfully select objects that have been moved or rotated. However, I cant correctly select an object that has been scaled. The bounding box scales right, but the I can only select the object in a thin strip on its center. How do I fix the checkForHits() function to allow it to read the scaling that I passed to it in the raycast matrix? void GLWidget::selectObjRaycast() { glm::vec2 mouse = (glm::vec2(mousePos.x(), mousePos.y()) / glm::vec2(this->width(), this->height())) * 2.0f - 1.0f; mouse.y *= -1; glm::mat4 toWorld = glm::inverse(ProjectionM * ViewM); glm::vec4 from = toWorld * glm::vec4(mouse, -1.0f, 1.0f); glm::vec4 to = toWorld * glm::vec4(mouse, 1.0f, 1.0f); from /= from.w; to /= to.w; fromAABB = glm::vec3(from); toAABB = glm::normalize(glm::vec3(to - from)); checkForHits(); } void GLWidget::checkForHits() { for (int i = 0; i < myWin.myEtc->allObj.size(); ++i) //check for hits on each obj's bb { bool miss = 0; float tMin = 0.0f; float tMax = 100000.0f; glm::vec3 bbPos(myWin.myEtc->allObj[i]->raycastM[3].x, myWin.myEtc->allObj[i]->raycastM[3].y, myWin.myEtc->allObj[i]->raycastM[3].z); glm::vec3 delta = bbPos - fromAABB; for (int j = 0; j < 3; ++j) { glm::vec3 axis(myWin.myEtc->allObj[i]->raycastM[j].x, myWin.myEtc->allObj[i]->raycastM[j].y, myWin.myEtc->allObj[i]->raycastM[j].z); float e = glm::dot(axis, delta); float f = glm::dot(toAABB, axis); if (fabs(f) > 0.001f) { float t1 = (e + myWin.myEtc->allObj[i]->bbMin[j]) / f; float t2 = (e + myWin.myEtc->allObj[i]->bbMax[j]) / f; if (t1 > t2) { float w = t1; t1 = t2; t2 = w; } if (t2 < tMax) tMax = t2; if (t1 > tMin) tMin = t1; if (tMax < tMin) miss = 1; } else { if (-e + myWin.myEtc->allObj[i]->bbMin[j] > 0.0f || -e + myWin.myEtc->allObj[i]->bbMax[j] < 0.0f) miss = 1; } } if (miss == 0) { intersection_distance = tMin; myWin.myEtc->sel.push_back(myWin.myEtc->allObj[i]); myWin.myEtc->allObj[i]->highlight = myWin.myGLHelp->highlight; break; } } } void Object::render(glm::mat4 PV) { scaleM = glm::scale(glm::mat4(), s->val_3); r_quat = glm::quat(glm::radians(r->val_3)); rotationM = glm::toMat4(r_quat); translationM = glm::translate(glm::mat4(), t->val_3); transLocal1M = glm::translate(glm::mat4(), -rsPivot->val_3); transLocal2M = glm::translate(glm::mat4(), rsPivot->val_3); raycastM = translationM * transLocal2M * rotationM * scaleM * transLocal1M; // MVP = PV * translationM * transLocal2M * rotationM * scaleM * transLocal1M; }

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  • Improving the running time of Breadth First Search and Adjacency List creation

    - by user45957
    We are given an array of integers where all elements are between 0-9. have to start from the 1st position and reach end in minimum no of moves such that we can from an index i move 1 position back and forward i.e i-1 and i+1 and jump to any index having the same value as index i. Time Limit : 1 second Max input size : 100000 I have tried to solve this problem use a single source shortest path approach using Breadth First Search and though BFS itself is O(V+E) and runs in time the adjacency list creation takes O(n2) time and therefore overall complexity becomes O(n2). is there any way i can decrease the time complexity of adjacency list creation? or is there a better and more efficient way of solving the problem? int main(){ vector<int> v; string str; vector<int> sets[10]; cin>>str; int in; for(int i=0;i<str.length();i++){ in=str[i]-'0'; v.push_back(in); sets[in].push_back(i); } int n=v.size(); if(n==1){ cout<<"0\n"; return 0; } if(v[0]==v[n-1]){ cout<<"1\n"; return 0; } vector<int> adj[100001]; for(int i=0;i<10;i++){ for(int j=0;j<sets[i].size();j++){ if(sets[i][j]>0) adj[sets[i][j]].push_back(sets[i][j]-1); if(sets[i][j]<n-1) adj[sets[i][j]].push_back(sets[i][j]+1); for(int k=j+1;k<sets[i].size();k++){ if(abs(sets[i][j]-sets[i][k])!=1){ adj[sets[i][j]].push_back(sets[i][k]); adj[sets[i][k]].push_back(sets[i][j]); } } } } queue<int> q; q.push(0); int dist[100001]; bool visited[100001]={false}; dist[0]=0; visited[0]=true; int c=0; while(!q.empty()){ int dq=q.front(); q.pop(); c++; for(int i=0;i<adj[dq].size();i++){ if(visited[adj[dq][i]]==false){ dist[adj[dq][i]]=dist[dq]+1; visited[adj[dq][i]]=true; q.push(adj[dq][i]); } } } cout<<dist[n-1]<<"\n"; return 0; }

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  • Is there an easy way to type in common math symbols?

    - by srcspider
    Disclaimer: I'm sure someone is going to moan about easy-of-use, for the purpose of this question consider readability to be the only factor that matters So I found this site that converts to easting northing, it's not really important what that even means but here's how the piece of javascript looks. /** * Convert Ordnance Survey grid reference easting/northing coordinate to (OSGB36) latitude/longitude * * @param {OsGridRef} gridref - easting/northing to be converted to latitude/longitude * @returns {LatLonE} latitude/longitude (in OSGB36) of supplied grid reference */ OsGridRef.osGridToLatLong = function(gridref) { var E = gridref.easting; var N = gridref.northing; var a = 6377563.396, b = 6356256.909; // Airy 1830 major & minor semi-axes var F0 = 0.9996012717; // NatGrid scale factor on central meridian var f0 = 49*Math.PI/180, ?0 = -2*Math.PI/180; // NatGrid true origin var N0 = -100000, E0 = 400000; // northing & easting of true origin, metres var e2 = 1 - (b*b)/(a*a); // eccentricity squared var n = (a-b)/(a+b), n2 = n*n, n3 = n*n*n; // n, n², n³ var f=f0, M=0; do { f = (N-N0-M)/(a*F0) + f; var Ma = (1 + n + (5/4)*n2 + (5/4)*n3) * (f-f0); var Mb = (3*n + 3*n*n + (21/8)*n3) * Math.sin(f-f0) * Math.cos(f+f0); var Mc = ((15/8)*n2 + (15/8)*n3) * Math.sin(2*(f-f0)) * Math.cos(2*(f+f0)); var Md = (35/24)*n3 * Math.sin(3*(f-f0)) * Math.cos(3*(f+f0)); M = b * F0 * (Ma - Mb + Mc - Md); // meridional arc } while (N-N0-M >= 0.00001); // ie until < 0.01mm var cosf = Math.cos(f), sinf = Math.sin(f); var ? = a*F0/Math.sqrt(1-e2*sinf*sinf); // nu = transverse radius of curvature var ? = a*F0*(1-e2)/Math.pow(1-e2*sinf*sinf, 1.5); // rho = meridional radius of curvature var ?2 = ?/?-1; // eta = ? var tanf = Math.tan(f); var tan2f = tanf*tanf, tan4f = tan2f*tan2f, tan6f = tan4f*tan2f; var secf = 1/cosf; var ?3 = ?*?*?, ?5 = ?3*?*?, ?7 = ?5*?*?; var VII = tanf/(2*?*?); var VIII = tanf/(24*?*?3)*(5+3*tan2f+?2-9*tan2f*?2); var IX = tanf/(720*?*?5)*(61+90*tan2f+45*tan4f); var X = secf/?; var XI = secf/(6*?3)*(?/?+2*tan2f); var XII = secf/(120*?5)*(5+28*tan2f+24*tan4f); var XIIA = secf/(5040*?7)*(61+662*tan2f+1320*tan4f+720*tan6f); var dE = (E-E0), dE2 = dE*dE, dE3 = dE2*dE, dE4 = dE2*dE2, dE5 = dE3*dE2, dE6 = dE4*dE2, dE7 = dE5*dE2; f = f - VII*dE2 + VIII*dE4 - IX*dE6; var ? = ?0 + X*dE - XI*dE3 + XII*dE5 - XIIA*dE7; return new LatLonE(f.toDegrees(), ?.toDegrees(), GeoParams.datum.OSGB36); } I found that to be a really nice way of writing an algorythm, at least as far as redability is concerned. Is there any way to easily write the special symbols. And by easily write I mean NOT copy/paste them.

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  • Projective texture and deferred lighting

    - by Vodácek
    In my previous question, I asked whether it is possible to do projective texturing with deferred lighting. Now (more than half a year later) I have a problem with my implementation of the same thing. I am trying to apply this technique in light pass. (my projector doesn't affect albedo). I have this projector View a Projection matrix: Matrix projection = Matrix.CreateOrthographicOffCenter(-halfWidth * Scale, halfWidth * Scale, -halfHeight * Scale, halfHeight * Scale, 1, 100000); Matrix view = Matrix.CreateLookAt(Position, Target, Vector3.Up); Where halfWidth and halfHeight is are half of the texture's width and height, Position is the Projector's position and target is the projector's target. This seems to be ok. I am drawing full screen quad with this shader: float4x4 InvViewProjection; texture2D DepthTexture; texture2D NormalTexture; texture2D ProjectorTexture; float4x4 ProjectorViewProjection; sampler2D depthSampler = sampler_state { texture = <DepthTexture>; minfilter = point; magfilter = point; mipfilter = point; }; sampler2D normalSampler = sampler_state { texture = <NormalTexture>; minfilter = point; magfilter = point; mipfilter = point; }; sampler2D projectorSampler = sampler_state { texture = <ProjectorTexture>; AddressU = Clamp; AddressV = Clamp; }; float viewportWidth; float viewportHeight; // Calculate the 2D screen position of a 3D position float2 postProjToScreen(float4 position) { float2 screenPos = position.xy / position.w; return 0.5f * (float2(screenPos.x, -screenPos.y) + 1); } // Calculate the size of one half of a pixel, to convert // between texels and pixels float2 halfPixel() { return 0.5f / float2(viewportWidth, viewportHeight); } struct VertexShaderInput { float4 Position : POSITION0; }; struct VertexShaderOutput { float4 Position :POSITION0; float4 PositionCopy : TEXCOORD1; }; VertexShaderOutput VertexShaderFunction(VertexShaderInput input) { VertexShaderOutput output; output.Position = input.Position; output.PositionCopy=output.Position; return output; } float4 PixelShaderFunction(VertexShaderOutput input) : COLOR0 { float2 texCoord =postProjToScreen(input.PositionCopy) + halfPixel(); // Extract the depth for this pixel from the depth map float4 depth = tex2D(depthSampler, texCoord); //return float4(depth.r,0,0,1); // Recreate the position with the UV coordinates and depth value float4 position; position.x = texCoord.x * 2 - 1; position.y = (1 - texCoord.y) * 2 - 1; position.z = depth.r; position.w = 1.0f; // Transform position from screen space to world space position = mul(position, InvViewProjection); position.xyz /= position.w; //compute projection float3 projection=tex2D(projectorSampler,postProjToScreen(mul(position,ProjectorViewProjection)) + halfPixel()); return float4(projection,1); } In first part of pixel shader is recovered position from G-buffer (this code I am using in other shaders without any problem) and then is tranformed to projector viewprojection space. Problem is that projection doesn't appear. Here is an image of my situation: The green lines are the rendered projector frustum. Where is my mistake hidden? I am using XNA 4. Thanks for advice and sorry for my English. EDIT: Shader above is working but projection was too small. When I changed the Scale property to a large value (e.g. 100), the projection appears. But when the camera moves toward the projection, the projection expands, as can bee seen on this YouTube video.

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  • How to avoid reallocation using the STL (C++)

    - by Tue Christensen
    This question is derived of the topic: http://stackoverflow.com/questions/2280655/vector-reserve-c I am using a datastructur of the type vector<vector<vector<double> > >. It is not possible to know the size of each of these vector (except the outer one) before items (doubles) are added. I can get an approximate size (upper bound) on the number of items in each "dimension". A solution with the shared pointers might be the way to go, but I would like to try a solution where the vector<vector<vector<double> > > simply has .reserve()'ed enough space (or in some other way has allocated enough memory). Will A.reserve(500) (assumming 500 is the size or, alternatively an upper bound on the size) be enough to hold "2D" vectors of large size, say [1000][10000]? The reason for my question is mainly because I cannot see any way of reasonably estimating the size of the interior of A at the time of .reserve(500). An example of my question: vector A; A.reserve(500+1); vector temp2; vector temp1 (666,666); for(int i=0;i<500;i++) { A.push_back(temp2); for(int j=0; j< 10000;j++) { A.back().push_back(temp1); } } Will this ensure that no reallocation is done for A? If temp2.reserve(100000) and temp1.reserve(1000) where added at creation will this ensure no reallocation at all will occur at all? In the above please disregard the fact that memory could be wasted due to conservative .reserve() calls. Thank you all in advance!

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  • Finding perfect numbers in C# (optimization)

    - by paradox
    I coded up a program in C# to find perfect numbers within a certain range as part of a programming challenge . However, I realized it is very slow when calculating perfect numbers upwards of 10000. Are there any methods of optimization that exist for finding perfect numbers? My code is as follows: using System; using System.Collections.Generic; using System.Linq; namespace ConsoleTest { class Program { public static List<int> FindDivisors(int inputNo) { List<int> Divisors = new List<int>(); for (int i = 1; i<inputNo; i++) { if (inputNo%i==0) Divisors.Add(i); } return Divisors; } public static void Main(string[] args) { const int limit = 100000; List<int> PerfectNumbers = new List<int>(); List<int> Divisors=new List<int>(); for (int i=1; i<limit; i++) { Divisors = FindDivisors(i); if (i==Divisors.Sum()) PerfectNumbers.Add(i); } Console.Write("Output ="); for (int i=0; i<PerfectNumbers.Count; i++) { Console.Write(" {0} ",PerfectNumbers[i]); } Console.Write("\n\n\nPress any key to continue . . . "); Console.ReadKey(true); } } }

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  • Unexpected result in C algebra for search algorithm.

    - by Rhys
    Hi, I've implemented this search algorithm for an ordered array of integers. It works fine for the first data set I feed it (500 integers), but fails on longer searches. However, all of the sets work perfectly with the other four search algorithms I've implemented for the assignment. This is the function that returns a seg fault on line 178 (due to an unexpected negative m value). Any help would be greatly appreciated. CODE: 155 /* perform Algortihm 'InterPolationSearch' on the set 156 * and if 'key' is found in the set return it's index 157 * otherwise return -1 */ 158 int 159 interpolation_search(int *set, int len, int key) 160 { 161 int l = 0; 162 int r = len - 1; 163 int m; 164 165 while (set[l] < key && set[r] >= key) 166 { 167 168 printf ("m = l + ((key - set[l]) * (r - l)) / (set[r] - set[l])\n"); 169 170 printf ("m = %d + ((%d - %d) * (%d - %d)) / (%d - %d);\n", l, key, set[l], r, l, set[r], set[l]); 171 m = l + ((key - set[l]) * (r - l)) / (set[r] - set[l]); 172 printf ("m = %d\n", m); 173 174 #ifdef COUNT_COMPARES 175 g_compares++; 176 #endif 177 178 if (set[m] < key) 179 l = m + 1; 180 else if (set[m] > key) 181 r = m - 1; 182 else 183 return m; 184 } 185 186 if (set[l] == key) 187 return l; 188 else 189 return -1; 190 } OUTPUT: m = l + ((key - set[l]) * (r - l)) / (set[r] - set[l]) m = 0 + ((68816 - 0) * (100000 - 0)) / (114836 - 0); m = -14876 Thankyou! Rhys

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  • Plot in GNU PLOT

    - by guddi
    I have to plot many lines in GNU PLOT.No problem with the X axis. The problem that I am facing is that most of the plotted lines are at yscale [0-0.05] ,few at range 60-70 and rest at 600-700. These numbers correspond to the y axis scale values. But after I plot I can see only 3 sets of lines all messed up. There is no clearity between the lines. Line at 0 and the line at 0.003 look like one single line. If I set yrange[0:0.05], the lines between this range are clearly vissible. But I want all the lines in the same graph. I have heard of breaking axis's and multi plotting..Can they be useful? how to implement them. Anyone pls help me. Below is the sript set terminal png size 1300,1200 enhanced font 'Verdana,20 set output ' output .png’ set key font 'Verdana,16' set key bottom outside set yrange[500:1000] set xtics("25k" 25000,"50k" 50000,"75k" 75000,"100k" 100000) set grid set title 'Performance Metrics' set ylabel 'Metrices' set xlabel 'FES' plot ' input ' using 1:2 title ' A' with linespoints linewidth 4, ' input ' using 1:3 title B'with linespoints linewidth 4, 'input ' using 1:4 title ' c' with linespoints linewidth 4, 'input ' using 1:5 title 'D' with linespoints linewidth 4, ' input ' using 1:6 title 'E' with linespoints linewidth 4, ' input ' using 1:7 title 'F' with linespoints linewidth 4, ' input ' using 1:8 title 'G' with linespoints linewidth 4, ' input ' using 1:9 title ' H ' with linespoints linewidth 4, ' input ' using 1:10 title ' I' Metric ' with linespoints linewidth 4 set output set terminal windows input.dat is something like this: 25 0.002 0.05 899 455 444 0.08 0.00004 900 700 0.003 This way i have other rows. I have shown only the first one

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  • oracle pl/sql bug: can't put_line more than 2000 characters

    - by FrustratedWithFormsDesigner
    Has anyone else noticed this phenomenon where dbms_output.put_line is unable to print more than 2000 characters at a time? Script is: set serveroutput on size 100000; declare big_str varchar2(2009); begin for i in 1..2009 loop big_str := big_str||'x'; end loop; dbms_output.put_line(length(big_str)); dbms_output.put_line(big_str); end; / I copied and pasted the output into an editor (Notepad++) which told me there were only 2000 characters, not 2009 which is what I think should have been pasted. This also happens with a few of my test scripts - only 2000 characters get printed. I have a workaround to print like this: dbms_output.put_line(length(big_str)); dbms_output.put_line(substr(big_str,1,1999)); dbms_output.put_line(substr(big_str,2000)); This adds new lines to the output, makes it hard to read when the text you're working with is preformatted. Has anyone else noticed this? Is it really a bug or some sort of obscure feature? Is there a better workaround? Is there any other information on this out there? Oracle version is: 10.2.0.3.0, using PL/SQL Developer (from Allround Automation).

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  • Using datetime float representation as primary key

    - by devanalyst
    From my experience I have learn that using an surrogate INT data type column as primary key esp. an IDENTITY key column offers better performance than using GUID or char/varchar data type column as primary key. I try to use IDENTITY key as primary key wherever possible. But recently I came across a schema where the tables were horizontally partitioned and were managed via a Partitioned view. So the tables could not have an IDENTITY column since that would make the Partitioned View non updatable. One work around for this was to create a dummy 'keygenerator' table with an identity column to generate IDs for primary key. But this would mean having a 'keygenerator' table for each of the Partitioned View. My next thought was to use float as a primary key. The reason is the following key algorithm that I devised DECLARE @KEY FLOAT SET @KEY = CONVERT(FLOAT,GETDATE())/100000.0 SET @KEY = @EMP_ID + @KEY Heres how it works. CONVERT(FLOAT,GETDATE()) gives float representation of current datetime since internally all datetime are represented by SQL as a float value. CONVERT(FLOAT,GETDATE())/100000.0 converts the float representation into complete decimal value i.e. all digits are pushed to right side of ".". @KEY = @EMP_ID + @KEY adds the Employee ID which is an integer to this decimal value. The logic is that the Employee ID is guaranteed to be unique across sessions since an employee cannot connect to an application more than once at the same time. And for the same employee each time a key will be generated the current datetime will be unique. In all an unique key across all employee sessions and across time. So for Emp Ids 11 and 12, I have key values like 12.40046693321566357, 11.40046693542361111 But my concern whether float data type as primary key offer benefits compared to choosing GUID or char/varchar as primary keys. Also important thing is because of partitioning the float column is going to be part of a composite key.

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  • Disable second dropdown menu before first is populated

    - by johnny-kessel
    I need to grey out the second jump box (Select a Subcategory) before the first (Choose a Category) has a valid selection ..Here is the current code.. thanks guys <script type="text/javascript"> \$j(document).ready(function() { \$j('.subf_dropdown').html($j('.subf_dropdown').html()); }); function chooseForum(f, name) { \$j.ajax({ url: 'index.php?autocom=cats&root=' + f, type: 'GET', timeout: 100000, error: function(){ alert('Oops something went wrong. Please try again'); }, success: function(xml){ \$j('.subf_dropdown').html("<optgroup label='Subcategories'> " + xml + " </optgroup>"); } }); } function newPostInForum(f) { if (f != "") { window.location = "http://www.xxx.co.za/?act=post&do=new_post&f=" + f; } } </script> <select name='f' class='f_dropdown' onchange="chooseForum(this.value, this); return false;"> <optgroup label="Choose a Category"> {$data} </optgroup> </select> <br /><br /> <select name='subf' class='subf_dropdown' onchange="newPostInForum(this.value); return false;"> <optgroup label="Subcategories"> <option value="" selected="selected">Select a Subcategory</option> </optgroup> </select>

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  • Weblogic 10.3.0 : Loosing a stateless session bean in the bean pool

    - by KlasE
    Hi, We have a strange situation where we loose a Stateless SessionBean in a Bean Pool in Weblogic 10.3.0 Since we only have one bean in the pool, this effectively hangs all incoming calls. We do not want more than one instance in the pool because of application restrictions. In the Weblogic admin console, we can see that there are 1 instance in the bean pool, 0 beans in use and 1 waiting incoming request. The question is, what can have caused the system to not send the request to the one obviously free bean instance? This happens after several hours and over 100000 incoming requests, and the same scenario worked fine in the old weblogic 8 environment. We get the following stacktrace: "[ACTIVE] ExecuteThread: '5' for queue: 'weblogic.kernel.Default (self-tuning)'" waiting for lock java.util.concurrent.locks.AbstractQueuedSynchronizer$ConditionObject@b0d484 TIMED_WAITING sun.misc.Unsafe.park(Native Method) java.util.concurrent.locks.LockSupport.parkNanos(LockSupport.java:198) java.util.concurrent.locks.AbstractQueuedSynchronizer$ConditionObject.await(AbstractQueuedSynchronizer.java:2054) weblogic.ejb.container.pool.StatelessSessionPool.waitForBean(StatelessSessionPool.java:269) weblogic.ejb.container.pool.StatelessSessionPool.getBean(StatelessSessionPool.java:111) weblogic.ejb.container.manager.StatelessManager.preInvoke(StatelessManager.java:148) weblogic.ejb.container.internal.BaseRemoteObject.preInvoke(BaseRemoteObject.java:227) weblogic.ejb.container.internal.StatelessRemoteObject.preInvoke(StatelessRemoteObject.java:52) com.mycompany.beans.MessageLogFacace_n73y0z_EOImpl.isMyStuffValid(MessageLogFacace_n73y0z_EOImpl.java:261) com.mycompany.beans.MessageLogFacace_n73y0z_EOImpl_WLSkel.invoke(Unknown Source) weblogic.rmi.internal.BasicServerRef.invoke(BasicServerRef.java:589) weblogic.rmi.cluster.ClusterableServerRef.invoke(ClusterableServerRef.java:230) weblogic.rmi.internal.BasicServerRef$1.run(BasicServerRef.java:477) weblogic.security.acl.internal.AuthenticatedSubject.doAs(AuthenticatedSubject.java:363) weblogic.security.service.SecurityManager.runAs(Unknown Source) weblogic.rmi.internal.BasicServerRef.handleRequest(BasicServerRef.java:473) weblogic.rmi.internal.wls.WLSExecuteRequest.run(WLSExecuteRequest.java:118) weblogic.work.ExecuteThread.execute(ExecuteThread.java:201) weblogic.work.ExecuteThread.run(ExecuteThread.java:173) Any help would be very welcome. Regards Klas

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  • change custom mapping - sharp architecture/ fluent nhibernate

    - by csetzkorn
    I am using the sharp architecture which also deploys FNH. The db schema sql code is generated during the testing like this: [TestFixture] [Category("DB Tests")] public class MappingIntegrationTests { [SetUp] public virtual void SetUp() { string[] mappingAssemblies = RepositoryTestsHelper.GetMappingAssemblies(); configuration = NHibernateSession.Init( new SimpleSessionStorage(), mappingAssemblies, new AutoPersistenceModelGenerator().Generate(), "../../../../app/XXX.Web/NHibernate.config"); } [TearDown] public virtual void TearDown() { NHibernateSession.CloseAllSessions(); NHibernateSession.Reset(); } [Test] public void CanConfirmDatabaseMatchesMappings() { var allClassMetadata = NHibernateSession.GetDefaultSessionFactory().GetAllClassMetadata(); foreach (var entry in allClassMetadata) { NHibernateSession.Current.CreateCriteria(entry.Value.GetMappedClass(EntityMode.Poco)) .SetMaxResults(0).List(); } } /// <summary> /// Generates and outputs the database schema SQL to the console /// </summary> [Test] public void CanGenerateDatabaseSchema() { System.IO.TextWriter writeFile = new StreamWriter(@"d:/XXXSqlCreate.sql"); var session = NHibernateSession.GetDefaultSessionFactory().OpenSession(); new SchemaExport(configuration).Execute(true, false, false, session.Connection, writeFile); } private Configuration configuration; } I am trying to use: using FluentNHibernate.Automapping; using xxx.Core; using SharpArch.Data.NHibernate.FluentNHibernate; using FluentNHibernate.Automapping.Alterations; namespace xxx.Data.NHibernateMaps { public class x : IAutoMappingOverride<x> { public void Override(AutoMapping<Tx> mapping) { mapping.Map(x => x.text, "text").CustomSqlType("varchar(max)"); mapping.Map(x => x.url, "url").CustomSqlType("varchar(max)"); } } } To change the standard mapping of strings from NVARCHAR(255) to varchar(max). This is not picked up during the sql schema generation. I also tried: mapping.Map(x = x.text, "text").Length(100000); Any ideas? Thanks. Christian

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  • Are there some cases where Python threads can safely manipulate shared state?

    - by erikg
    Some discussion in another question has encouraged me to to better understand cases where locking is required in multithreaded Python programs. Per this article on threading in Python, I have several solid, testable examples of pitfalls that can occur when multiple threads access shared state. The example race condition provided on this page involves races between threads reading and manipulating a shared variable stored in a dictionary. I think the case for a race here is very obvious, and fortunately is eminently testable. However, I have been unable to evoke a race condition with atomic operations such as list appends or variable increments. This test exhaustively attempts to demonstrate such a race: from threading import Thread, Lock import operator def contains_all_ints(l, n): l.sort() for i in xrange(0, n): if l[i] != i: return False return True def test(ntests): results = [] threads = [] def lockless_append(i): results.append(i) for i in xrange(0, ntests): threads.append(Thread(target=lockless_append, args=(i,))) threads[i].start() for i in xrange(0, ntests): threads[i].join() if len(results) != ntests or not contains_all_ints(results, ntests): return False else: return True for i in range(0,100): if test(100000): print "OK", i else: print "appending to a list without locks *is* unsafe" exit() I have run the test above without failure (100x 100k multithreaded appends). Can anyone get it to fail? Is there another class of object which can be made to misbehave via atomic, incremental, modification by threads? Do these implicitly 'atomic' semantics apply to other operations in Python? Is this directly related to the GIL?

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  • Project Euler (P14): recursion problems

    - by sean mcdaid
    Hi I'm doing the Collatz sequence problem in project Euler (problem 14). My code works with numbers below 100000 but with numbers bigger I get stack over-flow error. Is there a way I can re-factor the code to use tail recursion, or prevent the stack overflow. The code is below: import java.util.*; public class v4 { // use a HashMap to store computed number, and chain size static HashMap<Integer, Integer> hm = new HashMap<Integer, Integer>(); public static void main(String[] args) { hm.put(1, 1); final int CEILING_MAX=Integer.parseInt(args[0]); int len=1; int max_count=1; int max_seed=1; for(int i=2; i<CEILING_MAX; i++) { len = seqCount(i); if(len > max_count) { max_count = len; max_seed = i; } } System.out.println(max_seed+"\t"+max_count); } // find the size of the hailstone sequence for N public static int seqCount(int n) { if(hm.get(n) != null) { return hm.get(n); } if(n ==1) { return 1; } else { int length = 1 + seqCount(nextSeq(n)); hm.put(n, length); return length; } } // Find the next element in the sequence public static int nextSeq(int n) { if(n%2 == 0) { return n/2; } else { return n*3+1; } } }

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  • Java Performance measurement

    - by portoalet
    Hi, I am doing some Java performance comparison between my classes, and wondering if there is some sort of Java Performance Framework to make writing performance measurement code easier? I.e, what I am doing now is trying to measure what effect does it have having a method as "synchronized" as in PseudoRandomUsingSynch.nextInt() compared to using an AtomicInteger as my "synchronizer". So I am trying to measure how long it takes to generate random integers using 3 threads accessing a synchronized method looping for say 10000 times. I am sure there is a much better way doing this. Can you please enlighten me? :) public static void main( String [] args ) throws InterruptedException, ExecutionException { PseudoRandomUsingSynch rand1 = new PseudoRandomUsingSynch((int)System.currentTimeMillis()); int n = 3; ExecutorService execService = Executors.newFixedThreadPool(n); long timeBefore = System.currentTimeMillis(); for(int idx=0; idx<100000; ++idx) { Future<Integer> future = execService.submit(rand1); Future<Integer> future1 = execService.submit(rand1); Future<Integer> future2 = execService.submit(rand1); int random1 = future.get(); int random2 = future1.get(); int random3 = future2.get(); } long timeAfter = System.currentTimeMillis(); long elapsed = timeAfter - timeBefore; out.println("elapsed:" + elapsed); } the class public class PseudoRandomUsingSynch implements Callable<Integer> { private int seed; public PseudoRandomUsingSynch(int s) { seed = s; } public synchronized int nextInt(int n) { byte [] s = DonsUtil.intToByteArray(seed); SecureRandom secureRandom = new SecureRandom(s); return ( secureRandom.nextInt() % n ); } @Override public Integer call() throws Exception { return nextInt((int)System.currentTimeMillis()); } } Regards

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